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1 \documentclass[a4paper,12pt]{article} |
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2 \usepackage[T1]{fontenc} |
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3 \usepackage{amsmath} |
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4 \usepackage{amssymb} |
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5 \usepackage[french,english]{babel} |
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6 \usepackage{color} |
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7 \usepackage{graphicx} |
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8 %\usepackage{mathpazo} |
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9 \usepackage{multicol} |
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10 \usepackage{stmaryrd} |
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11 %\usepackage[scaled=.85]{beramono} |
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12 \usepackage{../iman,../pdfsetup} |
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13 |
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14 %\oddsidemargin=4.6mm |
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15 %\evensidemargin=4.6mm |
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16 %\textwidth=150mm |
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17 %\topmargin=4.6mm |
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18 %\headheight=0mm |
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19 %\headsep=0mm |
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20 %\textheight=234mm |
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21 |
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22 \def\Colon{\mathord{:\mkern-1.5mu:}} |
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23 %\def\lbrakk{\mathopen{\lbrack\mkern-3.25mu\lbrack}} |
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24 %\def\rbrakk{\mathclose{\rbrack\mkern-3.255mu\rbrack}} |
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25 \def\lparr{\mathopen{(\mkern-4mu\mid}} |
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26 \def\rparr{\mathclose{\mid\mkern-4mu)}} |
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27 |
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28 \def\undef{\textit{undefined}} |
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29 \def\unk{{?}} |
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30 %\def\unr{\textit{others}} |
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31 \def\unr{\ldots} |
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32 \def\Abs#1{\hbox{\rm{\flqq}}{\,#1\,}\hbox{\rm{\frqq}}} |
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33 \def\Q{{\smash{\lower.2ex\hbox{$\scriptstyle?$}}}} |
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34 |
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35 \hyphenation{Mini-Sat size-change First-Steps grand-parent nit-pick |
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36 counter-example counter-examples data-type data-types co-data-type |
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37 co-data-types in-duc-tive co-in-duc-tive} |
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38 |
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39 \urlstyle{tt} |
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40 |
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41 \begin{document} |
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42 |
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43 \title{\includegraphics[scale=0.5]{isabelle_nitpick} \\[4ex] |
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44 Picking Nits \\[\smallskipamount] |
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45 \Large A User's Guide to Nitpick for Isabelle/HOL 2010} |
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46 \author{\hbox{} \\ |
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47 Jasmin Christian Blanchette \\ |
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48 {\normalsize Fakult\"at f\"ur Informatik, Technische Universit\"at M\"unchen} \\ |
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49 \hbox{}} |
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50 |
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51 \maketitle |
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52 |
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53 \tableofcontents |
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54 |
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55 \setlength{\parskip}{.7em plus .2em minus .1em} |
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56 \setlength{\parindent}{0pt} |
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57 \setlength{\abovedisplayskip}{\parskip} |
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58 \setlength{\abovedisplayshortskip}{.9\parskip} |
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59 \setlength{\belowdisplayskip}{\parskip} |
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60 \setlength{\belowdisplayshortskip}{.9\parskip} |
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61 |
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62 % General-purpose enum environment with correct spacing |
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63 \newenvironment{enum}% |
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64 {\begin{list}{}{% |
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65 \setlength{\topsep}{.1\parskip}% |
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66 \setlength{\partopsep}{.1\parskip}% |
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67 \setlength{\itemsep}{\parskip}% |
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68 \advance\itemsep by-\parsep}} |
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69 {\end{list}} |
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70 |
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71 \def\pre{\begingroup\vskip0pt plus1ex\advance\leftskip by\leftmargin |
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72 \advance\rightskip by\leftmargin} |
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73 \def\post{\vskip0pt plus1ex\endgroup} |
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74 |
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75 \def\prew{\pre\advance\rightskip by-\leftmargin} |
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76 \def\postw{\post} |
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77 |
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78 \section{Introduction} |
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79 \label{introduction} |
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80 |
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81 Nitpick \cite{blanchette-nipkow-2009} is a counterexample generator for |
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82 Isabelle/HOL \cite{isa-tutorial} that is designed to handle formulas |
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83 combining (co)in\-duc\-tive datatypes, (co)in\-duc\-tively defined predicates, and |
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84 quantifiers. It builds on Kodkod \cite{torlak-jackson-2007}, a highly optimized |
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85 first-order relational model finder developed by the Software Design Group at |
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86 MIT. It is conceptually similar to Refute \cite{weber-2008}, from which it |
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87 borrows many ideas and code fragments, but it benefits from Kodkod's |
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88 optimizations and a new encoding scheme. The name Nitpick is shamelessly |
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89 appropriated from a now retired Alloy precursor. |
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90 |
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91 Nitpick is easy to use---you simply enter \textbf{nitpick} after a putative |
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92 theorem and wait a few seconds. Nonetheless, there are situations where knowing |
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93 how it works under the hood and how it reacts to various options helps |
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94 increase the test coverage. This manual also explains how to install the tool on |
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95 your workstation. Should the motivation fail you, think of the many hours of |
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96 hard work Nitpick will save you. Proving non-theorems is \textsl{hard work}. |
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97 |
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98 Another common use of Nitpick is to find out whether the axioms of a locale are |
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99 satisfiable, while the locale is being developed. To check this, it suffices to |
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100 write |
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101 |
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102 \prew |
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103 \textbf{lemma}~``$\textit{False}$'' \\ |
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104 \textbf{nitpick}~[\textit{show\_all}] |
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105 \postw |
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106 |
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107 after the locale's \textbf{begin} keyword. To falsify \textit{False}, Nitpick |
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108 must find a model for the axioms. If it finds no model, we have an indication |
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109 that the axioms might be unsatisfiable. |
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110 |
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111 \newbox\boxA |
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112 \setbox\boxA=\hbox{\texttt{nospam}} |
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113 |
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114 The known bugs and limitations at the time of writing are listed in |
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115 \S\ref{known-bugs-and-limitations}. Comments and bug reports concerning Nitpick |
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116 or this manual should be directed to |
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117 \texttt{blan{\color{white}nospam}\kern-\wd\boxA{}chette@\allowbreak |
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118 in.\allowbreak tum.\allowbreak de}. |
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119 |
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120 \vskip2.5\smallskipamount |
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121 |
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122 \textbf{Acknowledgment.} The author would like to thank Mark Summerfield for |
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123 suggesting several textual improvements. |
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124 % and Perry James for reporting a typo. |
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125 |
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126 \section{First Steps} |
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127 \label{first-steps} |
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128 |
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129 This section introduces Nitpick by presenting small examples. If possible, you |
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130 should try out the examples on your workstation. Your theory file should start |
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131 the standard way: |
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132 |
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133 \prew |
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134 \textbf{theory}~\textit{Scratch} \\ |
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135 \textbf{imports}~\textit{Main} \\ |
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136 \textbf{begin} |
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137 \postw |
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138 |
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139 The results presented here were obtained using the JNI version of MiniSat and |
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140 with multithreading disabled to reduce nondeterminism. This was done by adding |
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141 the line |
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142 |
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143 \prew |
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144 \textbf{nitpick\_params} [\textit{sat\_solver}~= \textit{MiniSatJNI}, \,\textit{max\_threads}~= 1] |
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145 \postw |
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146 |
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147 after the \textbf{begin} keyword. The JNI version of MiniSat is bundled with |
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148 Kodkodi and is precompiled for the major platforms. Other SAT solvers can also |
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149 be installed, as explained in \S\ref{optimizations}. If you have already |
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150 configured SAT solvers in Isabelle (e.g., for Refute), these will also be |
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151 available to Nitpick. |
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152 |
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153 Throughout this manual, we will explicitly invoke the \textbf{nitpick} command. |
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154 Nitpick also provides an automatic mode that can be enabled by specifying |
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155 |
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156 \prew |
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157 \textbf{nitpick\_params} [\textit{auto}] |
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158 \postw |
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159 |
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160 at the beginning of the theory file. In this mode, Nitpick is run for up to 5 |
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161 seconds (by default) on every newly entered theorem, much like Auto Quickcheck. |
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162 |
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163 \subsection{Propositional Logic} |
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164 \label{propositional-logic} |
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165 |
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166 Let's start with a trivial example from propositional logic: |
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167 |
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168 \prew |
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169 \textbf{lemma}~``$P \longleftrightarrow Q$'' \\ |
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170 \textbf{nitpick} |
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171 \postw |
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172 |
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173 You should get the following output: |
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174 |
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175 \prew |
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176 \slshape |
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177 Nitpick found a counterexample: \\[2\smallskipamount] |
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178 \hbox{}\qquad Free variables: \nopagebreak \\ |
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179 \hbox{}\qquad\qquad $P = \textit{True}$ \\ |
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180 \hbox{}\qquad\qquad $Q = \textit{False}$ |
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181 \postw |
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182 |
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183 Nitpick can also be invoked on individual subgoals, as in the example below: |
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184 |
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185 \prew |
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186 \textbf{apply}~\textit{auto} \\[2\smallskipamount] |
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187 {\slshape goal (2 subgoals): \\ |
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188 \ 1. $P\,\Longrightarrow\, Q$ \\ |
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189 \ 2. $Q\,\Longrightarrow\, P$} \\[2\smallskipamount] |
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190 \textbf{nitpick}~1 \\[2\smallskipamount] |
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191 {\slshape Nitpick found a counterexample: \\[2\smallskipamount] |
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192 \hbox{}\qquad Free variables: \nopagebreak \\ |
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193 \hbox{}\qquad\qquad $P = \textit{True}$ \\ |
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194 \hbox{}\qquad\qquad $Q = \textit{False}$} \\[2\smallskipamount] |
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195 \textbf{nitpick}~2 \\[2\smallskipamount] |
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196 {\slshape Nitpick found a counterexample: \\[2\smallskipamount] |
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197 \hbox{}\qquad Free variables: \nopagebreak \\ |
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198 \hbox{}\qquad\qquad $P = \textit{False}$ \\ |
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199 \hbox{}\qquad\qquad $Q = \textit{True}$} \\[2\smallskipamount] |
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200 \textbf{oops} |
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201 \postw |
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202 |
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203 \subsection{Type Variables} |
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204 \label{type-variables} |
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205 |
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206 If you are left unimpressed by the previous example, don't worry. The next |
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207 one is more mind- and computer-boggling: |
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208 |
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209 \prew |
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210 \textbf{lemma} ``$P~x\,\Longrightarrow\, P~(\textrm{THE}~y.\;P~y)$'' |
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211 \postw |
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212 \pagebreak[2] %% TYPESETTING |
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213 |
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214 The putative lemma involves the definite description operator, {THE}, presented |
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215 in section 5.10.1 of the Isabelle tutorial \cite{isa-tutorial}. The |
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216 operator is defined by the axiom $(\textrm{THE}~x.\; x = a) = a$. The putative |
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217 lemma is merely asserting the indefinite description operator axiom with {THE} |
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218 substituted for {SOME}. |
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219 |
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220 The free variable $x$ and the bound variable $y$ have type $'a$. For formulas |
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221 containing type variables, Nitpick enumerates the possible domains for each type |
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222 variable, up to a given cardinality (8 by default), looking for a finite |
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223 countermodel: |
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224 |
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225 \prew |
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226 \textbf{nitpick} [\textit{verbose}] \\[2\smallskipamount] |
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227 \slshape |
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228 Trying 8 scopes: \nopagebreak \\ |
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229 \hbox{}\qquad \textit{card}~$'a$~= 1; \\ |
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230 \hbox{}\qquad \textit{card}~$'a$~= 2; \\ |
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231 \hbox{}\qquad $\qquad\vdots$ \\[.5\smallskipamount] |
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232 \hbox{}\qquad \textit{card}~$'a$~= 8. \\[2\smallskipamount] |
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233 Nitpick found a counterexample for \textit{card} $'a$~= 3: \\[2\smallskipamount] |
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234 \hbox{}\qquad Free variables: \nopagebreak \\ |
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235 \hbox{}\qquad\qquad $P = \{a_2,\, a_3\}$ \\ |
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236 \hbox{}\qquad\qquad $x = a_3$ \\[2\smallskipamount] |
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237 Total time: 580 ms. |
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238 \postw |
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239 |
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240 Nitpick found a counterexample in which $'a$ has cardinality 3. (For |
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241 cardinalities 1 and 2, the formula holds.) In the counterexample, the three |
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242 values of type $'a$ are written $a_1$, $a_2$, and $a_3$. |
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243 |
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244 The message ``Trying $n$ scopes: {\ldots}''\ is shown only if the option |
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245 \textit{verbose} is enabled. You can specify \textit{verbose} each time you |
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246 invoke \textbf{nitpick}, or you can set it globally using the command |
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247 |
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248 \prew |
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249 \textbf{nitpick\_params} [\textit{verbose}] |
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250 \postw |
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251 |
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252 This command also displays the current default values for all of the options |
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253 supported by Nitpick. The options are listed in \S\ref{option-reference}. |
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254 |
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255 \subsection{Constants} |
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256 \label{constants} |
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257 |
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258 By just looking at Nitpick's output, it might not be clear why the |
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259 counterexample in \S\ref{type-variables} is genuine. Let's invoke Nitpick again, |
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260 this time telling it to show the values of the constants that occur in the |
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261 formula: |
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262 |
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263 \prew |
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264 \textbf{lemma}~``$P~x\,\Longrightarrow\, P~(\textrm{THE}~y.\;P~y)$'' \\ |
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265 \textbf{nitpick}~[\textit{show\_consts}] \\[2\smallskipamount] |
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266 \slshape |
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267 Nitpick found a counterexample for \textit{card} $'a$~= 3: \\[2\smallskipamount] |
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268 \hbox{}\qquad Free variables: \nopagebreak \\ |
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269 \hbox{}\qquad\qquad $P = \{a_2,\, a_3\}$ \\ |
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270 \hbox{}\qquad\qquad $x = a_3$ \\ |
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271 \hbox{}\qquad Constant: \nopagebreak \\ |
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272 \hbox{}\qquad\qquad $\textit{The}~\textsl{fallback} = a_1$ |
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273 \postw |
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274 |
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275 We can see more clearly now. Since the predicate $P$ isn't true for a unique |
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276 value, $\textrm{THE}~y.\;P~y$ can denote any value of type $'a$, even |
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277 $a_1$. Since $P~a_1$ is false, the entire formula is falsified. |
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278 |
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279 As an optimization, Nitpick's preprocessor introduced the special constant |
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280 ``\textit{The} fallback'' corresponding to $\textrm{THE}~y.\;P~y$ (i.e., |
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281 $\mathit{The}~(\lambda y.\;P~y)$) when there doesn't exist a unique $y$ |
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282 satisfying $P~y$. We disable this optimization by passing the |
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283 \textit{full\_descrs} option: |
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284 |
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285 \prew |
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286 \textbf{nitpick}~[\textit{full\_descrs},\, \textit{show\_consts}] \\[2\smallskipamount] |
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287 \slshape |
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288 Nitpick found a counterexample for \textit{card} $'a$~= 3: \\[2\smallskipamount] |
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289 \hbox{}\qquad Free variables: \nopagebreak \\ |
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290 \hbox{}\qquad\qquad $P = \{a_2,\, a_3\}$ \\ |
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291 \hbox{}\qquad\qquad $x = a_3$ \\ |
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292 \hbox{}\qquad Constant: \nopagebreak \\ |
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293 \hbox{}\qquad\qquad $\hbox{\slshape THE}~y.\;P~y = a_1$ |
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294 \postw |
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295 |
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296 As the result of another optimization, Nitpick directly assigned a value to the |
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297 subterm $\textrm{THE}~y.\;P~y$, rather than to the \textit{The} constant. If we |
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298 disable this second optimization by using the command |
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299 |
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300 \prew |
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301 \textbf{nitpick}~[\textit{dont\_specialize},\, \textit{full\_descrs},\, |
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302 \textit{show\_consts}] |
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303 \postw |
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304 |
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305 we finally get \textit{The}: |
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306 |
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307 \prew |
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308 \slshape Constant: \nopagebreak \\ |
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309 \hbox{}\qquad $\mathit{The} = \undef{} |
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310 (\!\begin{aligned}[t]% |
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311 & \{\} := a_3,\> \{a_3\} := a_3,\> \{a_2\} := a_2, \\[-2pt] %% TYPESETTING |
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312 & \{a_2, a_3\} := a_1,\> \{a_1\} := a_1,\> \{a_1, a_3\} := a_3, \\[-2pt] |
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313 & \{a_1, a_2\} := a_3,\> \{a_1, a_2, a_3\} := a_3)\end{aligned}$ |
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314 \postw |
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315 |
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316 Notice that $\textit{The}~(\lambda y.\;P~y) = \textit{The}~\{a_2, a_3\} = a_1$, |
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317 just like before.\footnote{The \undef{} symbol's presence is explained as |
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318 follows: In higher-order logic, any function can be built from the undefined |
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319 function using repeated applications of the function update operator $f(x := |
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320 y)$, just like any list can be built from the empty list using $x \mathbin{\#} |
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321 xs$.} |
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322 |
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323 Our misadventures with THE suggest adding `$\exists!x{.}$' (``there exists a |
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324 unique $x$ such that'') at the front of our putative lemma's assumption: |
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325 |
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326 \prew |
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327 \textbf{lemma}~``$\exists {!}x.\; P~x\,\Longrightarrow\, P~(\textrm{THE}~y.\;P~y)$'' |
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328 \postw |
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329 |
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330 The fix appears to work: |
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331 |
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332 \prew |
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333 \textbf{nitpick} \\[2\smallskipamount] |
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334 \slshape Nitpick found no counterexample. |
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335 \postw |
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336 |
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337 We can further increase our confidence in the formula by exhausting all |
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338 cardinalities up to 50: |
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339 |
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340 \prew |
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341 \textbf{nitpick} [\textit{card} $'a$~= 1--50]\footnote{The symbol `--' |
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342 can be entered as \texttt{-} (hyphen) or |
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343 \texttt{\char`\\\char`\<midarrow\char`\>}.} \\[2\smallskipamount] |
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344 \slshape Nitpick found no counterexample. |
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345 \postw |
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346 |
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347 Let's see if Sledgehammer \cite{sledgehammer-2009} can find a proof: |
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348 |
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349 \prew |
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350 \textbf{sledgehammer} \\[2\smallskipamount] |
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351 {\slshape Sledgehammer: external prover ``$e$'' for subgoal 1: \\ |
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352 $\exists{!}x.\; P~x\,\Longrightarrow\, P~(\hbox{\slshape THE}~y.\; P~y)$ \\ |
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353 Try this command: \textrm{apply}~(\textit{metis~the\_equality})} \\[2\smallskipamount] |
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354 \textbf{apply}~(\textit{metis~the\_equality\/}) \nopagebreak \\[2\smallskipamount] |
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355 {\slshape No subgoals!}% \\[2\smallskipamount] |
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356 %\textbf{done} |
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357 \postw |
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358 |
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359 This must be our lucky day. |
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360 |
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361 \subsection{Skolemization} |
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362 \label{skolemization} |
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363 |
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364 Are all invertible functions onto? Let's find out: |
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365 |
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366 \prew |
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367 \textbf{lemma} ``$\exists g.\; \forall x.~g~(f~x) = x |
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368 \,\Longrightarrow\, \forall y.\; \exists x.~y = f~x$'' \\ |
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369 \textbf{nitpick} \\[2\smallskipamount] |
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370 \slshape |
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371 Nitpick found a counterexample for \textit{card} $'a$~= 2 and \textit{card} $'b$~=~1: \\[2\smallskipamount] |
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372 \hbox{}\qquad Free variable: \nopagebreak \\ |
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373 \hbox{}\qquad\qquad $f = \undef{}(b_1 := a_1)$ \\ |
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374 \hbox{}\qquad Skolem constants: \nopagebreak \\ |
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375 \hbox{}\qquad\qquad $g = \undef{}(a_1 := b_1,\> a_2 := b_1)$ \\ |
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376 \hbox{}\qquad\qquad $y = a_2$ |
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377 \postw |
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378 |
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379 Although $f$ is the only free variable occurring in the formula, Nitpick also |
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380 displays values for the bound variables $g$ and $y$. These values are available |
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381 to Nitpick because it performs skolemization as a preprocessing step. |
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382 |
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383 In the previous example, skolemization only affected the outermost quantifiers. |
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384 This is not always the case, as illustrated below: |
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385 |
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386 \prew |
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387 \textbf{lemma} ``$\exists x.\; \forall f.\; f~x = x$'' \\ |
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388 \textbf{nitpick} \\[2\smallskipamount] |
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389 \slshape |
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390 Nitpick found a counterexample for \textit{card} $'a$~= 2: \\[2\smallskipamount] |
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391 \hbox{}\qquad Skolem constant: \nopagebreak \\ |
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392 \hbox{}\qquad\qquad $\lambda x.\; f = |
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393 \undef{}(\!\begin{aligned}[t] |
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394 & a_1 := \undef{}(a_1 := a_2,\> a_2 := a_1), \\[-2pt] |
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395 & a_2 := \undef{}(a_1 := a_1,\> a_2 := a_1))\end{aligned}$ |
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396 \postw |
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397 |
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398 The variable $f$ is bound within the scope of $x$; therefore, $f$ depends on |
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399 $x$, as suggested by the notation $\lambda x.\,f$. If $x = a_1$, then $f$ is the |
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400 function that maps $a_1$ to $a_2$ and vice versa; otherwise, $x = a_2$ and $f$ |
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401 maps both $a_1$ and $a_2$ to $a_1$. In both cases, $f~x \not= x$. |
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402 |
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403 The source of the Skolem constants is sometimes more obscure: |
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404 |
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405 \prew |
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406 \textbf{lemma} ``$\mathit{refl}~r\,\Longrightarrow\, \mathit{sym}~r$'' \\ |
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407 \textbf{nitpick} \\[2\smallskipamount] |
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408 \slshape |
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409 Nitpick found a counterexample for \textit{card} $'a$~= 2: \\[2\smallskipamount] |
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410 \hbox{}\qquad Free variable: \nopagebreak \\ |
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411 \hbox{}\qquad\qquad $r = \{(a_1, a_1),\, (a_2, a_1),\, (a_2, a_2)\}$ \\ |
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412 \hbox{}\qquad Skolem constants: \nopagebreak \\ |
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413 \hbox{}\qquad\qquad $\mathit{sym}.x = a_2$ \\ |
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414 \hbox{}\qquad\qquad $\mathit{sym}.y = a_1$ |
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415 \postw |
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416 |
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417 What happened here is that Nitpick expanded the \textit{sym} constant to its |
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418 definition: |
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419 |
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420 \prew |
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421 $\mathit{sym}~r \,\equiv\, |
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422 \forall x\> y.\,\> (x, y) \in r \longrightarrow (y, x) \in r.$ |
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423 \postw |
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424 |
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425 As their names suggest, the Skolem constants $\mathit{sym}.x$ and |
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426 $\mathit{sym}.y$ are simply the bound variables $x$ and $y$ |
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427 from \textit{sym}'s definition. |
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428 |
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429 Although skolemization is a useful optimization, you can disable it by invoking |
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430 Nitpick with \textit{dont\_skolemize}. See \S\ref{optimizations} for details. |
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431 |
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432 \subsection{Natural Numbers and Integers} |
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433 \label{natural-numbers-and-integers} |
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434 |
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435 Because of the axiom of infinity, the type \textit{nat} does not admit any |
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436 finite models. To deal with this, Nitpick considers prefixes $\{0,\, 1,\, |
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437 \ldots,\, K - 1\}$ of \textit{nat} (where $K = \textit{card}~\textit{nat}$) and |
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438 maps all other numbers to the undefined value ($\unk$). The type \textit{int} is |
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439 handled in a similar way: If $K = \textit{card}~\textit{int}$, the subset of |
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440 \textit{int} known to Nitpick is $\{-\lceil K/2 \rceil + 1,\, \ldots,\, +\lfloor |
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441 K/2 \rfloor\}$. Undefined values lead to a three-valued logic. |
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442 |
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443 Here is an example involving \textit{int}: |
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444 |
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445 \prew |
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446 \textbf{lemma} ``$\lbrakk i \le j;\> n \le (m{\Colon}\mathit{int})\rbrakk \,\Longrightarrow\, i * n + j * m \le i * m + j * n$'' \\ |
|
447 \textbf{nitpick} \\[2\smallskipamount] |
|
448 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
449 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
450 \hbox{}\qquad\qquad $i = 0$ \\ |
|
451 \hbox{}\qquad\qquad $j = 1$ \\ |
|
452 \hbox{}\qquad\qquad $m = 1$ \\ |
|
453 \hbox{}\qquad\qquad $n = 0$ |
|
454 \postw |
|
455 |
|
456 With infinite types, we don't always have the luxury of a genuine counterexample |
|
457 and must often content ourselves with a potential one. The tedious task of |
|
458 finding out whether the potential counterexample is in fact genuine can be |
|
459 outsourced to \textit{auto} by passing the option \textit{check\_potential}. For |
|
460 example: |
|
461 |
|
462 \prew |
|
463 \textbf{lemma} ``$\forall n.\; \textit{Suc}~n \mathbin{\not=} n \,\Longrightarrow\, P$'' \\ |
|
464 \textbf{nitpick} [\textit{card~nat}~= 100,\, \textit{check\_potential}] \\[2\smallskipamount] |
|
465 \slshape Nitpick found a potential counterexample: \\[2\smallskipamount] |
|
466 \hbox{}\qquad Free variable: \nopagebreak \\ |
|
467 \hbox{}\qquad\qquad $P = \textit{False}$ \\[2\smallskipamount] |
|
468 Confirmation by ``\textit{auto}'': The above counterexample is genuine. |
|
469 \postw |
|
470 |
|
471 You might wonder why the counterexample is first reported as potential. The root |
|
472 of the problem is that the bound variable in $\forall n.\; \textit{Suc}~n |
|
473 \mathbin{\not=} n$ ranges over an infinite type. If Nitpick finds an $n$ such |
|
474 that $\textit{Suc}~n \mathbin{=} n$, it evaluates the assumption to |
|
475 \textit{False}; but otherwise, it does not know anything about values of $n \ge |
|
476 \textit{card~nat}$ and must therefore evaluate the assumption to $\unk$, not |
|
477 \textit{True}. Since the assumption can never be satisfied, the putative lemma |
|
478 can never be falsified. |
|
479 |
|
480 Incidentally, if you distrust the so-called genuine counterexamples, you can |
|
481 enable \textit{check\_\allowbreak genuine} to verify them as well. However, be |
|
482 aware that \textit{auto} will often fail to prove that the counterexample is |
|
483 genuine or spurious. |
|
484 |
|
485 Some conjectures involving elementary number theory make Nitpick look like a |
|
486 giant with feet of clay: |
|
487 |
|
488 \prew |
|
489 \textbf{lemma} ``$P~\textit{Suc}$'' \\ |
|
490 \textbf{nitpick} [\textit{card} = 1--6] \\[2\smallskipamount] |
|
491 \slshape |
|
492 Nitpick found no counterexample. |
|
493 \postw |
|
494 |
|
495 For any cardinality $k$, \textit{Suc} is the partial function $\{0 \mapsto 1,\, |
|
496 1 \mapsto 2,\, \ldots,\, k - 1 \mapsto \unk\}$, which evaluates to $\unk$ when |
|
497 it is passed as argument to $P$. As a result, $P~\textit{Suc}$ is always $\unk$. |
|
498 The next example is similar: |
|
499 |
|
500 \prew |
|
501 \textbf{lemma} ``$P~(\textit{op}~{+}\Colon |
|
502 \textit{nat}\mathbin{\Rightarrow}\textit{nat}\mathbin{\Rightarrow}\textit{nat})$'' \\ |
|
503 \textbf{nitpick} [\textit{card nat} = 1] \\[2\smallskipamount] |
|
504 {\slshape Nitpick found a counterexample:} \\[2\smallskipamount] |
|
505 \hbox{}\qquad Free variable: \nopagebreak \\ |
|
506 \hbox{}\qquad\qquad $P = \{\}$ \\[2\smallskipamount] |
|
507 \textbf{nitpick} [\textit{card nat} = 2] \\[2\smallskipamount] |
|
508 {\slshape Nitpick found no counterexample.} |
|
509 \postw |
|
510 |
|
511 The problem here is that \textit{op}~+ is total when \textit{nat} is taken to be |
|
512 $\{0\}$ but becomes partial as soon as we add $1$, because $1 + 1 \notin \{0, |
|
513 1\}$. |
|
514 |
|
515 Because numbers are infinite and are approximated using a three-valued logic, |
|
516 there is usually no need to systematically enumerate domain sizes. If Nitpick |
|
517 cannot find a genuine counterexample for \textit{card~nat}~= $k$, it is very |
|
518 unlikely that one could be found for smaller domains. (The $P~(\textit{op}~{+})$ |
|
519 example above is an exception to this principle.) Nitpick nonetheless enumerates |
|
520 all cardinalities from 1 to 8 for \textit{nat}, mainly because smaller |
|
521 cardinalities are fast to handle and give rise to simpler counterexamples. This |
|
522 is explained in more detail in \S\ref{scope-monotonicity}. |
|
523 |
|
524 \subsection{Inductive Datatypes} |
|
525 \label{inductive-datatypes} |
|
526 |
|
527 Like natural numbers and integers, inductive datatypes with recursive |
|
528 constructors admit no finite models and must be approximated by a subterm-closed |
|
529 subset. For example, using a cardinality of 10 for ${'}a~\textit{list}$, |
|
530 Nitpick looks for all counterexamples that can be built using at most 10 |
|
531 different lists. |
|
532 |
|
533 Let's see with an example involving \textit{hd} (which returns the first element |
|
534 of a list) and $@$ (which concatenates two lists): |
|
535 |
|
536 \prew |
|
537 \textbf{lemma} ``$\textit{hd}~(\textit{xs} \mathbin{@} [y, y]) = \textit{hd}~\textit{xs}$'' \\ |
|
538 \textbf{nitpick} \\[2\smallskipamount] |
|
539 \slshape Nitpick found a counterexample for \textit{card} $'a$~= 3: \\[2\smallskipamount] |
|
540 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
541 \hbox{}\qquad\qquad $\textit{xs} = []$ \\ |
|
542 \hbox{}\qquad\qquad $\textit{y} = a_3$ |
|
543 \postw |
|
544 |
|
545 To see why the counterexample is genuine, we enable \textit{show\_consts} |
|
546 and \textit{show\_\allowbreak datatypes}: |
|
547 |
|
548 \prew |
|
549 {\slshape Datatype:} \\ |
|
550 \hbox{}\qquad $'a$~\textit{list}~= $\{[],\, [a_3, a_3],\, [a_3],\, \unr\}$ \\ |
|
551 {\slshape Constants:} \\ |
|
552 \hbox{}\qquad $\lambda x_1.\; x_1 \mathbin{@} [y, y] = \undef([] := [a_3, a_3],\> [a_3, a_3] := \unk,\> [a_3] := \unk)$ \\ |
|
553 \hbox{}\qquad $\textit{hd} = \undef([] := a_2,\> [a_3, a_3] := a_3,\> [a_3] := a_3)$ |
|
554 \postw |
|
555 |
|
556 Since $\mathit{hd}~[]$ is undefined in the logic, it may be given any value, |
|
557 including $a_2$. |
|
558 |
|
559 The second constant, $\lambda x_1.\; x_1 \mathbin{@} [y, y]$, is simply the |
|
560 append operator whose second argument is fixed to be $[y, y]$. Appending $[a_3, |
|
561 a_3]$ to $[a_3]$ would normally give $[a_3, a_3, a_3]$, but this value is not |
|
562 representable in the subset of $'a$~\textit{list} considered by Nitpick, which |
|
563 is shown under the ``Datatype'' heading; hence the result is $\unk$. Similarly, |
|
564 appending $[a_3, a_3]$ to itself gives $\unk$. |
|
565 |
|
566 Given \textit{card}~$'a = 3$ and \textit{card}~$'a~\textit{list} = 3$, Nitpick |
|
567 considers the following subsets: |
|
568 |
|
569 \kern-.5\smallskipamount %% TYPESETTING |
|
570 |
|
571 \prew |
|
572 \begin{multicols}{3} |
|
573 $\{[],\, [a_1],\, [a_2]\}$; \\ |
|
574 $\{[],\, [a_1],\, [a_3]\}$; \\ |
|
575 $\{[],\, [a_2],\, [a_3]\}$; \\ |
|
576 $\{[],\, [a_1],\, [a_1, a_1]\}$; \\ |
|
577 $\{[],\, [a_1],\, [a_2, a_1]\}$; \\ |
|
578 $\{[],\, [a_1],\, [a_3, a_1]\}$; \\ |
|
579 $\{[],\, [a_2],\, [a_1, a_2]\}$; \\ |
|
580 $\{[],\, [a_2],\, [a_2, a_2]\}$; \\ |
|
581 $\{[],\, [a_2],\, [a_3, a_2]\}$; \\ |
|
582 $\{[],\, [a_3],\, [a_1, a_3]\}$; \\ |
|
583 $\{[],\, [a_3],\, [a_2, a_3]\}$; \\ |
|
584 $\{[],\, [a_3],\, [a_3, a_3]\}$. |
|
585 \end{multicols} |
|
586 \postw |
|
587 |
|
588 \kern-2\smallskipamount %% TYPESETTING |
|
589 |
|
590 All subterm-closed subsets of $'a~\textit{list}$ consisting of three values |
|
591 are listed and only those. As an example of a non-subterm-closed subset, |
|
592 consider $\mathcal{S} = \{[],\, [a_1],\,\allowbreak [a_1, a_3]\}$, and observe |
|
593 that $[a_1, a_3]$ (i.e., $a_1 \mathbin{\#} [a_3]$) has $[a_3] \notin |
|
594 \mathcal{S}$ as a subterm. |
|
595 |
|
596 Here's another m\"ochtegern-lemma that Nitpick can refute without a blink: |
|
597 |
|
598 \prew |
|
599 \textbf{lemma} ``$\lbrakk \textit{length}~\textit{xs} = 1;\> \textit{length}~\textit{ys} = 1 |
|
600 \rbrakk \,\Longrightarrow\, \textit{xs} = \textit{ys}$'' |
|
601 \\ |
|
602 \textbf{nitpick} [\textit{show\_datatypes}] \\[2\smallskipamount] |
|
603 \slshape Nitpick found a counterexample for \textit{card} $'a$~= 3: \\[2\smallskipamount] |
|
604 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
605 \hbox{}\qquad\qquad $\textit{xs} = [a_2]$ \\ |
|
606 \hbox{}\qquad\qquad $\textit{ys} = [a_3]$ \\ |
|
607 \hbox{}\qquad Datatypes: \\ |
|
608 \hbox{}\qquad\qquad $\textit{nat} = \{0,\, 1,\, 2,\, \unr\}$ \\ |
|
609 \hbox{}\qquad\qquad $'a$~\textit{list} = $\{[],\, [a_3],\, [a_2],\, \unr\}$ |
|
610 \postw |
|
611 |
|
612 Because datatypes are approximated using a three-valued logic, there is usually |
|
613 no need to systematically enumerate cardinalities: If Nitpick cannot find a |
|
614 genuine counterexample for \textit{card}~$'a~\textit{list}$~= 10, it is very |
|
615 unlikely that one could be found for smaller cardinalities. |
|
616 |
|
617 \subsection{Typedefs, Records, Rationals, and Reals} |
|
618 \label{typedefs-records-rationals-and-reals} |
|
619 |
|
620 Nitpick generally treats types declared using \textbf{typedef} as datatypes |
|
621 whose single constructor is the corresponding \textit{Abs\_\kern.1ex} function. |
|
622 For example: |
|
623 |
|
624 \prew |
|
625 \textbf{typedef}~\textit{three} = ``$\{0\Colon\textit{nat},\, 1,\, 2\}$'' \\ |
|
626 \textbf{by}~\textit{blast} \\[2\smallskipamount] |
|
627 \textbf{definition}~$A \mathbin{\Colon} \textit{three}$ \textbf{where} ``\kern-.1em$A \,\equiv\, \textit{Abs\_\allowbreak three}~0$'' \\ |
|
628 \textbf{definition}~$B \mathbin{\Colon} \textit{three}$ \textbf{where} ``$B \,\equiv\, \textit{Abs\_three}~1$'' \\ |
|
629 \textbf{definition}~$C \mathbin{\Colon} \textit{three}$ \textbf{where} ``$C \,\equiv\, \textit{Abs\_three}~2$'' \\[2\smallskipamount] |
|
630 \textbf{lemma} ``$\lbrakk P~A;\> P~B\rbrakk \,\Longrightarrow\, P~x$'' \\ |
|
631 \textbf{nitpick} [\textit{show\_datatypes}] \\[2\smallskipamount] |
|
632 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
633 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
634 \hbox{}\qquad\qquad $P = \{\Abs{1},\, \Abs{0}\}$ \\ |
|
635 \hbox{}\qquad\qquad $x = \Abs{2}$ \\ |
|
636 \hbox{}\qquad Datatypes: \\ |
|
637 \hbox{}\qquad\qquad $\textit{nat} = \{0,\, 1,\, 2,\, \unr\}$ \\ |
|
638 \hbox{}\qquad\qquad $\textit{three} = \{\Abs{2},\, \Abs{1},\, \Abs{0},\, \unr\}$ |
|
639 \postw |
|
640 |
|
641 %% MARK |
|
642 In the output above, $\Abs{n}$ abbreviates $\textit{Abs\_three}~n$. |
|
643 |
|
644 %% MARK |
|
645 Records, which are implemented as \textbf{typedef}s behind the scenes, are |
|
646 handled in much the same way: |
|
647 |
|
648 \prew |
|
649 \textbf{record} \textit{point} = \\ |
|
650 \hbox{}\quad $\textit{Xcoord} \mathbin{\Colon} \textit{int}$ \\ |
|
651 \hbox{}\quad $\textit{Ycoord} \mathbin{\Colon} \textit{int}$ \\[2\smallskipamount] |
|
652 \textbf{lemma} ``$\textit{Xcoord}~(p\Colon\textit{point}) = \textit{Xcoord}~(q\Colon\textit{point})$'' \\ |
|
653 \textbf{nitpick} [\textit{show\_datatypes}] \\[2\smallskipamount] |
|
654 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
655 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
656 \hbox{}\qquad\qquad $p = \lparr\textit{Xcoord} = 0,\> \textit{Ycoord} = 0\rparr$ \\ |
|
657 \hbox{}\qquad\qquad $q = \lparr\textit{Xcoord} = 1,\> \textit{Ycoord} = 1\rparr$ \\ |
|
658 \hbox{}\qquad Datatypes: \\ |
|
659 \hbox{}\qquad\qquad $\textit{int} = \{0,\, 1,\, \unr\}$ \\ |
|
660 \hbox{}\qquad\qquad $\textit{point} = \{\lparr\textit{Xcoord} = 1,\> |
|
661 \textit{Ycoord} = 1\rparr,\> \lparr\textit{Xcoord} = 0,\> \textit{Ycoord} = 0\rparr,\, \unr\}$\kern-1pt %% QUIET |
|
662 \postw |
|
663 |
|
664 Finally, Nitpick provides rudimentary support for rationals and reals using a |
|
665 similar approach: |
|
666 |
|
667 \prew |
|
668 \textbf{lemma} ``$4 * x + 3 * (y\Colon\textit{real}) \not= 1/2$'' \\ |
|
669 \textbf{nitpick} [\textit{show\_datatypes}] \\[2\smallskipamount] |
|
670 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
671 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
672 \hbox{}\qquad\qquad $x = 1/2$ \\ |
|
673 \hbox{}\qquad\qquad $y = -1/2$ \\ |
|
674 \hbox{}\qquad Datatypes: \\ |
|
675 \hbox{}\qquad\qquad $\textit{nat} = \{0,\, 1,\, 2,\, 3,\, 4,\, 5,\, 6,\, 7,\, \unr\}$ \\ |
|
676 \hbox{}\qquad\qquad $\textit{int} = \{0,\, 1,\, 2,\, 3,\, 4,\, -3,\, -2,\, -1,\, \unr\}$ \\ |
|
677 \hbox{}\qquad\qquad $\textit{real} = \{1,\, 0,\, 4,\, -3/2,\, 3,\, 2,\, 1/2,\, -1/2,\, \unr\}$ |
|
678 \postw |
|
679 |
|
680 \subsection{Inductive and Coinductive Predicates} |
|
681 \label{inductive-and-coinductive-predicates} |
|
682 |
|
683 Inductively defined predicates (and sets) are particularly problematic for |
|
684 counterexample generators. They can make Quickcheck~\cite{berghofer-nipkow-2004} |
|
685 loop forever and Refute~\cite{weber-2008} run out of resources. The crux of |
|
686 the problem is that they are defined using a least fixed point construction. |
|
687 |
|
688 Nitpick's philosophy is that not all inductive predicates are equal. Consider |
|
689 the \textit{even} predicate below: |
|
690 |
|
691 \prew |
|
692 \textbf{inductive}~\textit{even}~\textbf{where} \\ |
|
693 ``\textit{even}~0'' $\,\mid$ \\ |
|
694 ``\textit{even}~$n\,\Longrightarrow\, \textit{even}~(\textit{Suc}~(\textit{Suc}~n))$'' |
|
695 \postw |
|
696 |
|
697 This predicate enjoys the desirable property of being well-founded, which means |
|
698 that the introduction rules don't give rise to infinite chains of the form |
|
699 |
|
700 \prew |
|
701 $\cdots\,\Longrightarrow\, \textit{even}~k'' |
|
702 \,\Longrightarrow\, \textit{even}~k' |
|
703 \,\Longrightarrow\, \textit{even}~k.$ |
|
704 \postw |
|
705 |
|
706 For \textit{even}, this is obvious: Any chain ending at $k$ will be of length |
|
707 $k/2 + 1$: |
|
708 |
|
709 \prew |
|
710 $\textit{even}~0\,\Longrightarrow\, \textit{even}~2\,\Longrightarrow\, \cdots |
|
711 \,\Longrightarrow\, \textit{even}~(k - 2) |
|
712 \,\Longrightarrow\, \textit{even}~k.$ |
|
713 \postw |
|
714 |
|
715 Wellfoundedness is desirable because it enables Nitpick to use a very efficient |
|
716 fixed point computation.% |
|
717 \footnote{If an inductive predicate is |
|
718 well-founded, then it has exactly one fixed point, which is simultaneously the |
|
719 least and the greatest fixed point. In these circumstances, the computation of |
|
720 the least fixed point amounts to the computation of an arbitrary fixed point, |
|
721 which can be performed using a straightforward recursive equation.} |
|
722 Moreover, Nitpick can prove wellfoundedness of most well-founded predicates, |
|
723 just as Isabelle's \textbf{function} package usually discharges termination |
|
724 proof obligations automatically. |
|
725 |
|
726 Let's try an example: |
|
727 |
|
728 \prew |
|
729 \textbf{lemma} ``$\exists n.\; \textit{even}~n \mathrel{\land} \textit{even}~(\textit{Suc}~n)$'' \\ |
|
730 \textbf{nitpick}~[\textit{card nat}~= 100,\, \textit{verbose}] \\[2\smallskipamount] |
|
731 \slshape The inductive predicate ``\textit{even}'' was proved well-founded. |
|
732 Nitpick can compute it efficiently. \\[2\smallskipamount] |
|
733 Trying 1 scope: \\ |
|
734 \hbox{}\qquad \textit{card nat}~= 100. \\[2\smallskipamount] |
|
735 Nitpick found a potential counterexample for \textit{card nat}~= 100: \\[2\smallskipamount] |
|
736 \hbox{}\qquad Empty assignment \\[2\smallskipamount] |
|
737 Nitpick could not find a better counterexample. \\[2\smallskipamount] |
|
738 Total time: 2274 ms. |
|
739 \postw |
|
740 |
|
741 No genuine counterexample is possible because Nitpick cannot rule out the |
|
742 existence of a natural number $n \ge 100$ such that both $\textit{even}~n$ and |
|
743 $\textit{even}~(\textit{Suc}~n)$ are true. To help Nitpick, we can bound the |
|
744 existential quantifier: |
|
745 |
|
746 \prew |
|
747 \textbf{lemma} ``$\exists n \mathbin{\le} 99.\; \textit{even}~n \mathrel{\land} \textit{even}~(\textit{Suc}~n)$'' \\ |
|
748 \textbf{nitpick}~[\textit{card nat}~= 100] \\[2\smallskipamount] |
|
749 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
750 \hbox{}\qquad Empty assignment |
|
751 \postw |
|
752 |
|
753 So far we were blessed by the wellfoundedness of \textit{even}. What happens if |
|
754 we use the following definition instead? |
|
755 |
|
756 \prew |
|
757 \textbf{inductive} $\textit{even}'$ \textbf{where} \\ |
|
758 ``$\textit{even}'~(0{\Colon}\textit{nat})$'' $\,\mid$ \\ |
|
759 ``$\textit{even}'~2$'' $\,\mid$ \\ |
|
760 ``$\lbrakk\textit{even}'~m;\> \textit{even}'~n\rbrakk \,\Longrightarrow\, \textit{even}'~(m + n)$'' |
|
761 \postw |
|
762 |
|
763 This definition is not well-founded: From $\textit{even}'~0$ and |
|
764 $\textit{even}'~0$, we can derive that $\textit{even}'~0$. Nonetheless, the |
|
765 predicates $\textit{even}$ and $\textit{even}'$ are equivalent. |
|
766 |
|
767 Let's check a property involving $\textit{even}'$. To make up for the |
|
768 foreseeable computational hurdles entailed by non-wellfoundedness, we decrease |
|
769 \textit{nat}'s cardinality to a mere 10: |
|
770 |
|
771 \prew |
|
772 \textbf{lemma}~``$\exists n \in \{0, 2, 4, 6, 8\}.\; |
|
773 \lnot\;\textit{even}'~n$'' \\ |
|
774 \textbf{nitpick}~[\textit{card nat}~= 10,\, \textit{verbose},\, \textit{show\_consts}] \\[2\smallskipamount] |
|
775 \slshape |
|
776 The inductive predicate ``$\textit{even}'\!$'' could not be proved well-founded. |
|
777 Nitpick might need to unroll it. \\[2\smallskipamount] |
|
778 Trying 6 scopes: \\ |
|
779 \hbox{}\qquad \textit{card nat}~= 10 and \textit{iter} $\textit{even}'$~= 0; \\ |
|
780 \hbox{}\qquad \textit{card nat}~= 10 and \textit{iter} $\textit{even}'$~= 1; \\ |
|
781 \hbox{}\qquad \textit{card nat}~= 10 and \textit{iter} $\textit{even}'$~= 2; \\ |
|
782 \hbox{}\qquad \textit{card nat}~= 10 and \textit{iter} $\textit{even}'$~= 4; \\ |
|
783 \hbox{}\qquad \textit{card nat}~= 10 and \textit{iter} $\textit{even}'$~= 8; \\ |
|
784 \hbox{}\qquad \textit{card nat}~= 10 and \textit{iter} $\textit{even}'$~= 9. \\[2\smallskipamount] |
|
785 Nitpick found a counterexample for \textit{card nat}~= 10 and \textit{iter} $\textit{even}'$~= 2: \\[2\smallskipamount] |
|
786 \hbox{}\qquad Constant: \nopagebreak \\ |
|
787 \hbox{}\qquad\qquad $\lambda i.\; \textit{even}'$ = $\undef(\!\begin{aligned}[t] |
|
788 & 2 := \{0, 2, 4, 6, 8, 1^\Q, 3^\Q, 5^\Q, 7^\Q, 9^\Q\}, \\[-2pt] |
|
789 & 1 := \{0, 2, 4, 1^\Q, 3^\Q, 5^\Q, 6^\Q, 7^\Q, 8^\Q, 9^\Q\}, \\[-2pt] |
|
790 & 0 := \{0, 2, 1^\Q, 3^\Q, 4^\Q, 5^\Q, 6^\Q, 7^\Q, 8^\Q, 9^\Q\})\end{aligned}$ \\[2\smallskipamount] |
|
791 Total time: 1140 ms. |
|
792 \postw |
|
793 |
|
794 Nitpick's output is very instructive. First, it tells us that the predicate is |
|
795 unrolled, meaning that it is computed iteratively from the empty set. Then it |
|
796 lists six scopes specifying different bounds on the numbers of iterations:\ 0, |
|
797 1, 2, 4, 8, and~9. |
|
798 |
|
799 The output also shows how each iteration contributes to $\textit{even}'$. The |
|
800 notation $\lambda i.\; \textit{even}'$ indicates that the value of the |
|
801 predicate depends on an iteration counter. Iteration 0 provides the basis |
|
802 elements, $0$ and $2$. Iteration 1 contributes $4$ ($= 2 + 2$). Iteration 2 |
|
803 throws $6$ ($= 2 + 4 = 4 + 2$) and $8$ ($= 4 + 4$) into the mix. Further |
|
804 iterations would not contribute any new elements. |
|
805 |
|
806 Some values are marked with superscripted question |
|
807 marks~(`\lower.2ex\hbox{$^\Q$}'). These are the elements for which the |
|
808 predicate evaluates to $\unk$. Thus, $\textit{even}'$ evaluates to either |
|
809 \textit{True} or $\unk$, never \textit{False}. |
|
810 |
|
811 When unrolling a predicate, Nitpick tries 0, 1, 2, 4, 8, 12, 16, and 24 |
|
812 iterations. However, these numbers are bounded by the cardinality of the |
|
813 predicate's domain. With \textit{card~nat}~= 10, no more than 9 iterations are |
|
814 ever needed to compute the value of a \textit{nat} predicate. You can specify |
|
815 the number of iterations using the \textit{iter} option, as explained in |
|
816 \S\ref{scope-of-search}. |
|
817 |
|
818 In the next formula, $\textit{even}'$ occurs both positively and negatively: |
|
819 |
|
820 \prew |
|
821 \textbf{lemma} ``$\textit{even}'~(n - 2) \,\Longrightarrow\, \textit{even}'~n$'' \\ |
|
822 \textbf{nitpick} [\textit{card nat} = 10,\, \textit{show\_consts}] \\[2\smallskipamount] |
|
823 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
824 \hbox{}\qquad Free variable: \nopagebreak \\ |
|
825 \hbox{}\qquad\qquad $n = 1$ \\ |
|
826 \hbox{}\qquad Constants: \nopagebreak \\ |
|
827 \hbox{}\qquad\qquad $\lambda i.\; \textit{even}'$ = $\undef(\!\begin{aligned}[t] |
|
828 & 0 := \{0, 2, 1^\Q, 3^\Q, 4^\Q, 5^\Q, 6^\Q, 7^\Q, 8^\Q, 9^\Q\})\end{aligned}$ \\ |
|
829 \hbox{}\qquad\qquad $\textit{even}' \subseteq \{0, 2, 4, 6, 8, \unr\}$ |
|
830 \postw |
|
831 |
|
832 Notice the special constraint $\textit{even}' \subseteq \{0,\, 2,\, 4,\, 6,\, |
|
833 8,\, \unr\}$ in the output, whose right-hand side represents an arbitrary |
|
834 fixed point (not necessarily the least one). It is used to falsify |
|
835 $\textit{even}'~n$. In contrast, the unrolled predicate is used to satisfy |
|
836 $\textit{even}'~(n - 2)$. |
|
837 |
|
838 Coinductive predicates are handled dually. For example: |
|
839 |
|
840 \prew |
|
841 \textbf{coinductive} \textit{nats} \textbf{where} \\ |
|
842 ``$\textit{nats}~(x\Colon\textit{nat}) \,\Longrightarrow\, \textit{nats}~x$'' \\[2\smallskipamount] |
|
843 \textbf{lemma} ``$\textit{nats} = \{0, 1, 2, 3, 4\}$'' \\ |
|
844 \textbf{nitpick}~[\textit{card nat} = 10,\, \textit{show\_consts}] \\[2\smallskipamount] |
|
845 \slshape Nitpick found a counterexample: |
|
846 \\[2\smallskipamount] |
|
847 \hbox{}\qquad Constants: \nopagebreak \\ |
|
848 \hbox{}\qquad\qquad $\lambda i.\; \textit{nats} = \undef(0 := \{\!\begin{aligned}[t] |
|
849 & 0^\Q, 1^\Q, 2^\Q, 3^\Q, 4^\Q, 5^\Q, 6^\Q, 7^\Q, 8^\Q, 9^\Q, \\[-2pt] |
|
850 & \unr\})\end{aligned}$ \\ |
|
851 \hbox{}\qquad\qquad $nats \supseteq \{9, 5^\Q, 6^\Q, 7^\Q, 8^\Q, \unr\}$ |
|
852 \postw |
|
853 |
|
854 As a special case, Nitpick uses Kodkod's transitive closure operator to encode |
|
855 negative occurrences of non-well-founded ``linear inductive predicates,'' i.e., |
|
856 inductive predicates for which each the predicate occurs in at most one |
|
857 assumption of each introduction rule. For example: |
|
858 |
|
859 \prew |
|
860 \textbf{inductive} \textit{odd} \textbf{where} \\ |
|
861 ``$\textit{odd}~1$'' $\,\mid$ \\ |
|
862 ``$\lbrakk \textit{odd}~m;\>\, \textit{even}~n\rbrakk \,\Longrightarrow\, \textit{odd}~(m + n)$'' \\[2\smallskipamount] |
|
863 \textbf{lemma}~``$\textit{odd}~n \,\Longrightarrow\, \textit{odd}~(n - 2)$'' \\ |
|
864 \textbf{nitpick}~[\textit{card nat} = 10,\, \textit{show\_consts}] \\[2\smallskipamount] |
|
865 \slshape Nitpick found a counterexample: |
|
866 \\[2\smallskipamount] |
|
867 \hbox{}\qquad Free variable: \nopagebreak \\ |
|
868 \hbox{}\qquad\qquad $n = 1$ \\ |
|
869 \hbox{}\qquad Constants: \nopagebreak \\ |
|
870 \hbox{}\qquad\qquad $\textit{even} = \{0, 2, 4, 6, 8, \unr\}$ \\ |
|
871 \hbox{}\qquad\qquad $\textit{odd}_{\textsl{base}} = \{1, \unr\}$ \\ |
|
872 \hbox{}\qquad\qquad $\textit{odd}_{\textsl{step}} = \! |
|
873 \!\begin{aligned}[t] |
|
874 & \{(0, 0), (0, 2), (0, 4), (0, 6), (0, 8), (1, 1), (1, 3), (1, 5), \\[-2pt] |
|
875 & \phantom{\{} (1, 7), (1, 9), (2, 2), (2, 4), (2, 6), (2, 8), (3, 3), |
|
876 (3, 5), \\[-2pt] |
|
877 & \phantom{\{} (3, 7), (3, 9), (4, 4), (4, 6), (4, 8), (5, 5), (5, 7), (5, 9), \\[-2pt] |
|
878 & \phantom{\{} (6, 6), (6, 8), (7, 7), (7, 9), (8, 8), (9, 9), \unr\}\end{aligned}$ \\ |
|
879 \hbox{}\qquad\qquad $\textit{odd} \subseteq \{1, 3, 5, 7, 9, 8^\Q, \unr\}$ |
|
880 \postw |
|
881 |
|
882 \noindent |
|
883 In the output, $\textit{odd}_{\textrm{base}}$ represents the base elements and |
|
884 $\textit{odd}_{\textrm{step}}$ is a transition relation that computes new |
|
885 elements from known ones. The set $\textit{odd}$ consists of all the values |
|
886 reachable through the reflexive transitive closure of |
|
887 $\textit{odd}_{\textrm{step}}$ starting with any element from |
|
888 $\textit{odd}_{\textrm{base}}$, namely 1, 3, 5, 7, and 9. Using Kodkod's |
|
889 transitive closure to encode linear predicates is normally either more thorough |
|
890 or more efficient than unrolling (depending on the value of \textit{iter}), but |
|
891 for those cases where it isn't you can disable it by passing the |
|
892 \textit{dont\_star\_linear\_preds} option. |
|
893 |
|
894 \subsection{Coinductive Datatypes} |
|
895 \label{coinductive-datatypes} |
|
896 |
|
897 While Isabelle regrettably lacks a high-level mechanism for defining coinductive |
|
898 datatypes, the \textit{Coinductive\_List} theory provides a coinductive ``lazy |
|
899 list'' datatype, $'a~\textit{llist}$, defined the hard way. Nitpick supports |
|
900 these lazy lists seamlessly and provides a hook, described in |
|
901 \S\ref{registration-of-coinductive-datatypes}, to register custom coinductive |
|
902 datatypes. |
|
903 |
|
904 (Co)intuitively, a coinductive datatype is similar to an inductive datatype but |
|
905 allows infinite objects. Thus, the infinite lists $\textit{ps}$ $=$ $[a, a, a, |
|
906 \ldots]$, $\textit{qs}$ $=$ $[a, b, a, b, \ldots]$, and $\textit{rs}$ $=$ $[0, |
|
907 1, 2, 3, \ldots]$ can be defined as lazy lists using the |
|
908 $\textit{LNil}\mathbin{\Colon}{'}a~\textit{llist}$ and |
|
909 $\textit{LCons}\mathbin{\Colon}{'}a \mathbin{\Rightarrow} {'}a~\textit{llist} |
|
910 \mathbin{\Rightarrow} {'}a~\textit{llist}$ constructors. |
|
911 |
|
912 Although it is otherwise no friend of infinity, Nitpick can find counterexamples |
|
913 involving cyclic lists such as \textit{ps} and \textit{qs} above as well as |
|
914 finite lists: |
|
915 |
|
916 \prew |
|
917 \textbf{lemma} ``$\textit{xs} \not= \textit{LCons}~a~\textit{xs}$'' \\ |
|
918 \textbf{nitpick} \\[2\smallskipamount] |
|
919 \slshape Nitpick found a counterexample for {\itshape card}~$'a$ = 1: \\[2\smallskipamount] |
|
920 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
921 \hbox{}\qquad\qquad $\textit{a} = a_1$ \\ |
|
922 \hbox{}\qquad\qquad $\textit{xs} = \textsl{THE}~\omega.\; \omega = \textit{LCons}~a_1~\omega$ |
|
923 \postw |
|
924 |
|
925 The notation $\textrm{THE}~\omega.\; \omega = t(\omega)$ stands |
|
926 for the infinite term $t(t(t(\ldots)))$. Hence, \textit{xs} is simply the |
|
927 infinite list $[a_1, a_1, a_1, \ldots]$. |
|
928 |
|
929 The next example is more interesting: |
|
930 |
|
931 \prew |
|
932 \textbf{lemma}~``$\lbrakk\textit{xs} = \textit{LCons}~a~\textit{xs};\>\, |
|
933 \textit{ys} = \textit{iterates}~(\lambda b.\> a)~b\rbrakk \,\Longrightarrow\, \textit{xs} = \textit{ys}$'' \\ |
|
934 \textbf{nitpick} [\textit{verbose}] \\[2\smallskipamount] |
|
935 \slshape The type ``\kern1pt$'a$'' passed the monotonicity test. Nitpick might be able to skip |
|
936 some scopes. \\[2\smallskipamount] |
|
937 Trying 8 scopes: \\ |
|
938 \hbox{}\qquad \textit{card} $'a$~= 1, \textit{card} ``\kern1pt$'a~\textit{list}$''~= 1, |
|
939 and \textit{bisim\_depth}~= 0. \\ |
|
940 \hbox{}\qquad $\qquad\vdots$ \\[.5\smallskipamount] |
|
941 \hbox{}\qquad \textit{card} $'a$~= 8, \textit{card} ``\kern1pt$'a~\textit{list}$''~= 8, |
|
942 and \textit{bisim\_depth}~= 7. \\[2\smallskipamount] |
|
943 Nitpick found a counterexample for {\itshape card}~$'a$ = 2, |
|
944 \textit{card}~``\kern1pt$'a~\textit{list}$''~= 2, and \textit{bisim\_\allowbreak |
|
945 depth}~= 1: |
|
946 \\[2\smallskipamount] |
|
947 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
948 \hbox{}\qquad\qquad $\textit{a} = a_2$ \\ |
|
949 \hbox{}\qquad\qquad $\textit{b} = a_1$ \\ |
|
950 \hbox{}\qquad\qquad $\textit{xs} = \textsl{THE}~\omega.\; \omega = \textit{LCons}~a_2~\omega$ \\ |
|
951 \hbox{}\qquad\qquad $\textit{ys} = \textit{LCons}~a_1~(\textsl{THE}~\omega.\; \omega = \textit{LCons}~a_2~\omega)$ \\[2\smallskipamount] |
|
952 Total time: 726 ms. |
|
953 \postw |
|
954 |
|
955 The lazy list $\textit{xs}$ is simply $[a_2, a_2, a_2, \ldots]$, whereas |
|
956 $\textit{ys}$ is $[a_1, a_2, a_2, a_2, \ldots]$, i.e., a lasso-shaped list with |
|
957 $[a_1]$ as its stem and $[a_2]$ as its cycle. In general, the list segment |
|
958 within the scope of the {THE} binder corresponds to the lasso's cycle, whereas |
|
959 the segment leading to the binder is the stem. |
|
960 |
|
961 A salient property of coinductive datatypes is that two objects are considered |
|
962 equal if and only if they lead to the same observations. For example, the lazy |
|
963 lists $\textrm{THE}~\omega.\; \omega = |
|
964 \textit{LCons}~a~(\textit{LCons}~b~\omega)$ and |
|
965 $\textit{LCons}~a~(\textrm{THE}~\omega.\; \omega = |
|
966 \textit{LCons}~b~(\textit{LCons}~a~\omega))$ are identical, because both lead |
|
967 to the sequence of observations $a$, $b$, $a$, $b$, \hbox{\ldots} (or, |
|
968 equivalently, both encode the infinite list $[a, b, a, b, \ldots]$). This |
|
969 concept of equality for coinductive datatypes is called bisimulation and is |
|
970 defined coinductively. |
|
971 |
|
972 Internally, Nitpick encodes the coinductive bisimilarity predicate as part of |
|
973 the Kodkod problem to ensure that distinct objects lead to different |
|
974 observations. This precaution is somewhat expensive and often unnecessary, so it |
|
975 can be disabled by setting the \textit{bisim\_depth} option to $-1$. The |
|
976 bisimilarity check is then performed \textsl{after} the counterexample has been |
|
977 found to ensure correctness. If this after-the-fact check fails, the |
|
978 counterexample is tagged as ``likely genuine'' and Nitpick recommends to try |
|
979 again with \textit{bisim\_depth} set to a nonnegative integer. Disabling the |
|
980 check for the previous example saves approximately 150~milli\-seconds; the speed |
|
981 gains can be more significant for larger scopes. |
|
982 |
|
983 The next formula illustrates the need for bisimilarity (either as a Kodkod |
|
984 predicate or as an after-the-fact check) to prevent spurious counterexamples: |
|
985 |
|
986 \prew |
|
987 \textbf{lemma} ``$\lbrakk xs = \textit{LCons}~a~\textit{xs};\>\, \textit{ys} = \textit{LCons}~a~\textit{ys}\rbrakk |
|
988 \,\Longrightarrow\, \textit{xs} = \textit{ys}$'' \\ |
|
989 \textbf{nitpick} [\textit{bisim\_depth} = $-1$,\, \textit{show\_datatypes}] \\[2\smallskipamount] |
|
990 \slshape Nitpick found a likely genuine counterexample for $\textit{card}~'a$ = 2: \\[2\smallskipamount] |
|
991 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
992 \hbox{}\qquad\qquad $a = a_2$ \\ |
|
993 \hbox{}\qquad\qquad $\textit{xs} = \textsl{THE}~\omega.\; \omega = |
|
994 \textit{LCons}~a_2~\omega$ \\ |
|
995 \hbox{}\qquad\qquad $\textit{ys} = \textsl{THE}~\omega.\; \omega = \textit{LCons}~a_2~\omega$ \\ |
|
996 \hbox{}\qquad Codatatype:\strut \nopagebreak \\ |
|
997 \hbox{}\qquad\qquad $'a~\textit{llist} = |
|
998 \{\!\begin{aligned}[t] |
|
999 & \textsl{THE}~\omega.\; \omega = \textit{LCons}~a_2~\omega, \\[-2pt] |
|
1000 & \textsl{THE}~\omega.\; \omega = \textit{LCons}~a_2~\omega,\> \unr\}\end{aligned}$ |
|
1001 \\[2\smallskipamount] |
|
1002 Try again with ``\textit{bisim\_depth}'' set to a nonnegative value to confirm |
|
1003 that the counterexample is genuine. \\[2\smallskipamount] |
|
1004 {\upshape\textbf{nitpick}} \\[2\smallskipamount] |
|
1005 \slshape Nitpick found no counterexample. |
|
1006 \postw |
|
1007 |
|
1008 In the first \textbf{nitpick} invocation, the after-the-fact check discovered |
|
1009 that the two known elements of type $'a~\textit{llist}$ are bisimilar. |
|
1010 |
|
1011 A compromise between leaving out the bisimilarity predicate from the Kodkod |
|
1012 problem and performing the after-the-fact check is to specify a lower |
|
1013 nonnegative \textit{bisim\_depth} value than the default one provided by |
|
1014 Nitpick. In general, a value of $K$ means that Nitpick will require all lists to |
|
1015 be distinguished from each other by their prefixes of length $K$. Be aware that |
|
1016 setting $K$ to a too low value can overconstrain Nitpick, preventing it from |
|
1017 finding any counterexamples. |
|
1018 |
|
1019 \subsection{Boxing} |
|
1020 \label{boxing} |
|
1021 |
|
1022 Nitpick normally maps function and product types directly to the corresponding |
|
1023 Kodkod concepts. As a consequence, if $'a$ has cardinality 3 and $'b$ has |
|
1024 cardinality 4, then $'a \times {'}b$ has cardinality 12 ($= 4 \times 3$) and $'a |
|
1025 \Rightarrow {'}b$ has cardinality 64 ($= 4^3$). In some circumstances, it pays |
|
1026 off to treat these types in the same way as plain datatypes, by approximating |
|
1027 them by a subset of a given cardinality. This technique is called ``boxing'' and |
|
1028 is particularly useful for functions passed as arguments to other functions, for |
|
1029 high-arity functions, and for large tuples. Under the hood, boxing involves |
|
1030 wrapping occurrences of the types $'a \times {'}b$ and $'a \Rightarrow {'}b$ in |
|
1031 isomorphic datatypes, as can be seen by enabling the \textit{debug} option. |
|
1032 |
|
1033 To illustrate boxing, we consider a formalization of $\lambda$-terms represented |
|
1034 using de Bruijn's notation: |
|
1035 |
|
1036 \prew |
|
1037 \textbf{datatype} \textit{tm} = \textit{Var}~\textit{nat}~$\mid$~\textit{Lam}~\textit{tm} $\mid$ \textit{App~tm~tm} |
|
1038 \postw |
|
1039 |
|
1040 The $\textit{lift}~t~k$ function increments all variables with indices greater |
|
1041 than or equal to $k$ by one: |
|
1042 |
|
1043 \prew |
|
1044 \textbf{primrec} \textit{lift} \textbf{where} \\ |
|
1045 ``$\textit{lift}~(\textit{Var}~j)~k = \textit{Var}~(\textrm{if}~j < k~\textrm{then}~j~\textrm{else}~j + 1)$'' $\mid$ \\ |
|
1046 ``$\textit{lift}~(\textit{Lam}~t)~k = \textit{Lam}~(\textit{lift}~t~(k + 1))$'' $\mid$ \\ |
|
1047 ``$\textit{lift}~(\textit{App}~t~u)~k = \textit{App}~(\textit{lift}~t~k)~(\textit{lift}~u~k)$'' |
|
1048 \postw |
|
1049 |
|
1050 The $\textit{loose}~t~k$ predicate returns \textit{True} if and only if |
|
1051 term $t$ has a loose variable with index $k$ or more: |
|
1052 |
|
1053 \prew |
|
1054 \textbf{primrec}~\textit{loose} \textbf{where} \\ |
|
1055 ``$\textit{loose}~(\textit{Var}~j)~k = (j \ge k)$'' $\mid$ \\ |
|
1056 ``$\textit{loose}~(\textit{Lam}~t)~k = \textit{loose}~t~(\textit{Suc}~k)$'' $\mid$ \\ |
|
1057 ``$\textit{loose}~(\textit{App}~t~u)~k = (\textit{loose}~t~k \mathrel{\lor} \textit{loose}~u~k)$'' |
|
1058 \postw |
|
1059 |
|
1060 Next, the $\textit{subst}~\sigma~t$ function applies the substitution $\sigma$ |
|
1061 on $t$: |
|
1062 |
|
1063 \prew |
|
1064 \textbf{primrec}~\textit{subst} \textbf{where} \\ |
|
1065 ``$\textit{subst}~\sigma~(\textit{Var}~j) = \sigma~j$'' $\mid$ \\ |
|
1066 ``$\textit{subst}~\sigma~(\textit{Lam}~t) = {}$\phantom{''} \\ |
|
1067 \phantom{``}$\textit{Lam}~(\textit{subst}~(\lambda n.\> \textrm{case}~n~\textrm{of}~0 \Rightarrow \textit{Var}~0 \mid \textit{Suc}~m \Rightarrow \textit{lift}~(\sigma~m)~1)~t)$'' $\mid$ \\ |
|
1068 ``$\textit{subst}~\sigma~(\textit{App}~t~u) = \textit{App}~(\textit{subst}~\sigma~t)~(\textit{subst}~\sigma~u)$'' |
|
1069 \postw |
|
1070 |
|
1071 A substitution is a function that maps variable indices to terms. Observe that |
|
1072 $\sigma$ is a function passed as argument and that Nitpick can't optimize it |
|
1073 away, because the recursive call for the \textit{Lam} case involves an altered |
|
1074 version. Also notice the \textit{lift} call, which increments the variable |
|
1075 indices when moving under a \textit{Lam}. |
|
1076 |
|
1077 A reasonable property to expect of substitution is that it should leave closed |
|
1078 terms unchanged. Alas, even this simple property does not hold: |
|
1079 |
|
1080 \pre |
|
1081 \textbf{lemma}~``$\lnot\,\textit{loose}~t~0 \,\Longrightarrow\, \textit{subst}~\sigma~t = t$'' \\ |
|
1082 \textbf{nitpick} [\textit{verbose}] \\[2\smallskipamount] |
|
1083 \slshape |
|
1084 Trying 8 scopes: \nopagebreak \\ |
|
1085 \hbox{}\qquad \textit{card~nat}~= 1, \textit{card tm}~= 1, and \textit{card} ``$\textit{nat} \Rightarrow \textit{tm}$'' = 1; \\ |
|
1086 \hbox{}\qquad \textit{card~nat}~= 2, \textit{card tm}~= 2, and \textit{card} ``$\textit{nat} \Rightarrow \textit{tm}$'' = 2; \\ |
|
1087 \hbox{}\qquad $\qquad\vdots$ \\[.5\smallskipamount] |
|
1088 \hbox{}\qquad \textit{card~nat}~= 8, \textit{card tm}~= 8, and \textit{card} ``$\textit{nat} \Rightarrow \textit{tm}$'' = 8. \\[2\smallskipamount] |
|
1089 Nitpick found a counterexample for \textit{card~nat}~= 6, \textit{card~tm}~= 6, |
|
1090 and \textit{card}~``$\textit{nat} \Rightarrow \textit{tm}$''~= 6: \\[2\smallskipamount] |
|
1091 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
1092 \hbox{}\qquad\qquad $\sigma = \undef(\!\begin{aligned}[t] |
|
1093 & 0 := \textit{Var}~0,\> |
|
1094 1 := \textit{Var}~0,\> |
|
1095 2 := \textit{Var}~0, \\[-2pt] |
|
1096 & 3 := \textit{Var}~0,\> |
|
1097 4 := \textit{Var}~0,\> |
|
1098 5 := \textit{Var}~0)\end{aligned}$ \\ |
|
1099 \hbox{}\qquad\qquad $t = \textit{Lam}~(\textit{Lam}~(\textit{Var}~1))$ \\[2\smallskipamount] |
|
1100 Total time: $4679$ ms. |
|
1101 \postw |
|
1102 |
|
1103 Using \textit{eval}, we find out that $\textit{subst}~\sigma~t = |
|
1104 \textit{Lam}~(\textit{Lam}~(\textit{Var}~0))$. Using the traditional |
|
1105 $\lambda$-term notation, $t$~is |
|
1106 $\lambda x\, y.\> x$ whereas $\textit{subst}~\sigma~t$ is $\lambda x\, y.\> y$. |
|
1107 The bug is in \textit{subst}: The $\textit{lift}~(\sigma~m)~1$ call should be |
|
1108 replaced with $\textit{lift}~(\sigma~m)~0$. |
|
1109 |
|
1110 An interesting aspect of Nitpick's verbose output is that it assigned inceasing |
|
1111 cardinalities from 1 to 8 to the type $\textit{nat} \Rightarrow \textit{tm}$. |
|
1112 For the formula of interest, knowing 6 values of that type was enough to find |
|
1113 the counterexample. Without boxing, $46\,656$ ($= 6^6$) values must be |
|
1114 considered, a hopeless undertaking: |
|
1115 |
|
1116 \prew |
|
1117 \textbf{nitpick} [\textit{dont\_box}] \\[2\smallskipamount] |
|
1118 {\slshape Nitpick ran out of time after checking 4 of 8 scopes.} |
|
1119 \postw |
|
1120 |
|
1121 {\looseness=-1 |
|
1122 Boxing can be enabled or disabled globally or on a per-type basis using the |
|
1123 \textit{box} option. Moreover, setting the cardinality of a function or |
|
1124 product type implicitly enables boxing for that type. Nitpick usually performs |
|
1125 reasonable choices about which types should be boxed, but option tweaking |
|
1126 sometimes helps. |
|
1127 |
|
1128 } |
|
1129 |
|
1130 \subsection{Scope Monotonicity} |
|
1131 \label{scope-monotonicity} |
|
1132 |
|
1133 The \textit{card} option (together with \textit{iter}, \textit{bisim\_depth}, |
|
1134 and \textit{max}) controls which scopes are actually tested. In general, to |
|
1135 exhaust all models below a certain cardinality bound, the number of scopes that |
|
1136 Nitpick must consider increases exponentially with the number of type variables |
|
1137 (and \textbf{typedecl}'d types) occurring in the formula. Given the default |
|
1138 cardinality specification of 1--8, no fewer than $8^4 = 4096$ scopes must be |
|
1139 considered for a formula involving $'a$, $'b$, $'c$, and $'d$. |
|
1140 |
|
1141 Fortunately, many formulas exhibit a property called \textsl{scope |
|
1142 monotonicity}, meaning that if the formula is falsifiable for a given scope, |
|
1143 it is also falsifiable for all larger scopes \cite[p.~165]{jackson-2006}. |
|
1144 |
|
1145 Consider the formula |
|
1146 |
|
1147 \prew |
|
1148 \textbf{lemma}~``$\textit{length~xs} = \textit{length~ys} \,\Longrightarrow\, \textit{rev}~(\textit{zip~xs~ys}) = \textit{zip~xs}~(\textit{rev~ys})$'' |
|
1149 \postw |
|
1150 |
|
1151 where \textit{xs} is of type $'a~\textit{list}$ and \textit{ys} is of type |
|
1152 $'b~\textit{list}$. A priori, Nitpick would need to consider 512 scopes to |
|
1153 exhaust the specification \textit{card}~= 1--8. However, our intuition tells us |
|
1154 that any counterexample found with a small scope would still be a counterexample |
|
1155 in a larger scope---by simply ignoring the fresh $'a$ and $'b$ values provided |
|
1156 by the larger scope. Nitpick comes to the same conclusion after a careful |
|
1157 inspection of the formula and the relevant definitions: |
|
1158 |
|
1159 \prew |
|
1160 \textbf{nitpick}~[\textit{verbose}] \\[2\smallskipamount] |
|
1161 \slshape |
|
1162 The types ``\kern1pt$'a$'' and ``\kern1pt$'b$'' passed the monotonicity test. |
|
1163 Nitpick might be able to skip some scopes. |
|
1164 \\[2\smallskipamount] |
|
1165 Trying 8 scopes: \\ |
|
1166 \hbox{}\qquad \textit{card} $'a$~= 1, \textit{card} $'b$~= 1, |
|
1167 \textit{card} \textit{nat}~= 1, \textit{card} ``$('a \times {'}b)$ |
|
1168 \textit{list}''~= 1, \\ |
|
1169 \hbox{}\qquad\quad \textit{card} ``\kern1pt$'a$ \textit{list}''~= 1, and |
|
1170 \textit{card} ``\kern1pt$'b$ \textit{list}''~= 1. \\ |
|
1171 \hbox{}\qquad \textit{card} $'a$~= 2, \textit{card} $'b$~= 2, |
|
1172 \textit{card} \textit{nat}~= 2, \textit{card} ``$('a \times {'}b)$ |
|
1173 \textit{list}''~= 2, \\ |
|
1174 \hbox{}\qquad\quad \textit{card} ``\kern1pt$'a$ \textit{list}''~= 2, and |
|
1175 \textit{card} ``\kern1pt$'b$ \textit{list}''~= 2. \\ |
|
1176 \hbox{}\qquad $\qquad\vdots$ \\[.5\smallskipamount] |
|
1177 \hbox{}\qquad \textit{card} $'a$~= 8, \textit{card} $'b$~= 8, |
|
1178 \textit{card} \textit{nat}~= 8, \textit{card} ``$('a \times {'}b)$ |
|
1179 \textit{list}''~= 8, \\ |
|
1180 \hbox{}\qquad\quad \textit{card} ``\kern1pt$'a$ \textit{list}''~= 8, and |
|
1181 \textit{card} ``\kern1pt$'b$ \textit{list}''~= 8. |
|
1182 \\[2\smallskipamount] |
|
1183 Nitpick found a counterexample for |
|
1184 \textit{card} $'a$~= 5, \textit{card} $'b$~= 5, |
|
1185 \textit{card} \textit{nat}~= 5, \textit{card} ``$('a \times {'}b)$ |
|
1186 \textit{list}''~= 5, \textit{card} ``\kern1pt$'a$ \textit{list}''~= 5, and |
|
1187 \textit{card} ``\kern1pt$'b$ \textit{list}''~= 5: |
|
1188 \\[2\smallskipamount] |
|
1189 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
1190 \hbox{}\qquad\qquad $\textit{xs} = [a_4, a_5]$ \\ |
|
1191 \hbox{}\qquad\qquad $\textit{ys} = [b_3, b_3]$ \\[2\smallskipamount] |
|
1192 Total time: 1636 ms. |
|
1193 \postw |
|
1194 |
|
1195 In theory, it should be sufficient to test a single scope: |
|
1196 |
|
1197 \prew |
|
1198 \textbf{nitpick}~[\textit{card}~= 8] |
|
1199 \postw |
|
1200 |
|
1201 However, this is often less efficient in practice and may lead to overly complex |
|
1202 counterexamples. |
|
1203 |
|
1204 If the monotonicity check fails but we believe that the formula is monotonic (or |
|
1205 we don't mind missing some counterexamples), we can pass the |
|
1206 \textit{mono} option. To convince yourself that this option is risky, |
|
1207 simply consider this example from \S\ref{skolemization}: |
|
1208 |
|
1209 \prew |
|
1210 \textbf{lemma} ``$\exists g.\; \forall x\Colon 'b.~g~(f~x) = x |
|
1211 \,\Longrightarrow\, \forall y\Colon {'}a.\; \exists x.~y = f~x$'' \\ |
|
1212 \textbf{nitpick} [\textit{mono}] \\[2\smallskipamount] |
|
1213 {\slshape Nitpick found no counterexample.} \\[2\smallskipamount] |
|
1214 \textbf{nitpick} \\[2\smallskipamount] |
|
1215 \slshape |
|
1216 Nitpick found a counterexample for \textit{card} $'a$~= 2 and \textit{card} $'b$~=~1: \\ |
|
1217 \hbox{}\qquad $\vdots$ |
|
1218 \postw |
|
1219 |
|
1220 (It turns out the formula holds if and only if $\textit{card}~'a \le |
|
1221 \textit{card}~'b$.) Although this is rarely advisable, the automatic |
|
1222 monotonicity checks can be disabled by passing \textit{non\_mono} |
|
1223 (\S\ref{optimizations}). |
|
1224 |
|
1225 As insinuated in \S\ref{natural-numbers-and-integers} and |
|
1226 \S\ref{inductive-datatypes}, \textit{nat}, \textit{int}, and inductive datatypes |
|
1227 are normally monotonic and treated as such. The same is true for record types, |
|
1228 \textit{rat}, \textit{real}, and some \textbf{typedef}'d types. Thus, given the |
|
1229 cardinality specification 1--8, a formula involving \textit{nat}, \textit{int}, |
|
1230 \textit{int~list}, \textit{rat}, and \textit{rat~list} will lead Nitpick to |
|
1231 consider only 8~scopes instead of $32\,768$. |
|
1232 |
|
1233 \section{Case Studies} |
|
1234 \label{case-studies} |
|
1235 |
|
1236 As a didactic device, the previous section focused mostly on toy formulas whose |
|
1237 validity can easily be assessed just by looking at the formula. We will now |
|
1238 review two somewhat more realistic case studies that are within Nitpick's |
|
1239 reach:\ a context-free grammar modeled by mutually inductive sets and a |
|
1240 functional implementation of AA trees. The results presented in this |
|
1241 section were produced with the following settings: |
|
1242 |
|
1243 \prew |
|
1244 \textbf{nitpick\_params} [\textit{max\_potential}~= 0,\, \textit{max\_threads} = 2] |
|
1245 \postw |
|
1246 |
|
1247 \subsection{A Context-Free Grammar} |
|
1248 \label{a-context-free-grammar} |
|
1249 |
|
1250 Our first case study is taken from section 7.4 in the Isabelle tutorial |
|
1251 \cite{isa-tutorial}. The following grammar, originally due to Hopcroft and |
|
1252 Ullman, produces all strings with an equal number of $a$'s and $b$'s: |
|
1253 |
|
1254 \prew |
|
1255 \begin{tabular}{@{}r@{$\;\,$}c@{$\;\,$}l@{}} |
|
1256 $S$ & $::=$ & $\epsilon \mid bA \mid aB$ \\ |
|
1257 $A$ & $::=$ & $aS \mid bAA$ \\ |
|
1258 $B$ & $::=$ & $bS \mid aBB$ |
|
1259 \end{tabular} |
|
1260 \postw |
|
1261 |
|
1262 The intuition behind the grammar is that $A$ generates all string with one more |
|
1263 $a$ than $b$'s and $B$ generates all strings with one more $b$ than $a$'s. |
|
1264 |
|
1265 The alphabet consists exclusively of $a$'s and $b$'s: |
|
1266 |
|
1267 \prew |
|
1268 \textbf{datatype} \textit{alphabet}~= $a$ $\mid$ $b$ |
|
1269 \postw |
|
1270 |
|
1271 Strings over the alphabet are represented by \textit{alphabet list}s. |
|
1272 Nonterminals in the grammar become sets of strings. The production rules |
|
1273 presented above can be expressed as a mutually inductive definition: |
|
1274 |
|
1275 \prew |
|
1276 \textbf{inductive\_set} $S$ \textbf{and} $A$ \textbf{and} $B$ \textbf{where} \\ |
|
1277 \textit{R1}:\kern.4em ``$[] \in S$'' $\,\mid$ \\ |
|
1278 \textit{R2}:\kern.4em ``$w \in A\,\Longrightarrow\, b \mathbin{\#} w \in S$'' $\,\mid$ \\ |
|
1279 \textit{R3}:\kern.4em ``$w \in B\,\Longrightarrow\, a \mathbin{\#} w \in S$'' $\,\mid$ \\ |
|
1280 \textit{R4}:\kern.4em ``$w \in S\,\Longrightarrow\, a \mathbin{\#} w \in A$'' $\,\mid$ \\ |
|
1281 \textit{R5}:\kern.4em ``$w \in S\,\Longrightarrow\, b \mathbin{\#} w \in S$'' $\,\mid$ \\ |
|
1282 \textit{R6}:\kern.4em ``$\lbrakk v \in B;\> v \in B\rbrakk \,\Longrightarrow\, a \mathbin{\#} v \mathbin{@} w \in B$'' |
|
1283 \postw |
|
1284 |
|
1285 The conversion of the grammar into the inductive definition was done manually by |
|
1286 Joe Blow, an underpaid undergraduate student. As a result, some errors might |
|
1287 have sneaked in. |
|
1288 |
|
1289 Debugging faulty specifications is at the heart of Nitpick's \textsl{raison |
|
1290 d'\^etre}. A good approach is to state desirable properties of the specification |
|
1291 (here, that $S$ is exactly the set of strings over $\{a, b\}$ with as many $a$'s |
|
1292 as $b$'s) and check them with Nitpick. If the properties are correctly stated, |
|
1293 counterexamples will point to bugs in the specification. For our grammar |
|
1294 example, we will proceed in two steps, separating the soundness and the |
|
1295 completeness of the set $S$. First, soundness: |
|
1296 |
|
1297 \prew |
|
1298 \textbf{theorem}~\textit{S\_sound}: \\ |
|
1299 ``$w \in S \longrightarrow \textit{length}~[x\mathbin{\leftarrow} w.\; x = a] = |
|
1300 \textit{length}~[x\mathbin{\leftarrow} w.\; x = b]$'' \\ |
|
1301 \textbf{nitpick} \\[2\smallskipamount] |
|
1302 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
1303 \hbox{}\qquad Free variable: \nopagebreak \\ |
|
1304 \hbox{}\qquad\qquad $w = [b]$ |
|
1305 \postw |
|
1306 |
|
1307 It would seem that $[b] \in S$. How could this be? An inspection of the |
|
1308 introduction rules reveals that the only rule with a right-hand side of the form |
|
1309 $b \mathbin{\#} {\ldots} \in S$ that could have introduced $[b]$ into $S$ is |
|
1310 \textit{R5}: |
|
1311 |
|
1312 \prew |
|
1313 ``$w \in S\,\Longrightarrow\, b \mathbin{\#} w \in S$'' |
|
1314 \postw |
|
1315 |
|
1316 On closer inspection, we can see that this rule is wrong. To match the |
|
1317 production $B ::= bS$, the second $S$ should be a $B$. We fix the typo and try |
|
1318 again: |
|
1319 |
|
1320 \prew |
|
1321 \textbf{nitpick} \\[2\smallskipamount] |
|
1322 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
1323 \hbox{}\qquad Free variable: \nopagebreak \\ |
|
1324 \hbox{}\qquad\qquad $w = [a, a, b]$ |
|
1325 \postw |
|
1326 |
|
1327 Some detective work is necessary to find out what went wrong here. To get $[a, |
|
1328 a, b] \in S$, we need $[a, b] \in B$ by \textit{R3}, which in turn can only come |
|
1329 from \textit{R6}: |
|
1330 |
|
1331 \prew |
|
1332 ``$\lbrakk v \in B;\> v \in B\rbrakk \,\Longrightarrow\, a \mathbin{\#} v \mathbin{@} w \in B$'' |
|
1333 \postw |
|
1334 |
|
1335 Now, this formula must be wrong: The same assumption occurs twice, and the |
|
1336 variable $w$ is unconstrained. Clearly, one of the two occurrences of $v$ in |
|
1337 the assumptions should have been a $w$. |
|
1338 |
|
1339 With the correction made, we don't get any counterexample from Nitpick. Let's |
|
1340 move on and check completeness: |
|
1341 |
|
1342 \prew |
|
1343 \textbf{theorem}~\textit{S\_complete}: \\ |
|
1344 ``$\textit{length}~[x\mathbin{\leftarrow} w.\; x = a] = |
|
1345 \textit{length}~[x\mathbin{\leftarrow} w.\; x = b] |
|
1346 \longrightarrow w \in S$'' \\ |
|
1347 \textbf{nitpick} \\[2\smallskipamount] |
|
1348 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
1349 \hbox{}\qquad Free variable: \nopagebreak \\ |
|
1350 \hbox{}\qquad\qquad $w = [b, b, a, a]$ |
|
1351 \postw |
|
1352 |
|
1353 Apparently, $[b, b, a, a] \notin S$, even though it has the same numbers of |
|
1354 $a$'s and $b$'s. But since our inductive definition passed the soundness check, |
|
1355 the introduction rules we have are probably correct. Perhaps we simply lack an |
|
1356 introduction rule. Comparing the grammar with the inductive definition, our |
|
1357 suspicion is confirmed: Joe Blow simply forgot the production $A ::= bAA$, |
|
1358 without which the grammar cannot generate two or more $b$'s in a row. So we add |
|
1359 the rule |
|
1360 |
|
1361 \prew |
|
1362 ``$\lbrakk v \in A;\> w \in A\rbrakk \,\Longrightarrow\, b \mathbin{\#} v \mathbin{@} w \in A$'' |
|
1363 \postw |
|
1364 |
|
1365 With this last change, we don't get any counterexamples from Nitpick for either |
|
1366 soundness or completeness. We can even generalize our result to cover $A$ and |
|
1367 $B$ as well: |
|
1368 |
|
1369 \prew |
|
1370 \textbf{theorem} \textit{S\_A\_B\_sound\_and\_complete}: \\ |
|
1371 ``$w \in S \longleftrightarrow \textit{length}~[x \mathbin{\leftarrow} w.\; x = a] = \textit{length}~[x \mathbin{\leftarrow} w.\; x = b]$'' \\ |
|
1372 ``$w \in A \longleftrightarrow \textit{length}~[x \mathbin{\leftarrow} w.\; x = a] = \textit{length}~[x \mathbin{\leftarrow} w.\; x = b] + 1$'' \\ |
|
1373 ``$w \in B \longleftrightarrow \textit{length}~[x \mathbin{\leftarrow} w.\; x = b] = \textit{length}~[x \mathbin{\leftarrow} w.\; x = a] + 1$'' \\ |
|
1374 \textbf{nitpick} \\[2\smallskipamount] |
|
1375 \slshape Nitpick found no counterexample. |
|
1376 \postw |
|
1377 |
|
1378 \subsection{AA Trees} |
|
1379 \label{aa-trees} |
|
1380 |
|
1381 AA trees are a kind of balanced trees discovered by Arne Andersson that provide |
|
1382 similar performance to red-black trees, but with a simpler implementation |
|
1383 \cite{andersson-1993}. They can be used to store sets of elements equipped with |
|
1384 a total order $<$. We start by defining the datatype and some basic extractor |
|
1385 functions: |
|
1386 |
|
1387 \prew |
|
1388 \textbf{datatype} $'a$~\textit{tree} = $\Lambda$ $\mid$ $N$ ``\kern1pt$'a\Colon \textit{linorder}$'' \textit{nat} ``\kern1pt$'a$ \textit{tree}'' ``\kern1pt$'a$ \textit{tree}'' \\[2\smallskipamount] |
|
1389 \textbf{primrec} \textit{data} \textbf{where} \\ |
|
1390 ``$\textit{data}~\Lambda = \undef$'' $\,\mid$ \\ |
|
1391 ``$\textit{data}~(N~x~\_~\_~\_) = x$'' \\[2\smallskipamount] |
|
1392 \textbf{primrec} \textit{dataset} \textbf{where} \\ |
|
1393 ``$\textit{dataset}~\Lambda = \{\}$'' $\,\mid$ \\ |
|
1394 ``$\textit{dataset}~(N~x~\_~t~u) = \{x\} \cup \textit{dataset}~t \mathrel{\cup} \textit{dataset}~u$'' \\[2\smallskipamount] |
|
1395 \textbf{primrec} \textit{level} \textbf{where} \\ |
|
1396 ``$\textit{level}~\Lambda = 0$'' $\,\mid$ \\ |
|
1397 ``$\textit{level}~(N~\_~k~\_~\_) = k$'' \\[2\smallskipamount] |
|
1398 \textbf{primrec} \textit{left} \textbf{where} \\ |
|
1399 ``$\textit{left}~\Lambda = \Lambda$'' $\,\mid$ \\ |
|
1400 ``$\textit{left}~(N~\_~\_~t~\_) = t$'' \\[2\smallskipamount] |
|
1401 \textbf{primrec} \textit{right} \textbf{where} \\ |
|
1402 ``$\textit{right}~\Lambda = \Lambda$'' $\,\mid$ \\ |
|
1403 ``$\textit{right}~(N~\_~\_~\_~u) = u$'' |
|
1404 \postw |
|
1405 |
|
1406 The wellformedness criterion for AA trees is fairly complex. Wikipedia states it |
|
1407 as follows \cite{wikipedia-2009-aa-trees}: |
|
1408 |
|
1409 \kern.2\parskip %% TYPESETTING |
|
1410 |
|
1411 \pre |
|
1412 Each node has a level field, and the following invariants must remain true for |
|
1413 the tree to be valid: |
|
1414 |
|
1415 \raggedright |
|
1416 |
|
1417 \kern-.4\parskip %% TYPESETTING |
|
1418 |
|
1419 \begin{enum} |
|
1420 \item[] |
|
1421 \begin{enum} |
|
1422 \item[1.] The level of a leaf node is one. |
|
1423 \item[2.] The level of a left child is strictly less than that of its parent. |
|
1424 \item[3.] The level of a right child is less than or equal to that of its parent. |
|
1425 \item[4.] The level of a right grandchild is strictly less than that of its grandparent. |
|
1426 \item[5.] Every node of level greater than one must have two children. |
|
1427 \end{enum} |
|
1428 \end{enum} |
|
1429 \post |
|
1430 |
|
1431 \kern.4\parskip %% TYPESETTING |
|
1432 |
|
1433 The \textit{wf} predicate formalizes this description: |
|
1434 |
|
1435 \prew |
|
1436 \textbf{primrec} \textit{wf} \textbf{where} \\ |
|
1437 ``$\textit{wf}~\Lambda = \textit{True}$'' $\,\mid$ \\ |
|
1438 ``$\textit{wf}~(N~\_~k~t~u) =$ \\ |
|
1439 \phantom{``}$(\textrm{if}~t = \Lambda~\textrm{then}$ \\ |
|
1440 \phantom{``$(\quad$}$k = 1 \mathrel{\land} (u = \Lambda \mathrel{\lor} (\textit{level}~u = 1 \mathrel{\land} \textit{left}~u = \Lambda \mathrel{\land} \textit{right}~u = \Lambda))$ \\ |
|
1441 \phantom{``$($}$\textrm{else}$ \\ |
|
1442 \hbox{\phantom{``$(\quad$}$\textit{wf}~t \mathrel{\land} \textit{wf}~u |
|
1443 \mathrel{\land} u \not= \Lambda \mathrel{\land} \textit{level}~t < k |
|
1444 \mathrel{\land} \textit{level}~u \le k \mathrel{\land} |
|
1445 \textit{level}~(\textit{right}~u) < k)$''}\kern-200mm |
|
1446 \postw |
|
1447 |
|
1448 Rebalancing the tree upon insertion and removal of elements is performed by two |
|
1449 auxiliary functions called \textit{skew} and \textit{split}, defined below: |
|
1450 |
|
1451 \prew |
|
1452 \textbf{primrec} \textit{skew} \textbf{where} \\ |
|
1453 ``$\textit{skew}~\Lambda = \Lambda$'' $\,\mid$ \\ |
|
1454 ``$\textit{skew}~(N~x~k~t~u) = {}$ \\ |
|
1455 \phantom{``}$(\textrm{if}~t \not= \Lambda \mathrel{\land} k = |
|
1456 \textit{level}~t~\textrm{then}$ \\ |
|
1457 \phantom{``(\quad}$N~(\textit{data}~t)~k~(\textit{left}~t)~(N~x~k~ |
|
1458 (\textit{right}~t)~u)$ \\ |
|
1459 \phantom{``(}$\textrm{else}$ \\ |
|
1460 \phantom{``(\quad}$N~x~k~t~u)$'' |
|
1461 \postw |
|
1462 |
|
1463 \prew |
|
1464 \textbf{primrec} \textit{split} \textbf{where} \\ |
|
1465 ``$\textit{split}~\Lambda = \Lambda$'' $\,\mid$ \\ |
|
1466 ``$\textit{split}~(N~x~k~t~u) = {}$ \\ |
|
1467 \phantom{``}$(\textrm{if}~u \not= \Lambda \mathrel{\land} k = |
|
1468 \textit{level}~(\textit{right}~u)~\textrm{then}$ \\ |
|
1469 \phantom{``(\quad}$N~(\textit{data}~u)~(\textit{Suc}~k)~ |
|
1470 (N~x~k~t~(\textit{left}~u))~(\textit{right}~u)$ \\ |
|
1471 \phantom{``(}$\textrm{else}$ \\ |
|
1472 \phantom{``(\quad}$N~x~k~t~u)$'' |
|
1473 \postw |
|
1474 |
|
1475 Performing a \textit{skew} or a \textit{split} should have no impact on the set |
|
1476 of elements stored in the tree: |
|
1477 |
|
1478 \prew |
|
1479 \textbf{theorem}~\textit{dataset\_skew\_split}:\\ |
|
1480 ``$\textit{dataset}~(\textit{skew}~t) = \textit{dataset}~t$'' \\ |
|
1481 ``$\textit{dataset}~(\textit{split}~t) = \textit{dataset}~t$'' \\ |
|
1482 \textbf{nitpick} \\[2\smallskipamount] |
|
1483 {\slshape Nitpick ran out of time after checking 7 of 8 scopes.} |
|
1484 \postw |
|
1485 |
|
1486 Furthermore, applying \textit{skew} or \textit{split} to a well-formed tree |
|
1487 should not alter the tree: |
|
1488 |
|
1489 \prew |
|
1490 \textbf{theorem}~\textit{wf\_skew\_split}:\\ |
|
1491 ``$\textit{wf}~t\,\Longrightarrow\, \textit{skew}~t = t$'' \\ |
|
1492 ``$\textit{wf}~t\,\Longrightarrow\, \textit{split}~t = t$'' \\ |
|
1493 \textbf{nitpick} \\[2\smallskipamount] |
|
1494 {\slshape Nitpick found no counterexample.} |
|
1495 \postw |
|
1496 |
|
1497 Insertion is implemented recursively. It preserves the sort order: |
|
1498 |
|
1499 \prew |
|
1500 \textbf{primrec}~\textit{insort} \textbf{where} \\ |
|
1501 ``$\textit{insort}~\Lambda~x = N~x~1~\Lambda~\Lambda$'' $\,\mid$ \\ |
|
1502 ``$\textit{insort}~(N~y~k~t~u)~x =$ \\ |
|
1503 \phantom{``}$({*}~(\textit{split} \circ \textit{skew})~{*})~(N~y~k~(\textrm{if}~x < y~\textrm{then}~\textit{insort}~t~x~\textrm{else}~t)$ \\ |
|
1504 \phantom{``$({*}~(\textit{split} \circ \textit{skew})~{*})~(N~y~k~$}$(\textrm{if}~x > y~\textrm{then}~\textit{insort}~u~x~\textrm{else}~u))$'' |
|
1505 \postw |
|
1506 |
|
1507 Notice that we deliberately commented out the application of \textit{skew} and |
|
1508 \textit{split}. Let's see if this causes any problems: |
|
1509 |
|
1510 \prew |
|
1511 \textbf{theorem}~\textit{wf\_insort}:\kern.4em ``$\textit{wf}~t\,\Longrightarrow\, \textit{wf}~(\textit{insort}~t~x)$'' \\ |
|
1512 \textbf{nitpick} \\[2\smallskipamount] |
|
1513 \slshape Nitpick found a counterexample for \textit{card} $'a$ = 4: \\[2\smallskipamount] |
|
1514 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
1515 \hbox{}\qquad\qquad $t = N~a_3~1~\Lambda~\Lambda$ \\ |
|
1516 \hbox{}\qquad\qquad $x = a_4$ \\[2\smallskipamount] |
|
1517 Hint: Maybe you forgot a type constraint? |
|
1518 \postw |
|
1519 |
|
1520 It's hard to see why this is a counterexample. The hint is of no help here. To |
|
1521 improve readability, we will restrict the theorem to \textit{nat}, so that we |
|
1522 don't need to look up the value of the $\textit{op}~{<}$ constant to find out |
|
1523 which element is smaller than the other. In addition, we will tell Nitpick to |
|
1524 display the value of $\textit{insort}~t~x$ using the \textit{eval} option. This |
|
1525 gives |
|
1526 |
|
1527 \prew |
|
1528 \textbf{theorem} \textit{wf\_insort\_nat}:\kern.4em ``$\textit{wf}~t\,\Longrightarrow\, \textit{wf}~(\textit{insort}~t~(x\Colon\textit{nat}))$'' \\ |
|
1529 \textbf{nitpick} [\textit{eval} = ``$\textit{insort}~t~x$''] \\[2\smallskipamount] |
|
1530 \slshape Nitpick found a counterexample: \\[2\smallskipamount] |
|
1531 \hbox{}\qquad Free variables: \nopagebreak \\ |
|
1532 \hbox{}\qquad\qquad $t = N~1~1~\Lambda~\Lambda$ \\ |
|
1533 \hbox{}\qquad\qquad $x = 0$ \\ |
|
1534 \hbox{}\qquad Evaluated term: \\ |
|
1535 \hbox{}\qquad\qquad $\textit{insort}~t~x = N~1~1~(N~0~1~\Lambda~\Lambda)~\Lambda$ |
|
1536 \postw |
|
1537 |
|
1538 Nitpick's output reveals that the element $0$ was added as a left child of $1$, |
|
1539 where both have a level of 1. This violates the second AA tree invariant, which |
|
1540 states that a left child's level must be less than its parent's. This shouldn't |
|
1541 come as a surprise, considering that we commented out the tree rebalancing code. |
|
1542 Reintroducing the code seems to solve the problem: |
|
1543 |
|
1544 \prew |
|
1545 \textbf{theorem}~\textit{wf\_insort}:\kern.4em ``$\textit{wf}~t\,\Longrightarrow\, \textit{wf}~(\textit{insort}~t~x)$'' \\ |
|
1546 \textbf{nitpick} \\[2\smallskipamount] |
|
1547 {\slshape Nitpick ran out of time after checking 6 of 8 scopes.} |
|
1548 \postw |
|
1549 |
|
1550 Insertion should transform the set of elements represented by the tree in the |
|
1551 obvious way: |
|
1552 |
|
1553 \prew |
|
1554 \textbf{theorem} \textit{dataset\_insort}:\kern.4em |
|
1555 ``$\textit{dataset}~(\textit{insort}~t~x) = \{x\} \cup \textit{dataset}~t$'' \\ |
|
1556 \textbf{nitpick} \\[2\smallskipamount] |
|
1557 {\slshape Nitpick ran out of time after checking 5 of 8 scopes.} |
|
1558 \postw |
|
1559 |
|
1560 We could continue like this and sketch a complete theory of AA trees without |
|
1561 performing a single proof. Once the definitions and main theorems are in place |
|
1562 and have been thoroughly tested using Nitpick, we could start working on the |
|
1563 proofs. Developing theories this way usually saves time, because faulty theorems |
|
1564 and definitions are discovered much earlier in the process. |
|
1565 |
|
1566 \section{Option Reference} |
|
1567 \label{option-reference} |
|
1568 |
|
1569 \def\flushitem#1{\item[]\noindent\kern-\leftmargin \textbf{#1}} |
|
1570 \def\qty#1{$\left<\textit{#1}\right>$} |
|
1571 \def\qtybf#1{$\mathbf{\left<\textbf{\textit{#1}}\right>}$} |
|
1572 \def\optrue#1#2{\flushitem{\textit{#1} $\bigl[$= \qtybf{bool}$\bigr]$\quad [\textit{true}]\hfill (neg.: \textit{#2})}\nopagebreak\\[\parskip]} |
|
1573 \def\opfalse#1#2{\flushitem{\textit{#1} $\bigl[$= \qtybf{bool}$\bigr]$\quad [\textit{false}]\hfill (neg.: \textit{#2})}\nopagebreak\\[\parskip]} |
|
1574 \def\opsmart#1#2{\flushitem{\textit{#1} $\bigl[$= \qtybf{bool\_or\_smart}$\bigr]$\quad [\textit{smart}]\hfill (neg.: \textit{#2})}\nopagebreak\\[\parskip]} |
|
1575 \def\ops#1#2{\flushitem{\textit{#1} = \qtybf{#2}} \nopagebreak\\[\parskip]} |
|
1576 \def\opt#1#2#3{\flushitem{\textit{#1} = \qtybf{#2}\quad [\textit{#3}]} \nopagebreak\\[\parskip]} |
|
1577 \def\opu#1#2#3{\flushitem{\textit{#1} \qtybf{#2} = \qtybf{#3}} \nopagebreak\\[\parskip]} |
|
1578 \def\opusmart#1#2#3{\flushitem{\textit{#1} \qtybf{#2} $\bigl[$= \qtybf{bool\_or\_smart}$\bigr]$\hfill (neg.: \textit{#3})}\nopagebreak\\[\parskip]} |
|
1579 |
|
1580 Nitpick's behavior can be influenced by various options, which can be specified |
|
1581 in brackets after the \textbf{nitpick} command. Default values can be set |
|
1582 using \textbf{nitpick\_\allowbreak params}. For example: |
|
1583 |
|
1584 \prew |
|
1585 \textbf{nitpick\_params} [\textit{verbose}, \,\textit{timeout} = 60$\,s$] |
|
1586 \postw |
|
1587 |
|
1588 The options are categorized as follows:\ mode of operation |
|
1589 (\S\ref{mode-of-operation}), scope of search (\S\ref{scope-of-search}), output |
|
1590 format (\S\ref{output-format}), automatic counterexample checks |
|
1591 (\S\ref{authentication}), optimizations |
|
1592 (\S\ref{optimizations}), and timeouts (\S\ref{timeouts}). |
|
1593 |
|
1594 The number of options can be overwhelming at first glance. Do not let that worry |
|
1595 you: Nitpick's defaults have been chosen so that it almost always does the right |
|
1596 thing, and the most important options have been covered in context in |
|
1597 \S\ref{first-steps}. |
|
1598 |
|
1599 The descriptions below refer to the following syntactic quantities: |
|
1600 |
|
1601 \begin{enum} |
|
1602 \item[$\bullet$] \qtybf{string}: A string. |
|
1603 \item[$\bullet$] \qtybf{bool}: \textit{true} or \textit{false}. |
|
1604 \item[$\bullet$] \qtybf{bool\_or\_smart}: \textit{true}, \textit{false}, or \textit{smart}. |
|
1605 \item[$\bullet$] \qtybf{int}: An integer. Negative integers are prefixed with a hyphen. |
|
1606 \item[$\bullet$] \qtybf{int\_or\_smart}: An integer or \textit{smart}. |
|
1607 \item[$\bullet$] \qtybf{int\_range}: An integer (e.g., 3) or a range |
|
1608 of nonnegative integers (e.g., $1$--$4$). The range symbol `--' can be entered as \texttt{-} (hyphen) or \texttt{\char`\\\char`\<midarrow\char`\>}. |
|
1609 |
|
1610 \item[$\bullet$] \qtybf{int\_seq}: A comma-separated sequence of ranges of integers (e.g.,~1{,}3{,}\allowbreak6--8). |
|
1611 \item[$\bullet$] \qtybf{time}: An integer followed by $\textit{min}$ (minutes), $s$ (seconds), or \textit{ms} |
|
1612 (milliseconds), or the keyword \textit{none} ($\infty$ years). |
|
1613 \item[$\bullet$] \qtybf{const}: The name of a HOL constant. |
|
1614 \item[$\bullet$] \qtybf{term}: A HOL term (e.g., ``$f~x$''). |
|
1615 \item[$\bullet$] \qtybf{term\_list}: A space-separated list of HOL terms (e.g., |
|
1616 ``$f~x$''~``$g~y$''). |
|
1617 \item[$\bullet$] \qtybf{type}: A HOL type. |
|
1618 \end{enum} |
|
1619 |
|
1620 Default values are indicated in square brackets. Boolean options have a negated |
|
1621 counterpart (e.g., \textit{auto} vs.\ \textit{no\_auto}). When setting Boolean |
|
1622 options, ``= \textit{true}'' may be omitted. |
|
1623 |
|
1624 \subsection{Mode of Operation} |
|
1625 \label{mode-of-operation} |
|
1626 |
|
1627 \begin{enum} |
|
1628 \opfalse{auto}{no\_auto} |
|
1629 Specifies whether Nitpick should be run automatically on newly entered theorems. |
|
1630 For automatic runs, \textit{user\_axioms} (\S\ref{mode-of-operation}) and |
|
1631 \textit{assms} (\S\ref{mode-of-operation}) are implicitly enabled, |
|
1632 \textit{blocking} (\S\ref{mode-of-operation}), \textit{verbose} |
|
1633 (\S\ref{output-format}), and \textit{debug} (\S\ref{output-format}) are |
|
1634 disabled, \textit{max\_potential} (\S\ref{output-format}) is taken to be 0, and |
|
1635 \textit{auto\_timeout} (\S\ref{timeouts}) is used as the time limit instead of |
|
1636 \textit{timeout} (\S\ref{timeouts}). The output is also more concise. |
|
1637 |
|
1638 \nopagebreak |
|
1639 {\small See also \textit{auto\_timeout} (\S\ref{timeouts}).} |
|
1640 |
|
1641 \optrue{blocking}{non\_blocking} |
|
1642 Specifies whether the \textbf{nitpick} command should operate synchronously. |
|
1643 The asynchronous (non-blocking) mode lets the user start proving the putative |
|
1644 theorem while Nitpick looks for a counterexample, but it can also be more |
|
1645 confusing. For technical reasons, automatic runs currently always block. |
|
1646 |
|
1647 \nopagebreak |
|
1648 {\small See also \textit{auto} (\S\ref{mode-of-operation}).} |
|
1649 |
|
1650 \optrue{falsify}{satisfy} |
|
1651 Specifies whether Nitpick should look for falsifying examples (countermodels) or |
|
1652 satisfying examples (models). This manual assumes throughout that |
|
1653 \textit{falsify} is enabled. |
|
1654 |
|
1655 \opsmart{user\_axioms}{no\_user\_axioms} |
|
1656 Specifies whether the user-defined axioms (specified using |
|
1657 \textbf{axiomatization} and \textbf{axioms}) should be considered. If the option |
|
1658 is set to \textit{smart}, Nitpick performs an ad hoc axiom selection based on |
|
1659 the constants that occur in the formula to falsify. The option is implicitly set |
|
1660 to \textit{true} for automatic runs. |
|
1661 |
|
1662 \textbf{Warning:} If the option is set to \textit{true}, Nitpick might |
|
1663 nonetheless ignore some polymorphic axioms. Counterexamples generated under |
|
1664 these conditions are tagged as ``likely genuine.'' The \textit{debug} |
|
1665 (\S\ref{output-format}) option can be used to find out which axioms were |
|
1666 considered. |
|
1667 |
|
1668 \nopagebreak |
|
1669 {\small See also \textit{auto} (\S\ref{mode-of-operation}), \textit{assms} |
|
1670 (\S\ref{mode-of-operation}), and \textit{debug} (\S\ref{output-format}).} |
|
1671 |
|
1672 \optrue{assms}{no\_assms} |
|
1673 Specifies whether the relevant assumptions in structured proof should be |
|
1674 considered. The option is implicitly enabled for automatic runs. |
|
1675 |
|
1676 \nopagebreak |
|
1677 {\small See also \textit{auto} (\S\ref{mode-of-operation}) |
|
1678 and \textit{user\_axioms} (\S\ref{mode-of-operation}).} |
|
1679 |
|
1680 \opfalse{overlord}{no\_overlord} |
|
1681 Specifies whether Nitpick should put its temporary files in |
|
1682 \texttt{\$ISABELLE\_\allowbreak HOME\_\allowbreak USER}, which is useful for |
|
1683 debugging Nitpick but also unsafe if several instances of the tool are run |
|
1684 simultaneously. This option is disabled by default unless your home directory |
|
1685 ends with \texttt{blanchet} or \texttt{blanchette}. |
|
1686 %``I thought there was only one overlord.'' --- Tobias Nipkow |
|
1687 |
|
1688 \nopagebreak |
|
1689 {\small See also \textit{debug} (\S\ref{output-format}).} |
|
1690 \end{enum} |
|
1691 |
|
1692 \subsection{Scope of Search} |
|
1693 \label{scope-of-search} |
|
1694 |
|
1695 \begin{enum} |
|
1696 \opu{card}{type}{int\_seq} |
|
1697 Specifies the sequence of cardinalities to use for a given type. For |
|
1698 \textit{nat} and \textit{int}, the cardinality fully specifies the subset used |
|
1699 to approximate the type. For example: |
|
1700 % |
|
1701 $$\hbox{\begin{tabular}{@{}rll@{}}% |
|
1702 \textit{card nat} = 4 & induces & $\{0,\, 1,\, 2,\, 3\}$ \\ |
|
1703 \textit{card int} = 4 & induces & $\{-1,\, 0,\, +1,\, +2\}$ \\ |
|
1704 \textit{card int} = 5 & induces & $\{-2,\, -1,\, 0,\, +1,\, +2\}.$% |
|
1705 \end{tabular}}$$ |
|
1706 % |
|
1707 In general: |
|
1708 % |
|
1709 $$\hbox{\begin{tabular}{@{}rll@{}}% |
|
1710 \textit{card nat} = $K$ & induces & $\{0,\, \ldots,\, K - 1\}$ \\ |
|
1711 \textit{card int} = $K$ & induces & $\{-\lceil K/2 \rceil + 1,\, \ldots,\, +\lfloor K/2 \rfloor\}.$% |
|
1712 \end{tabular}}$$ |
|
1713 % |
|
1714 For free types, and often also for \textbf{typedecl}'d types, it usually makes |
|
1715 sense to specify cardinalities as a range of the form \textit{$1$--$n$}. |
|
1716 Although function and product types are normally mapped directly to the |
|
1717 corresponding Kodkod concepts, setting |
|
1718 the cardinality of such types is also allowed and implicitly enables ``boxing'' |
|
1719 for them, as explained in the description of the \textit{box}~\qty{type} |
|
1720 and \textit{box} (\S\ref{scope-of-search}) options. |
|
1721 |
|
1722 \nopagebreak |
|
1723 {\small See also \textit{mono} (\S\ref{scope-of-search}).} |
|
1724 |
|
1725 \opt{card}{int\_seq}{$\mathbf{1}$--$\mathbf{8}$} |
|
1726 Specifies the default sequence of cardinalities to use. This can be overridden |
|
1727 on a per-type basis using the \textit{card}~\qty{type} option described above. |
|
1728 |
|
1729 \opu{max}{const}{int\_seq} |
|
1730 Specifies the sequence of maximum multiplicities to use for a given |
|
1731 (co)in\-duc\-tive datatype constructor. A constructor's multiplicity is the |
|
1732 number of distinct values that it can construct. Nonsensical values (e.g., |
|
1733 \textit{max}~[]~$=$~2) are silently repaired. This option is only available for |
|
1734 datatypes equipped with several constructors. |
|
1735 |
|
1736 \ops{max}{int\_seq} |
|
1737 Specifies the default sequence of maximum multiplicities to use for |
|
1738 (co)in\-duc\-tive datatype constructors. This can be overridden on a per-constructor |
|
1739 basis using the \textit{max}~\qty{const} option described above. |
|
1740 |
|
1741 \opusmart{wf}{const}{non\_wf} |
|
1742 Specifies whether the specified (co)in\-duc\-tively defined predicate is |
|
1743 well-founded. The option can take the following values: |
|
1744 |
|
1745 \begin{enum} |
|
1746 \item[$\bullet$] \textbf{\textit{true}}: Tentatively treat the (co)in\-duc\-tive |
|
1747 predicate as if it were well-founded. Since this is generally not sound when the |
|
1748 predicate is not well-founded, the counterexamples are tagged as ``likely |
|
1749 genuine.'' |
|
1750 |
|
1751 \item[$\bullet$] \textbf{\textit{false}}: Treat the (co)in\-duc\-tive predicate |
|
1752 as if it were not well-founded. The predicate is then unrolled as prescribed by |
|
1753 the \textit{star\_linear\_preds}, \textit{iter}~\qty{const}, and \textit{iter} |
|
1754 options. |
|
1755 |
|
1756 \item[$\bullet$] \textbf{\textit{smart}}: Try to prove that the inductive |
|
1757 predicate is well-founded using Isabelle's \textit{lexicographic\_order} and |
|
1758 \textit{sizechange} tactics. If this succeeds (or the predicate occurs with an |
|
1759 appropriate polarity in the formula to falsify), use an efficient fixed point |
|
1760 equation as specification of the predicate; otherwise, unroll the predicates |
|
1761 according to the \textit{iter}~\qty{const} and \textit{iter} options. |
|
1762 \end{enum} |
|
1763 |
|
1764 \nopagebreak |
|
1765 {\small See also \textit{iter} (\S\ref{scope-of-search}), |
|
1766 \textit{star\_linear\_preds} (\S\ref{optimizations}), and \textit{tac\_timeout} |
|
1767 (\S\ref{timeouts}).} |
|
1768 |
|
1769 \opsmart{wf}{non\_wf} |
|
1770 Specifies the default wellfoundedness setting to use. This can be overridden on |
|
1771 a per-predicate basis using the \textit{wf}~\qty{const} option above. |
|
1772 |
|
1773 \opu{iter}{const}{int\_seq} |
|
1774 Specifies the sequence of iteration counts to use when unrolling a given |
|
1775 (co)in\-duc\-tive predicate. By default, unrolling is applied for inductive |
|
1776 predicates that occur negatively and coinductive predicates that occur |
|
1777 positively in the formula to falsify and that cannot be proved to be |
|
1778 well-founded, but this behavior is influenced by the \textit{wf} option. The |
|
1779 iteration counts are automatically bounded by the cardinality of the predicate's |
|
1780 domain. |
|
1781 |
|
1782 {\small See also \textit{wf} (\S\ref{scope-of-search}) and |
|
1783 \textit{star\_linear\_preds} (\S\ref{optimizations}).} |
|
1784 |
|
1785 \opt{iter}{int\_seq}{$\mathbf{1{,}2{,}4{,}8{,}12{,}16{,}24{,}32}$} |
|
1786 Specifies the sequence of iteration counts to use when unrolling (co)in\-duc\-tive |
|
1787 predicates. This can be overridden on a per-predicate basis using the |
|
1788 \textit{iter} \qty{const} option above. |
|
1789 |
|
1790 \opt{bisim\_depth}{int\_seq}{$\mathbf{7}$} |
|
1791 Specifies the sequence of iteration counts to use when unrolling the |
|
1792 bisimilarity predicate generated by Nitpick for coinductive datatypes. A value |
|
1793 of $-1$ means that no predicate is generated, in which case Nitpick performs an |
|
1794 after-the-fact check to see if the known coinductive datatype values are |
|
1795 bidissimilar. If two values are found to be bisimilar, the counterexample is |
|
1796 tagged as ``likely genuine.'' The iteration counts are automatically bounded by |
|
1797 the sum of the cardinalities of the coinductive datatypes occurring in the |
|
1798 formula to falsify. |
|
1799 |
|
1800 \opusmart{box}{type}{dont\_box} |
|
1801 Specifies whether Nitpick should attempt to wrap (``box'') a given function or |
|
1802 product type in an isomorphic datatype internally. Boxing is an effective mean |
|
1803 to reduce the search space and speed up Nitpick, because the isomorphic datatype |
|
1804 is approximated by a subset of the possible function or pair values; |
|
1805 like other drastic optimizations, it can also prevent the discovery of |
|
1806 counterexamples. The option can take the following values: |
|
1807 |
|
1808 \begin{enum} |
|
1809 \item[$\bullet$] \textbf{\textit{true}}: Box the specified type whenever |
|
1810 practicable. |
|
1811 \item[$\bullet$] \textbf{\textit{false}}: Never box the type. |
|
1812 \item[$\bullet$] \textbf{\textit{smart}}: Box the type only in contexts where it |
|
1813 is likely to help. For example, $n$-tuples where $n > 2$ and arguments to |
|
1814 higher-order functions are good candidates for boxing. |
|
1815 \end{enum} |
|
1816 |
|
1817 Setting the \textit{card}~\qty{type} option for a function or product type |
|
1818 implicitly enables boxing for that type. |
|
1819 |
|
1820 \nopagebreak |
|
1821 {\small See also \textit{verbose} (\S\ref{output-format}) |
|
1822 and \textit{debug} (\S\ref{output-format}).} |
|
1823 |
|
1824 \opsmart{box}{dont\_box} |
|
1825 Specifies the default boxing setting to use. This can be overridden on a |
|
1826 per-type basis using the \textit{box}~\qty{type} option described above. |
|
1827 |
|
1828 \opusmart{mono}{type}{non\_mono} |
|
1829 Specifies whether the specified type should be considered monotonic when |
|
1830 enumerating scopes. If the option is set to \textit{smart}, Nitpick performs a |
|
1831 monotonicity check on the type. Setting this option to \textit{true} can reduce |
|
1832 the number of scopes tried, but it also diminishes the theoretical chance of |
|
1833 finding a counterexample, as demonstrated in \S\ref{scope-monotonicity}. |
|
1834 |
|
1835 \nopagebreak |
|
1836 {\small See also \textit{card} (\S\ref{scope-of-search}), |
|
1837 \textit{coalesce\_type\_vars} (\S\ref{scope-of-search}), and \textit{verbose} |
|
1838 (\S\ref{output-format}).} |
|
1839 |
|
1840 \opsmart{mono}{non\_box} |
|
1841 Specifies the default monotonicity setting to use. This can be overridden on a |
|
1842 per-type basis using the \textit{mono}~\qty{type} option described above. |
|
1843 |
|
1844 \opfalse{coalesce\_type\_vars}{dont\_coalesce\_type\_vars} |
|
1845 Specifies whether type variables with the same sort constraints should be |
|
1846 merged. Setting this option to \textit{true} can reduce the number of scopes |
|
1847 tried and the size of the generated Kodkod formulas, but it also diminishes the |
|
1848 theoretical chance of finding a counterexample. |
|
1849 |
|
1850 {\small See also \textit{mono} (\S\ref{scope-of-search}).} |
|
1851 \end{enum} |
|
1852 |
|
1853 \subsection{Output Format} |
|
1854 \label{output-format} |
|
1855 |
|
1856 \begin{enum} |
|
1857 \opfalse{verbose}{quiet} |
|
1858 Specifies whether the \textbf{nitpick} command should explain what it does. This |
|
1859 option is useful to determine which scopes are tried or which SAT solver is |
|
1860 used. This option is implicitly disabled for automatic runs. |
|
1861 |
|
1862 \nopagebreak |
|
1863 {\small See also \textit{auto} (\S\ref{mode-of-operation}).} |
|
1864 |
|
1865 \opfalse{debug}{no\_debug} |
|
1866 Specifies whether Nitpick should display additional debugging information beyond |
|
1867 what \textit{verbose} already displays. Enabling \textit{debug} also enables |
|
1868 \textit{verbose} and \textit{show\_all} behind the scenes. The \textit{debug} |
|
1869 option is implicitly disabled for automatic runs. |
|
1870 |
|
1871 \nopagebreak |
|
1872 {\small See also \textit{auto} (\S\ref{mode-of-operation}), \textit{overlord} |
|
1873 (\S\ref{mode-of-operation}), and \textit{batch\_size} (\S\ref{optimizations}).} |
|
1874 |
|
1875 \optrue{show\_skolems}{hide\_skolem} |
|
1876 Specifies whether the values of Skolem constants should be displayed as part of |
|
1877 counterexamples. Skolem constants correspond to bound variables in the original |
|
1878 formula and usually help us to understand why the counterexample falsifies the |
|
1879 formula. |
|
1880 |
|
1881 \nopagebreak |
|
1882 {\small See also \textit{skolemize} (\S\ref{optimizations}).} |
|
1883 |
|
1884 \opfalse{show\_datatypes}{hide\_datatypes} |
|
1885 Specifies whether the subsets used to approximate (co)in\-duc\-tive datatypes should |
|
1886 be displayed as part of counterexamples. Such subsets are sometimes helpful when |
|
1887 investigating whether a potential counterexample is genuine or spurious, but |
|
1888 their potential for clutter is real. |
|
1889 |
|
1890 \opfalse{show\_consts}{hide\_consts} |
|
1891 Specifies whether the values of constants occurring in the formula (including |
|
1892 its axioms) should be displayed along with any counterexample. These values are |
|
1893 sometimes helpful when investigating why a counterexample is |
|
1894 genuine, but they can clutter the output. |
|
1895 |
|
1896 \opfalse{show\_all}{dont\_show\_all} |
|
1897 Enabling this option effectively enables \textit{show\_skolems}, |
|
1898 \textit{show\_datatypes}, and \textit{show\_consts}. |
|
1899 |
|
1900 \opt{max\_potential}{int}{$\mathbf{1}$} |
|
1901 Specifies the maximum number of potential counterexamples to display. Setting |
|
1902 this option to 0 speeds up the search for a genuine counterexample. This option |
|
1903 is implicitly set to 0 for automatic runs. If you set this option to a value |
|
1904 greater than 1, you will need an incremental SAT solver: For efficiency, it is |
|
1905 recommended to install the JNI version of MiniSat and set \textit{sat\_solver} = |
|
1906 \textit{MiniSatJNI}. Also be aware that many of the counterexamples may look |
|
1907 identical, unless the \textit{show\_all} (\S\ref{output-format}) option is |
|
1908 enabled. |
|
1909 |
|
1910 \nopagebreak |
|
1911 {\small See also \textit{auto} (\S\ref{mode-of-operation}), |
|
1912 \textit{check\_potential} (\S\ref{authentication}), and |
|
1913 \textit{sat\_solver} (\S\ref{optimizations}).} |
|
1914 |
|
1915 \opt{max\_genuine}{int}{$\mathbf{1}$} |
|
1916 Specifies the maximum number of genuine counterexamples to display. If you set |
|
1917 this option to a value greater than 1, you will need an incremental SAT solver: |
|
1918 For efficiency, it is recommended to install the JNI version of MiniSat and set |
|
1919 \textit{sat\_solver} = \textit{MiniSatJNI}. Also be aware that many of the |
|
1920 counterexamples may look identical, unless the \textit{show\_all} |
|
1921 (\S\ref{output-format}) option is enabled. |
|
1922 |
|
1923 \nopagebreak |
|
1924 {\small See also \textit{check\_genuine} (\S\ref{authentication}) and |
|
1925 \textit{sat\_solver} (\S\ref{optimizations}).} |
|
1926 |
|
1927 \ops{eval}{term\_list} |
|
1928 Specifies the list of terms whose values should be displayed along with |
|
1929 counterexamples. This option suffers from an ``observer effect'': Nitpick might |
|
1930 find different counterexamples for different values of this option. |
|
1931 |
|
1932 \opu{format}{term}{int\_seq} |
|
1933 Specifies how to uncurry the value displayed for a variable or constant. |
|
1934 Uncurrying sometimes increases the readability of the output for high-arity |
|
1935 functions. For example, given the variable $y \mathbin{\Colon} {'a}\Rightarrow |
|
1936 {'b}\Rightarrow {'c}\Rightarrow {'d}\Rightarrow {'e}\Rightarrow {'f}\Rightarrow |
|
1937 {'g}$, setting \textit{format}~$y$ = 3 tells Nitpick to group the last three |
|
1938 arguments, as if the type had been ${'a}\Rightarrow {'b}\Rightarrow |
|
1939 {'c}\Rightarrow {'d}\times {'e}\times {'f}\Rightarrow {'g}$. In general, a list |
|
1940 of values $n_1,\ldots,n_k$ tells Nitpick to show the last $n_k$ arguments as an |
|
1941 $n_k$-tuple, the previous $n_{k-1}$ arguments as an $n_{k-1}$-tuple, and so on; |
|
1942 arguments that are not accounted for are left alone, as if the specification had |
|
1943 been $1,\ldots,1,n_1,\ldots,n_k$. |
|
1944 |
|
1945 \nopagebreak |
|
1946 {\small See also \textit{uncurry} (\S\ref{optimizations}).} |
|
1947 |
|
1948 \opt{format}{int\_seq}{$\mathbf{1}$} |
|
1949 Specifies the default format to use. Irrespective of the default format, the |
|
1950 extra arguments to a Skolem constant corresponding to the outer bound variables |
|
1951 are kept separated from the remaining arguments, the \textbf{for} arguments of |
|
1952 an inductive definitions are kept separated from the remaining arguments, and |
|
1953 the iteration counter of an unrolled inductive definition is shown alone. The |
|
1954 default format can be overridden on a per-variable or per-constant basis using |
|
1955 the \textit{format}~\qty{term} option described above. |
|
1956 \end{enum} |
|
1957 |
|
1958 %% MARK: Authentication |
|
1959 \subsection{Authentication} |
|
1960 \label{authentication} |
|
1961 |
|
1962 \begin{enum} |
|
1963 \opfalse{check\_potential}{trust\_potential} |
|
1964 Specifies whether potential counterexamples should be given to Isabelle's |
|
1965 \textit{auto} tactic to assess their validity. If a potential counterexample is |
|
1966 shown to be genuine, Nitpick displays a message to this effect and terminates. |
|
1967 |
|
1968 \nopagebreak |
|
1969 {\small See also \textit{max\_potential} (\S\ref{output-format}) and |
|
1970 \textit{auto\_timeout} (\S\ref{timeouts}).} |
|
1971 |
|
1972 \opfalse{check\_genuine}{trust\_genuine} |
|
1973 Specifies whether genuine and likely genuine counterexamples should be given to |
|
1974 Isabelle's \textit{auto} tactic to assess their validity. If a ``genuine'' |
|
1975 counterexample is shown to be spurious, the user is kindly asked to send a bug |
|
1976 report to the author at |
|
1977 \texttt{blan{\color{white}nospam}\kern-\wd\boxA{}chette@in.tum.de}. |
|
1978 |
|
1979 \nopagebreak |
|
1980 {\small See also \textit{max\_genuine} (\S\ref{output-format}) and |
|
1981 \textit{auto\_timeout} (\S\ref{timeouts}).} |
|
1982 |
|
1983 \ops{expect}{string} |
|
1984 Specifies the expected outcome, which must be one of the following: |
|
1985 |
|
1986 \begin{enum} |
|
1987 \item[$\bullet$] \textbf{\textit{genuine}}: Nitpick found a genuine counterexample. |
|
1988 \item[$\bullet$] \textbf{\textit{likely\_genuine}}: Nitpick found a ``likely |
|
1989 genuine'' counterexample (i.e., a counterexample that is genuine unless |
|
1990 it contradicts a missing axiom or a dangerous option was used inappropriately). |
|
1991 \item[$\bullet$] \textbf{\textit{potential}}: Nitpick found a potential counterexample. |
|
1992 \item[$\bullet$] \textbf{\textit{none}}: Nitpick found no counterexample. |
|
1993 \item[$\bullet$] \textbf{\textit{unknown}}: Nitpick encountered some problem (e.g., |
|
1994 Kodkod ran out of memory). |
|
1995 \end{enum} |
|
1996 |
|
1997 Nitpick emits an error if the actual outcome differs from the expected outcome. |
|
1998 This option is useful for regression testing. |
|
1999 \end{enum} |
|
2000 |
|
2001 \subsection{Optimizations} |
|
2002 \label{optimizations} |
|
2003 |
|
2004 \def\cpp{C\nobreak\raisebox{.1ex}{+}\nobreak\raisebox{.1ex}{+}} |
|
2005 |
|
2006 \sloppy |
|
2007 |
|
2008 \begin{enum} |
|
2009 \opt{sat\_solver}{string}{smart} |
|
2010 Specifies which SAT solver to use. SAT solvers implemented in C or \cpp{} tend |
|
2011 to be faster than their Java counterparts, but they can be more difficult to |
|
2012 install. Also, if you set the \textit{max\_potential} (\S\ref{output-format}) or |
|
2013 \textit{max\_genuine} (\S\ref{output-format}) option to a value greater than 1, |
|
2014 you will need an incremental SAT solver, such as \textit{MiniSatJNI} |
|
2015 (recommended) or \textit{SAT4J}. |
|
2016 |
|
2017 The supported solvers are listed below: |
|
2018 |
|
2019 \begin{enum} |
|
2020 |
|
2021 \item[$\bullet$] \textbf{\textit{MiniSat}}: MiniSat is an efficient solver |
|
2022 written in \cpp{}. To use MiniSat, set the environment variable |
|
2023 \texttt{MINISAT\_HOME} to the directory that contains the \texttt{minisat} |
|
2024 executable. The \cpp{} sources and executables for MiniSat are available at |
|
2025 \url{http://minisat.se/MiniSat.html}. Nitpick has been tested with versions 1.14 |
|
2026 and 2.0 beta (2007-07-21). |
|
2027 |
|
2028 \item[$\bullet$] \textbf{\textit{MiniSatJNI}}: The JNI (Java Native Interface) |
|
2029 version of MiniSat is bundled in \texttt{nativesolver.\allowbreak tgz}, which |
|
2030 you will find on Kodkod's web site \cite{kodkod-2009}. Unlike the standard |
|
2031 version of MiniSat, the JNI version can be used incrementally. |
|
2032 |
|
2033 \item[$\bullet$] \textbf{\textit{PicoSAT}}: PicoSAT is an efficient solver |
|
2034 written in C. It is bundled with Kodkodi and requires no further installation or |
|
2035 configuration steps. Alternatively, you can install a standard version of |
|
2036 PicoSAT and set the environment variable \texttt{PICOSAT\_HOME} to the directory |
|
2037 that contains the \texttt{picosat} executable. The C sources for PicoSAT are |
|
2038 available at \url{http://fmv.jku.at/picosat/} and are also bundled with Kodkodi. |
|
2039 Nitpick has been tested with version 913. |
|
2040 |
|
2041 \item[$\bullet$] \textbf{\textit{zChaff}}: zChaff is an efficient solver written |
|
2042 in \cpp{}. To use zChaff, set the environment variable \texttt{ZCHAFF\_HOME} to |
|
2043 the directory that contains the \texttt{zchaff} executable. The \cpp{} sources |
|
2044 and executables for zChaff are available at |
|
2045 \url{http://www.princeton.edu/~chaff/zchaff.html}. Nitpick has been tested with |
|
2046 versions 2004-05-13, 2004-11-15, and 2007-03-12. |
|
2047 |
|
2048 \item[$\bullet$] \textbf{\textit{zChaffJNI}}: The JNI version of zChaff is |
|
2049 bundled in \texttt{native\-solver.\allowbreak tgz}, which you will find on |
|
2050 Kodkod's web site \cite{kodkod-2009}. |
|
2051 |
|
2052 \item[$\bullet$] \textbf{\textit{RSat}}: RSat is an efficient solver written in |
|
2053 \cpp{}. To use RSat, set the environment variable \texttt{RSAT\_HOME} to the |
|
2054 directory that contains the \texttt{rsat} executable. The \cpp{} sources for |
|
2055 RSat are available at \url{http://reasoning.cs.ucla.edu/rsat/}. Nitpick has been |
|
2056 tested with version 2.01. |
|
2057 |
|
2058 \item[$\bullet$] \textbf{\textit{BerkMin}}: BerkMin561 is an efficient solver |
|
2059 written in C. To use BerkMin, set the environment variable |
|
2060 \texttt{BERKMIN\_HOME} to the directory that contains the \texttt{BerkMin561} |
|
2061 executable. The BerkMin executables are available at |
|
2062 \url{http://eigold.tripod.com/BerkMin.html}. |
|
2063 |
|
2064 \item[$\bullet$] \textbf{\textit{BerkMinAlloy}}: Variant of BerkMin that is |
|
2065 included with Alloy 4 and calls itself ``sat56'' in its banner text. To use this |
|
2066 version of BerkMin, set the environment variable |
|
2067 \texttt{BERKMINALLOY\_HOME} to the directory that contains the \texttt{berkmin} |
|
2068 executable. |
|
2069 |
|
2070 \item[$\bullet$] \textbf{\textit{Jerusat}}: Jerusat 1.3 is an efficient solver |
|
2071 written in C. To use Jerusat, set the environment variable |
|
2072 \texttt{JERUSAT\_HOME} to the directory that contains the \texttt{Jerusat1.3} |
|
2073 executable. The C sources for Jerusat are available at |
|
2074 \url{http://www.cs.tau.ac.il/~ale1/Jerusat1.3.tgz}. |
|
2075 |
|
2076 \item[$\bullet$] \textbf{\textit{SAT4J}}: SAT4J is a reasonably efficient solver |
|
2077 written in Java that can be used incrementally. It is bundled with Kodkodi and |
|
2078 requires no further installation or configuration steps. Do not attempt to |
|
2079 install the official SAT4J packages, because their API is incompatible with |
|
2080 Kodkod. |
|
2081 |
|
2082 \item[$\bullet$] \textbf{\textit{SAT4JLight}}: Variant of SAT4J that is |
|
2083 optimized for small problems. It can also be used incrementally. |
|
2084 |
|
2085 \item[$\bullet$] \textbf{\textit{HaifaSat}}: HaifaSat 1.0 beta is an |
|
2086 experimental solver written in \cpp. To use HaifaSat, set the environment |
|
2087 variable \texttt{HAIFASAT\_\allowbreak HOME} to the directory that contains the |
|
2088 \texttt{HaifaSat} executable. The \cpp{} sources for HaifaSat are available at |
|
2089 \url{http://cs.technion.ac.il/~gershman/HaifaSat.htm}. |
|
2090 |
|
2091 \item[$\bullet$] \textbf{\textit{smart}}: If \textit{sat\_solver} is set to |
|
2092 \textit{smart}, Nitpick selects the first solver among MiniSat, PicoSAT, zChaff, |
|
2093 RSat, BerkMin, BerkMinAlloy, and Jerusat that is recognized by Isabelle. If none |
|
2094 is found, it falls back on SAT4J, which should always be available. If |
|
2095 \textit{verbose} is enabled, Nitpick displays which SAT solver was chosen. |
|
2096 |
|
2097 \end{enum} |
|
2098 \fussy |
|
2099 |
|
2100 \opt{batch\_size}{int\_or\_smart}{smart} |
|
2101 Specifies the maximum number of Kodkod problems that should be lumped together |
|
2102 when invoking Kodkodi. Each problem corresponds to one scope. Lumping problems |
|
2103 together ensures that Kodkodi is launched less often, but it makes the verbose |
|
2104 output less readable and is sometimes detrimental to performance. If |
|
2105 \textit{batch\_size} is set to \textit{smart}, the actual value used is 1 if |
|
2106 \textit{debug} (\S\ref{output-format}) is set and 64 otherwise. |
|
2107 |
|
2108 \optrue{destroy\_constrs}{dont\_destroy\_constrs} |
|
2109 Specifies whether formulas involving (co)in\-duc\-tive datatype constructors should |
|
2110 be rewritten to use (automatically generated) discriminators and destructors. |
|
2111 This optimization can drastically reduce the size of the Boolean formulas given |
|
2112 to the SAT solver. |
|
2113 |
|
2114 \nopagebreak |
|
2115 {\small See also \textit{debug} (\S\ref{output-format}).} |
|
2116 |
|
2117 \optrue{specialize}{dont\_specialize} |
|
2118 Specifies whether functions invoked with static arguments should be specialized. |
|
2119 This optimization can drastically reduce the search space, especially for |
|
2120 higher-order functions. |
|
2121 |
|
2122 \nopagebreak |
|
2123 {\small See also \textit{debug} (\S\ref{output-format}) and |
|
2124 \textit{show\_consts} (\S\ref{output-format}).} |
|
2125 |
|
2126 \optrue{skolemize}{dont\_skolemize} |
|
2127 Specifies whether the formula should be skolemized. For performance reasons, |
|
2128 (positive) $\forall$-quanti\-fiers that occur in the scope of a higher-order |
|
2129 (positive) $\exists$-quanti\-fier are left unchanged. |
|
2130 |
|
2131 \nopagebreak |
|
2132 {\small See also \textit{debug} (\S\ref{output-format}) and |
|
2133 \textit{show\_skolems} (\S\ref{output-format}).} |
|
2134 |
|
2135 \optrue{star\_linear\_preds}{dont\_star\_linear\_preds} |
|
2136 Specifies whether Nitpick should use Kodkod's transitive closure operator to |
|
2137 encode non-well-founded ``linear inductive predicates,'' i.e., inductive |
|
2138 predicates for which each the predicate occurs in at most one assumption of each |
|
2139 introduction rule. Using the reflexive transitive closure is in principle |
|
2140 equivalent to setting \textit{iter} to the cardinality of the predicate's |
|
2141 domain, but it is usually more efficient. |
|
2142 |
|
2143 {\small See also \textit{wf} (\S\ref{scope-of-search}), \textit{debug} |
|
2144 (\S\ref{output-format}), and \textit{iter} (\S\ref{scope-of-search}).} |
|
2145 |
|
2146 \optrue{uncurry}{dont\_uncurry} |
|
2147 Specifies whether Nitpick should uncurry functions. Uncurrying has on its own no |
|
2148 tangible effect on efficiency, but it creates opportunities for the boxing |
|
2149 optimization. |
|
2150 |
|
2151 \nopagebreak |
|
2152 {\small See also \textit{box} (\S\ref{scope-of-search}), \textit{debug} |
|
2153 (\S\ref{output-format}), and \textit{format} (\S\ref{output-format}).} |
|
2154 |
|
2155 \optrue{fast\_descrs}{full\_descrs} |
|
2156 Specifies whether Nitpick should optimize the definite and indefinite |
|
2157 description operators (THE and SOME). The optimized versions usually help |
|
2158 Nitpick generate more counterexamples or at least find them faster, but only the |
|
2159 unoptimized versions are complete when all types occurring in the formula are |
|
2160 finite. |
|
2161 |
|
2162 {\small See also \textit{debug} (\S\ref{output-format}).} |
|
2163 |
|
2164 \optrue{peephole\_optim}{no\_peephole\_optim} |
|
2165 Specifies whether Nitpick should simplify the generated Kodkod formulas using a |
|
2166 peephole optimizer. These optimizations can make a significant difference. |
|
2167 Unless you are tracking down a bug in Nitpick or distrust the peephole |
|
2168 optimizer, you should leave this option enabled. |
|
2169 |
|
2170 \opt{sym\_break}{int}{20} |
|
2171 Specifies an upper bound on the number of relations for which Kodkod generates |
|
2172 symmetry breaking predicates. According to the Kodkod documentation |
|
2173 \cite{kodkod-2009-options}, ``in general, the higher this value, the more |
|
2174 symmetries will be broken, and the faster the formula will be solved. But, |
|
2175 setting the value too high may have the opposite effect and slow down the |
|
2176 solving.'' |
|
2177 |
|
2178 \opt{sharing\_depth}{int}{3} |
|
2179 Specifies the depth to which Kodkod should check circuits for equivalence during |
|
2180 the translation to SAT. The default of 3 is the same as in Alloy. The minimum |
|
2181 allowed depth is 1. Increasing the sharing may result in a smaller SAT problem, |
|
2182 but can also slow down Kodkod. |
|
2183 |
|
2184 \opfalse{flatten\_props}{dont\_flatten\_props} |
|
2185 Specifies whether Kodkod should try to eliminate intermediate Boolean variables. |
|
2186 Although this might sound like a good idea, in practice it can drastically slow |
|
2187 down Kodkod. |
|
2188 |
|
2189 \opt{max\_threads}{int}{0} |
|
2190 Specifies the maximum number of threads to use in Kodkod. If this option is set |
|
2191 to 0, Kodkod will compute an appropriate value based on the number of processor |
|
2192 cores available. |
|
2193 |
|
2194 \nopagebreak |
|
2195 {\small See also \textit{batch\_size} (\S\ref{optimizations}) and |
|
2196 \textit{timeout} (\S\ref{timeouts}).} |
|
2197 \end{enum} |
|
2198 |
|
2199 \subsection{Timeouts} |
|
2200 \label{timeouts} |
|
2201 |
|
2202 \begin{enum} |
|
2203 \opt{timeout}{time}{$\mathbf{30}$ s} |
|
2204 Specifies the maximum amount of time that the \textbf{nitpick} command should |
|
2205 spend looking for a counterexample. Nitpick tries to honor this constraint as |
|
2206 well as it can but offers no guarantees. For automatic runs, |
|
2207 \textit{auto\_timeout} is used instead. |
|
2208 |
|
2209 \nopagebreak |
|
2210 {\small See also \textit{auto} (\S\ref{mode-of-operation}) |
|
2211 and \textit{max\_threads} (\S\ref{optimizations}).} |
|
2212 |
|
2213 \opt{auto\_timeout}{time}{$\mathbf{5}$ s} |
|
2214 Specifies the maximum amount of time that Nitpick should use to find a |
|
2215 counterexample when running automatically. Nitpick tries to honor this |
|
2216 constraint as well as it can but offers no guarantees. |
|
2217 |
|
2218 \nopagebreak |
|
2219 {\small See also \textit{auto} (\S\ref{mode-of-operation}).} |
|
2220 |
|
2221 \opt{tac\_timeout}{time}{$\mathbf{500}$ ms} |
|
2222 Specifies the maximum amount of time that the \textit{auto} tactic should use |
|
2223 when checking a counterexample, and similarly that \textit{lexicographic\_order} |
|
2224 and \textit{sizechange} should use when checking whether a (co)in\-duc\-tive |
|
2225 predicate is well-founded. Nitpick tries to honor this constraint as well as it |
|
2226 can but offers no guarantees. |
|
2227 |
|
2228 \nopagebreak |
|
2229 {\small See also \textit{wf} (\S\ref{scope-of-search}), |
|
2230 \textit{check\_potential} (\S\ref{authentication}), |
|
2231 and \textit{check\_genuine} (\S\ref{authentication}).} |
|
2232 \end{enum} |
|
2233 |
|
2234 \section{Attribute Reference} |
|
2235 \label{attribute-reference} |
|
2236 |
|
2237 Nitpick needs to consider the definitions of all constants occurring in a |
|
2238 formula in order to falsify it. For constants introduced using the |
|
2239 \textbf{definition} command, the definition is simply the associated |
|
2240 \textit{\_def} axiom. In contrast, instead of using the internal representation |
|
2241 of functions synthesized by Isabelle's \textbf{primrec}, \textbf{function}, and |
|
2242 \textbf{nominal\_primrec} packages, Nitpick relies on the more natural |
|
2243 equational specification entered by the user. |
|
2244 |
|
2245 Behind the scenes, Isabelle's built-in packages and theories rely on the |
|
2246 following attributes to affect Nitpick's behavior: |
|
2247 |
|
2248 \begin{itemize} |
|
2249 \flushitem{\textit{nitpick\_def}} |
|
2250 |
|
2251 \nopagebreak |
|
2252 This attribute specifies an alternative definition of a constant. The |
|
2253 alternative definition should be logically equivalent to the constant's actual |
|
2254 axiomatic definition and should be of the form |
|
2255 |
|
2256 \qquad $c~{?}x_1~\ldots~{?}x_n \,\equiv\, t$, |
|
2257 |
|
2258 where ${?}x_1, \ldots, {?}x_n$ are distinct variables and $c$ does not occur in |
|
2259 $t$. |
|
2260 |
|
2261 \flushitem{\textit{nitpick\_simp}} |
|
2262 |
|
2263 \nopagebreak |
|
2264 This attribute specifies the equations that constitute the specification of a |
|
2265 constant. For functions defined using the \textbf{primrec}, \textbf{function}, |
|
2266 and \textbf{nominal\_\allowbreak primrec} packages, this corresponds to the |
|
2267 \textit{simps} rules. The equations must be of the form |
|
2268 |
|
2269 \qquad $c~t_1~\ldots\ t_n \,=\, u.$ |
|
2270 |
|
2271 \flushitem{\textit{nitpick\_psimp}} |
|
2272 |
|
2273 \nopagebreak |
|
2274 This attribute specifies the equations that constitute the partial specification |
|
2275 of a constant. For functions defined using the \textbf{function} package, this |
|
2276 corresponds to the \textit{psimps} rules. The conditional equations must be of |
|
2277 the form |
|
2278 |
|
2279 \qquad $\lbrakk P_1;\> \ldots;\> P_m\rbrakk \,\Longrightarrow\, c\ t_1\ \ldots\ t_n \,=\, u$. |
|
2280 |
|
2281 \flushitem{\textit{nitpick\_intro}} |
|
2282 |
|
2283 \nopagebreak |
|
2284 This attribute specifies the introduction rules of a (co)in\-duc\-tive predicate. |
|
2285 For predicates defined using the \textbf{inductive} or \textbf{coinductive} |
|
2286 command, this corresponds to the \textit{intros} rules. The introduction rules |
|
2287 must be of the form |
|
2288 |
|
2289 \qquad $\lbrakk P_1;\> \ldots;\> P_m;\> M~(c\ t_{11}\ \ldots\ t_{1n});\> |
|
2290 \ldots;\> M~(c\ t_{k1}\ \ldots\ t_{kn})\rbrakk \,\Longrightarrow\, c\ u_1\ |
|
2291 \ldots\ u_n$, |
|
2292 |
|
2293 where the $P_i$'s are side conditions that do not involve $c$ and $M$ is an |
|
2294 optional monotonic operator. The order of the assumptions is irrelevant. |
|
2295 |
|
2296 \end{itemize} |
|
2297 |
|
2298 When faced with a constant, Nitpick proceeds as follows: |
|
2299 |
|
2300 \begin{enum} |
|
2301 \item[1.] If the \textit{nitpick\_simp} set associated with the constant |
|
2302 is not empty, Nitpick uses these rules as the specification of the constant. |
|
2303 |
|
2304 \item[2.] Otherwise, if the \textit{nitpick\_psimp} set associated with |
|
2305 the constant is not empty, it uses these rules as the specification of the |
|
2306 constant. |
|
2307 |
|
2308 \item[3.] Otherwise, it looks up the definition of the constant: |
|
2309 |
|
2310 \begin{enum} |
|
2311 \item[1.] If the \textit{nitpick\_def} set associated with the constant |
|
2312 is not empty, it uses the latest rule added to the set as the definition of the |
|
2313 constant; otherwise it uses the actual definition axiom. |
|
2314 \item[2.] If the definition is of the form |
|
2315 |
|
2316 \qquad $c~{?}x_1~\ldots~{?}x_m \,\equiv\, \lambda y_1~\ldots~y_n.\; \textit{lfp}~(\lambda f.\; t)$, |
|
2317 |
|
2318 then Nitpick assumes that the definition was made using an inductive package and |
|
2319 based on the introduction rules marked with \textit{nitpick\_\allowbreak |
|
2320 ind\_\allowbreak intros} tries to determine whether the definition is |
|
2321 well-founded. |
|
2322 \end{enum} |
|
2323 \end{enum} |
|
2324 |
|
2325 As an illustration, consider the inductive definition |
|
2326 |
|
2327 \prew |
|
2328 \textbf{inductive}~\textit{odd}~\textbf{where} \\ |
|
2329 ``\textit{odd}~1'' $\,\mid$ \\ |
|
2330 ``\textit{odd}~$n\,\Longrightarrow\, \textit{odd}~(\textit{Suc}~(\textit{Suc}~n))$'' |
|
2331 \postw |
|
2332 |
|
2333 Isabelle automatically attaches the \textit{nitpick\_intro} attribute to |
|
2334 the above rules. Nitpick then uses the \textit{lfp}-based definition in |
|
2335 conjunction with these rules. To override this, we can specify an alternative |
|
2336 definition as follows: |
|
2337 |
|
2338 \prew |
|
2339 \textbf{lemma} $\mathit{odd\_def}'$ [\textit{nitpick\_def}]: ``$\textit{odd}~n \,\equiv\, n~\textrm{mod}~2 = 1$'' |
|
2340 \postw |
|
2341 |
|
2342 Nitpick then expands all occurrences of $\mathit{odd}~n$ to $n~\textrm{mod}~2 |
|
2343 = 1$. Alternatively, we can specify an equational specification of the constant: |
|
2344 |
|
2345 \prew |
|
2346 \textbf{lemma} $\mathit{odd\_simp}'$ [\textit{nitpick\_simp}]: ``$\textit{odd}~n = (n~\textrm{mod}~2 = 1)$'' |
|
2347 \postw |
|
2348 |
|
2349 Such tweaks should be done with great care, because Nitpick will assume that the |
|
2350 constant is completely defined by its equational specification. For example, if |
|
2351 you make ``$\textit{odd}~(2 * k + 1)$'' a \textit{nitpick\_simp} rule and neglect to provide rules to handle the $2 * k$ case, Nitpick will define |
|
2352 $\textit{odd}~n$ arbitrarily for even values of $n$. The \textit{debug} |
|
2353 (\S\ref{output-format}) option is extremely useful to understand what is going |
|
2354 on when experimenting with \textit{nitpick\_} attributes. |
|
2355 |
|
2356 \section{Standard ML Interface} |
|
2357 \label{standard-ml-interface} |
|
2358 |
|
2359 Nitpick provides a rich Standard ML interface used mainly for internal purposes |
|
2360 and debugging. Among the most interesting functions exported by Nitpick are |
|
2361 those that let you invoke the tool programmatically and those that let you |
|
2362 register and unregister custom coinductive datatypes. |
|
2363 |
|
2364 \subsection{Invocation of Nitpick} |
|
2365 \label{invocation-of-nitpick} |
|
2366 |
|
2367 The \textit{Nitpick} structure offers the following functions for invoking your |
|
2368 favorite counterexample generator: |
|
2369 |
|
2370 \prew |
|
2371 $\textbf{val}\,~\textit{pick\_nits\_in\_term} : \\ |
|
2372 \hbox{}\quad\textit{Proof.state} \rightarrow \textit{params} \rightarrow \textit{bool} \rightarrow \textit{term~list} \rightarrow \textit{term} \\ |
|
2373 \hbox{}\quad{\rightarrow}\; \textit{string} * \textit{Proof.state}$ \\ |
|
2374 $\textbf{val}\,~\textit{pick\_nits\_in\_subgoal} : \\ |
|
2375 \hbox{}\quad\textit{Proof.state} \rightarrow \textit{params} \rightarrow \textit{bool} \rightarrow \textit{int} \rightarrow \textit{string} * \textit{Proof.state}$ |
|
2376 \postw |
|
2377 |
|
2378 The return value is a new proof state paired with an outcome string |
|
2379 (``genuine'', ``likely\_genuine'', ``potential'', ``none'', or ``unknown''). The |
|
2380 \textit{params} type is a large record that lets you set Nitpick's options. The |
|
2381 current default options can be retrieved by calling the following function |
|
2382 defined in the \textit{NitpickIsar} structure: |
|
2383 |
|
2384 \prew |
|
2385 $\textbf{val}\,~\textit{default\_params} :\, |
|
2386 \textit{theory} \rightarrow (\textit{string} * \textit{string})~\textit{list} \rightarrow \textit{params}$ |
|
2387 \postw |
|
2388 |
|
2389 The second argument lets you override option values before they are parsed and |
|
2390 put into a \textit{params} record. Here is an example: |
|
2391 |
|
2392 \prew |
|
2393 $\textbf{val}\,~\textit{params} = \textit{NitpickIsar.default\_params}~\textit{thy}~[(\textrm{``}\textrm{timeout}\textrm{''},\, \textrm{``}\textrm{none}\textrm{''})]$ \\ |
|
2394 $\textbf{val}\,~(\textit{outcome},\, \textit{state}') = \textit{Nitpick.pick\_nits\_in\_subgoal}~\begin{aligned}[t] |
|
2395 & \textit{state}~\textit{params}~\textit{false} \\[-2pt] |
|
2396 & \textit{subgoal}\end{aligned}$ |
|
2397 \postw |
|
2398 |
|
2399 \subsection{Registration of Coinductive Datatypes} |
|
2400 \label{registration-of-coinductive-datatypes} |
|
2401 |
|
2402 \let\antiq=\textrm |
|
2403 |
|
2404 If you have defined a custom coinductive datatype, you can tell Nitpick about |
|
2405 it, so that it can use an efficient Kodkod axiomatization similar to the one it |
|
2406 uses for lazy lists. The interface for registering and unregistering coinductive |
|
2407 datatypes consists of the following pair of functions defined in the |
|
2408 \textit{Nitpick} structure: |
|
2409 |
|
2410 \prew |
|
2411 $\textbf{val}\,~\textit{register\_codatatype} :\, |
|
2412 \textit{typ} \rightarrow \textit{string} \rightarrow \textit{styp~list} \rightarrow \textit{theory} \rightarrow \textit{theory}$ \\ |
|
2413 $\textbf{val}\,~\textit{unregister\_codatatype} :\, |
|
2414 \textit{typ} \rightarrow \textit{theory} \rightarrow \textit{theory}$ |
|
2415 \postw |
|
2416 |
|
2417 The type $'a~\textit{llist}$ of lazy lists is already registered; had it |
|
2418 not been, you could have told Nitpick about it by adding the following line |
|
2419 to your theory file: |
|
2420 |
|
2421 \prew |
|
2422 $\textbf{setup}~\,\{{*}\,~\!\begin{aligned}[t] |
|
2423 & \textit{Nitpick.register\_codatatype} \\[-2pt] |
|
2424 & \qquad @\{\antiq{typ}~``\kern1pt'a~\textit{llist}\textrm{''}\}~@\{\antiq{const\_name}~ \textit{llist\_case}\} \\[-2pt] %% TYPESETTING |
|
2425 & \qquad (\textit{map}~\textit{dest\_Const}~[@\{\antiq{term}~\textit{LNil}\},\, @\{\antiq{term}~\textit{LCons}\}])\,\ {*}\}\end{aligned}$ |
|
2426 \postw |
|
2427 |
|
2428 The \textit{register\_codatatype} function takes a coinductive type, its case |
|
2429 function, and the list of its constructors. The case function must take its |
|
2430 arguments in the order that the constructors are listed. If no case function |
|
2431 with the correct signature is available, simply pass the empty string. |
|
2432 |
|
2433 On the other hand, if your goal is to cripple Nitpick, add the following line to |
|
2434 your theory file and try to check a few conjectures about lazy lists: |
|
2435 |
|
2436 \prew |
|
2437 $\textbf{setup}~\,\{{*}\,~\textit{Nitpick.unregister\_codatatype}~@\{\antiq{typ}~`` |
|
2438 \kern1pt'a~\textit{list}\textrm{''}\}\ \,{*}\}$ |
|
2439 \postw |
|
2440 |
|
2441 \section{Known Bugs and Limitations} |
|
2442 \label{known-bugs-and-limitations} |
|
2443 |
|
2444 Here are the known bugs and limitations in Nitpick at the time of writing: |
|
2445 |
|
2446 \begin{enum} |
|
2447 \item[$\bullet$] Underspecified functions defined using the \textbf{primrec}, |
|
2448 \textbf{function}, or \textbf{nominal\_\allowbreak primrec} packages can lead |
|
2449 Nitpick to generate spurious counterexamples for theorems that refer to values |
|
2450 for which the function is not defined. For example: |
|
2451 |
|
2452 \prew |
|
2453 \textbf{primrec} \textit{prec} \textbf{where} \\ |
|
2454 ``$\textit{prec}~(\textit{Suc}~n) = n$'' \\[2\smallskipamount] |
|
2455 \textbf{lemma} ``$\textit{prec}~0 = \undef$'' \\ |
|
2456 \textbf{nitpick} \\[2\smallskipamount] |
|
2457 \quad{\slshape Nitpick found a counterexample for \textit{card nat}~= 2: |
|
2458 \nopagebreak |
|
2459 \\[2\smallskipamount] |
|
2460 \hbox{}\qquad Empty assignment} \nopagebreak\\[2\smallskipamount] |
|
2461 \textbf{by}~(\textit{auto simp}: \textit{prec\_def}) |
|
2462 \postw |
|
2463 |
|
2464 Such theorems are considered bad style because they rely on the internal |
|
2465 representation of functions synthesized by Isabelle, which is an implementation |
|
2466 detail. |
|
2467 |
|
2468 \item[$\bullet$] Nitpick produces spurious counterexamples when invoked after a |
|
2469 \textbf{guess} command in a structured proof. |
|
2470 |
|
2471 \item[$\bullet$] The \textit{nitpick\_} attributes and the |
|
2472 \textit{Nitpick.register\_} functions can cause havoc if used improperly. |
|
2473 |
|
2474 \item[$\bullet$] Local definitions are not supported and result in an error. |
|
2475 |
|
2476 \item[$\bullet$] All constants and types whose names start with |
|
2477 \textit{Nitpick}{.} or \textit{NitpickDefs}{.} are reserved for internal use. |
|
2478 \end{enum} |
|
2479 |
|
2480 \let\em=\sl |
|
2481 \bibliography{../manual}{} |
|
2482 \bibliographystyle{abbrv} |
|
2483 |
|
2484 \end{document} |