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(*<*)
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theory simp = Main:
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(*>*)
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subsection{*Simplification Rules*}
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text{*\index{simplification rules}
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To facilitate simplification,
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the attribute @{text"[simp]"}\index{*simp (attribute)}
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declares theorems to be simplification rules, which the simplifier
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will use automatically. In addition, \isacommand{datatype} and
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\isacommand{primrec} declarations (and a few others)
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implicitly declare some simplification rules.
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Explicit definitions are \emph{not} declared as
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simplification rules automatically!
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Nearly any theorem can become a simplification
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rule. The simplifier will try to transform it into an equation.
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For example, the theorem
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@{prop"~P"} is turned into @{prop"P = False"}. The details
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are explained in \S\ref{sec:SimpHow}.
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The simplification attribute of theorems can be turned on and off:%
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\index{*simp del (attribute)}\REMARK{need to index attributes!switching off??}
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\begin{quote}
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\isacommand{declare} \textit{theorem-name}@{text"[simp]"}\\
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\isacommand{declare} \textit{theorem-name}@{text"[simp del]"}
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\end{quote}
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Only equations that really simplify, like \isa{rev\
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{\isacharparenleft}rev\ xs{\isacharparenright}\ {\isacharequal}\ xs} and
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\isa{xs\ {\isacharat}\ {\isacharbrackleft}{\isacharbrackright}\
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{\isacharequal}\ xs}, should be declared as default simplification rules.
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More specific ones should only be used selectively and should
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not be made default. Distributivity laws, for example, alter
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the structure of terms and can produce an exponential blow-up instead of
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simplification. A default simplification rule may
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need to be disabled in certain proofs. Frequent changes in the simplification
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status of a theorem may indicate an unwise use of defaults.
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\begin{warn}
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Simplification can run forever, for example if both $f(x) = g(x)$ and
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$g(x) = f(x)$ are simplification rules. It is the user's responsibility not
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to include simplification rules that can lead to nontermination, either on
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their own or in combination with other simplification rules.
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\end{warn}
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\begin{warn}
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It is inadvisable to toggle the simplification attribute of a
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theorem from a parent theory $A$ in a child theory $B$ for good.
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The reason is that if some theory $C$ is based both on $B$ and (via a
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differnt path) on $A$, it is not defined what the simplification attribute
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of that theorem will be in $C$: it could be either.
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\end{warn}
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*}
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subsection{*The {\tt\slshape simp} Method*}
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text{*\index{*simp (method)|bold}
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The general format of the simplification method is
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\begin{quote}
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@{text simp} \textit{list of modifiers}
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\end{quote}
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where the list of \emph{modifiers} fine tunes the behaviour and may
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be empty. Specific modifiers are discussed below. Most if not all of the
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proofs seen so far could have been performed
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with @{text simp} instead of \isa{auto}, except that @{text simp} attacks
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only the first subgoal and may thus need to be repeated --- use
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\methdx{simp_all} to simplify all subgoals.
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If nothing changes, @{text simp} fails.
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*}
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subsection{*Adding and Deleting Simplification Rules*}
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text{*
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\index{simplification rules!adding and deleting}%
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If a certain theorem is merely needed in a few proofs by simplification,
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we do not need to make it a global simplification rule. Instead we can modify
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the set of simplification rules used in a simplification step by adding rules
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to it and/or deleting rules from it. The two modifiers for this are
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\begin{quote}
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@{text"add:"} \textit{list of theorem names}\index{*add (modifier)}\\
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@{text"del:"} \textit{list of theorem names}\index{*del (modifier)}
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\end{quote}
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Or you can use a specific list of theorems and omit all others:
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\begin{quote}
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@{text"only:"} \textit{list of theorem names}\index{*only (modifier)}
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\end{quote}
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In this example, we invoke the simplifier, adding two distributive
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laws:
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\begin{quote}
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\isacommand{apply}@{text"(simp add: mod_mult_distrib add_mult_distrib)"}
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\end{quote}
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*}
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subsection{*Assumptions*}
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text{*\index{simplification!with/of assumptions}
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By default, assumptions are part of the simplification process: they are used
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as simplification rules and are simplified themselves. For example:
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*}
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lemma "\<lbrakk> xs @ zs = ys @ xs; [] @ xs = [] @ [] \<rbrakk> \<Longrightarrow> ys = zs";
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apply simp;
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done
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text{*\noindent
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The second assumption simplifies to @{term"xs = []"}, which in turn
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simplifies the first assumption to @{term"zs = ys"}, thus reducing the
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conclusion to @{term"ys = ys"} and hence to @{term"True"}.
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In some cases, using the assumptions can lead to nontermination:
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*}
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lemma "\<forall>x. f x = g (f (g x)) \<Longrightarrow> f [] = f [] @ []";
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txt{*\noindent
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An unmodified application of @{text"simp"} loops. The culprit is the
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simplification rule @{term"f x = g (f (g x))"}, which is extracted from
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the assumption. (Isabelle notices certain simple forms of
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nontermination but not this one.) The problem can be circumvented by
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telling the simplifier to ignore the assumptions:
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*}
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apply(simp (no_asm));
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done
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text{*\noindent
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Three modifiers influence the treatment of assumptions:
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\begin{description}
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\item[@{text"(no_asm)"}]\index{*no_asm (modifier)}
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means that assumptions are completely ignored.
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\item[@{text"(no_asm_simp)"}]\index{*no_asm_simp (modifier)}
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means that the assumptions are not simplified but
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are used in the simplification of the conclusion.
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\item[@{text"(no_asm_use)"}]\index{*no_asm_use (modifier)}
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means that the assumptions are simplified but are not
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used in the simplification of each other or the conclusion.
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\end{description}
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Both @{text"(no_asm_simp)"} and @{text"(no_asm_use)"} run forever on
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the problematic subgoal above.
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Only one of the modifiers is allowed, and it must precede all
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other modifiers.
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\begin{warn}
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Assumptions are simplified in a left-to-right fashion. If an
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assumption can help in simplifying one to the left of it, this may get
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overlooked. In such cases you have to rotate the assumptions explicitly:
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\isacommand{apply}@{text"("}\methdx{rotate_tac}~$n$@{text")"}
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causes a cyclic shift by $n$ positions from right to left, if $n$ is
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positive, and from left to right, if $n$ is negative.
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Beware that such rotations make proofs quite brittle.
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\end{warn}
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*}
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subsection{*Rewriting with Definitions*}
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text{*\label{sec:Simp-with-Defs}\index{simplification!with definitions}
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Constant definitions (\S\ref{sec:ConstDefinitions}) can be used as
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simplification rules, but by default they are not: the simplifier does not
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expand them automatically. Definitions are intended for introducing abstract
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concepts and not merely as abbreviations. (Contrast with syntax
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translations, \S\ref{sec:def-translations}.) Of course, we need to expand
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the definition initially, but once we have proved enough abstract properties
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of the new constant, we can forget its original definition. This style makes
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proofs more robust: if the definition has to be changed,
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only the proofs of the abstract properties will be affected.
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For example, given *}
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constdefs xor :: "bool \<Rightarrow> bool \<Rightarrow> bool"
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"xor A B \<equiv> (A \<and> \<not>B) \<or> (\<not>A \<and> B)";
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text{*\noindent
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we may want to prove
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*}
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lemma "xor A (\<not>A)";
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txt{*\noindent
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Typically, we begin by unfolding some definitions:
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\indexbold{definitions!unfolding}
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*}
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apply(simp only:xor_def);
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txt{*\noindent
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In this particular case, the resulting goal
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@{subgoals[display,indent=0]}
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can be proved by simplification. Thus we could have proved the lemma outright by
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*}(*<*)oops;lemma "xor A (\<not>A)";(*>*)
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apply(simp add: xor_def)
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(*<*)done(*>*)
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text{*\noindent
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Of course we can also unfold definitions in the middle of a proof.
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\begin{warn}
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If you have defined $f\,x\,y~\isasymequiv~t$ then you can only unfold
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occurrences of $f$ with at least two arguments. This may be helpful for unfolding
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$f$ selectively, but it may also get in the way. Defining
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$f$~\isasymequiv~\isasymlambda$x\,y.\;t$ allows to unfold all occurrences of $f$.
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\end{warn}
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There is also the special method \isa{unfold}\index{*unfold (method)|bold}
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which merely unfolds
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one or several definitions, as in \isacommand{apply}\isa{(unfold xor_def)}.
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This is can be useful in situations where \isa{simp} does too much.
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*}
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subsection{*Simplifying {\tt\slshape let}-Expressions*}
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text{*\index{simplification!of \isa{let}-expressions}\index{*let expressions}%
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Proving a goal containing \isa{let}-expressions almost invariably requires the
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@{text"let"}-con\-structs to be expanded at some point. Since
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@{text"let"}\ldots\isa{=}\ldots@{text"in"}{\ldots} is just syntactic sugar for
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the predefined constant @{term"Let"}, expanding @{text"let"}-constructs
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means rewriting with \tdx{Let_def}: *}
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lemma "(let xs = [] in xs@ys@xs) = ys";
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apply(simp add: Let_def);
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done
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text{*
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If, in a particular context, there is no danger of a combinatorial explosion
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of nested @{text"let"}s, you could even simplify with @{thm[source]Let_def} by
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default:
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*}
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declare Let_def [simp]
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subsection{*Conditional Simplification Rules*}
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text{*
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\index{conditional simplification rules}%
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So far all examples of rewrite rules were equations. The simplifier also
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accepts \emph{conditional} equations, for example
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*}
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lemma hd_Cons_tl[simp]: "xs \<noteq> [] \<Longrightarrow> hd xs # tl xs = xs";
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apply(case_tac xs, simp, simp);
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done
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text{*\noindent
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Note the use of ``\ttindexboldpos{,}{$Isar}'' to string together a
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sequence of methods. Assuming that the simplification rule
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@{term"(rev xs = []) = (xs = [])"}
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is present as well,
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the lemma below is proved by plain simplification:
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*}
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lemma "xs \<noteq> [] \<Longrightarrow> hd(rev xs) # tl(rev xs) = rev xs";
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(*<*)
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by(simp);
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(*>*)
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text{*\noindent
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The conditional equation @{thm[source]hd_Cons_tl} above
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can simplify @{term"hd(rev xs) # tl(rev xs)"} to @{term"rev xs"}
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because the corresponding precondition @{term"rev xs ~= []"}
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simplifies to @{term"xs ~= []"}, which is exactly the local
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assumption of the subgoal.
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*}
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subsection{*Automatic Case Splits*}
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text{*\label{sec:AutoCaseSplits}\indexbold{case splits}%
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Goals containing @{text"if"}-expressions\index{*if expressions!splitting of}
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are usually proved by case
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distinction on the boolean condition. Here is an example:
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*}
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lemma "\<forall>xs. if xs = [] then rev xs = [] else rev xs \<noteq> []";
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txt{*\noindent
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The goal can be split by a special method, \methdx{split}:
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*}
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apply(split split_if)
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txt{*\noindent
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@{subgoals[display,indent=0]}
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where \tdx{split_if} is a theorem that expresses splitting of
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@{text"if"}s. Because
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splitting the @{text"if"}s is usually the right proof strategy, the
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simplifier does it automatically. Try \isacommand{apply}@{text"(simp)"}
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on the initial goal above.
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This splitting idea generalizes from @{text"if"} to \sdx{case}.
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Let us simplify a case analysis over lists:\index{*list.split (theorem)}
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*}(*<*)by simp(*>*)
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lemma "(case xs of [] \<Rightarrow> zs | y#ys \<Rightarrow> y#(ys@zs)) = xs@zs";
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apply(split list.split);
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txt{*
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@{subgoals[display,indent=0]}
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The simplifier does not split
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@{text"case"}-expressions, as it does @{text"if"}-expressions,
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because with recursive datatypes it could lead to nontermination.
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Instead, the simplifier has a modifier
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@{text split}\index{*split (modifier)}
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for adding splitting rules explicitly. The
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lemma above can be proved in one step by
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*}
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(*<*)oops;
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lemma "(case xs of [] \<Rightarrow> zs | y#ys \<Rightarrow> y#(ys@zs)) = xs@zs";
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(*>*)
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apply(simp split: list.split);
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(*<*)done(*>*)
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text{*\noindent
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whereas \isacommand{apply}@{text"(simp)"} alone will not succeed.
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Every datatype $t$ comes with a theorem
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$t$@{text".split"} which can be declared to be a \bfindex{split rule} either
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locally as above, or by giving it the \attrdx{split} attribute globally:
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*}
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declare list.split [split]
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text{*\noindent
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The @{text"split"} attribute can be removed with the @{text"del"} modifier,
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either locally
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*}
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(*<*)
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lemma "dummy=dummy";
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(*>*)
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apply(simp split del: split_if);
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(*<*)
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oops;
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(*>*)
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text{*\noindent
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or globally:
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*}
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declare list.split [split del]
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text{*
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Polished proofs typically perform splitting within @{text simp} rather than
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invoking the @{text split} method. However, if a goal contains
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several @{text if} and @{text case} expressions,
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the @{text split} method can be
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helpful in selectively exploring the effects of splitting.
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The split rules shown above are intended to affect only the subgoal's
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conclusion. If you want to split an @{text"if"} or @{text"case"}-expression
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in the assumptions, you have to apply \tdx{split_if_asm} or
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$t$@{text".split_asm"}: *}
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lemma "if xs = [] then ys \<noteq> [] else ys = [] \<Longrightarrow> xs @ ys \<noteq> []"
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apply(split split_if_asm)
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txt{*\noindent
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Unlike splitting the conclusion, this step creates two
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separate subgoals, which here can be solved by @{text"simp_all"}:
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|
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@{subgoals[display,indent=0]}
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|
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If you need to split both in the assumptions and the conclusion,
|
|
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use $t$@{text".splits"} which subsumes $t$@{text".split"} and
|
|
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$t$@{text".split_asm"}. Analogously, there is @{thm[source]if_splits}.
|
|
353 |
|
|
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\begin{warn}
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|
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The simplifier merely simplifies the condition of an
|
|
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\isa{if}\index{*if expressions!simplification of} but not the
|
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|
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\isa{then} or \isa{else} parts. The latter are simplified only after the
|
|
358 |
condition reduces to \isa{True} or \isa{False}, or after splitting. The
|
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|
359 |
same is true for \sdx{case}-expressions: only the selector is
|
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|
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simplified at first, until either the expression reduces to one of the
|
|
361 |
cases or it is split.
|
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|
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\end{warn}
|
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|
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*}
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|
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(*<*)
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|
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by(simp_all)
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|
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(*>*)
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|
367 |
|
11214
|
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subsection{*Tracing*}
|
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|
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text{*\indexbold{tracing the simplifier}
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|
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Using the simplifier effectively may take a bit of experimentation. Set the
|
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|
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\isa{trace_simp}\index{*trace_simp (flag)} flag\index{flags}
|
|
372 |
to get a better idea of what is going
|
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|
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on:
|
|
374 |
*}
|
|
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|
|
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ML "set trace_simp";
|
|
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lemma "rev [a] = []";
|
|
378 |
apply(simp);
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|
379 |
(*<*)oops(*>*)
|
|
380 |
|
|
381 |
text{*\noindent
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|
382 |
produces the trace
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|
383 |
|
|
384 |
\begin{ttbox}\makeatother
|
|
385 |
Applying instance of rewrite rule:
|
|
386 |
rev (?x1 \# ?xs1) == rev ?xs1 @ [?x1]
|
|
387 |
Rewriting:
|
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|
388 |
rev [a] == rev [] @ [a]
|
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|
389 |
Applying instance of rewrite rule:
|
|
390 |
rev [] == []
|
|
391 |
Rewriting:
|
|
392 |
rev [] == []
|
|
393 |
Applying instance of rewrite rule:
|
|
394 |
[] @ ?y == ?y
|
|
395 |
Rewriting:
|
10971
|
396 |
[] @ [a] == [a]
|
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|
397 |
Applying instance of rewrite rule:
|
|
398 |
?x3 \# ?t3 = ?t3 == False
|
|
399 |
Rewriting:
|
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|
400 |
[a] = [] == False
|
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|
401 |
\end{ttbox}
|
|
402 |
|
11309
|
403 |
The trace lists each rule being applied, both in its general form and the
|
|
404 |
instance being used. For conditional rules, the trace lists the rule
|
|
405 |
it is trying to rewrite and gives the result of attempting to prove
|
|
406 |
each of the rule's conditions. Many other hints about the simplifier's
|
|
407 |
actions will appear.
|
|
408 |
|
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|
409 |
In more complicated cases, the trace can be quite lengthy. Invocations of the
|
|
410 |
simplifier are often nested, for instance when solving conditions of rewrite
|
|
411 |
rules. Thus it is advisable to reset it:
|
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|
412 |
*}
|
|
413 |
|
|
414 |
ML "reset trace_simp";
|
|
415 |
|
|
416 |
(*<*)
|
9922
|
417 |
end
|
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|
418 |
(*>*)
|