doc-src/Ref/defining.tex

changed priority of ::

%% $Id$
\chapter{Defining Logics} \label{Defining-Logics}
This chapter explains how to define new formal systems --- in particular,
their concrete syntax.  While Isabelle can be regarded as a theorem prover
for set theory, higher-order logic or the sequent calculus, its
distinguishing feature is support for the definition of new logics.

Isabelle logics are hierarchies of theories, which are described and
illustrated in 
\iflabelundefined{sec:defining-theories}{{\em Introduction to Isabelle}}%
{\S\ref{sec:defining-theories}}.  That material, together with the theory
files provided in the examples directories, should suffice for all simple
applications.  The easiest way to define a new theory is by modifying a
copy of an existing theory.

This chapter documents the meta-logic syntax, mixfix declarations and
pretty printing.  The extended examples in \S\ref{sec:min_logics}
demonstrate the logical aspects of the definition of theories.


\section{Priority grammars} \label{sec:priority_grammars}
\index{priority grammars|(} 

A context-free grammar contains a set of {\bf nonterminal symbols}, a set of
{\bf terminal symbols} and a set of {\bf productions}\index{productions}.
Productions have the form ${A=\gamma}$, where $A$ is a nonterminal and
$\gamma$ is a string of terminals and nonterminals.  One designated
nonterminal is called the {\bf start symbol}.  The language defined by the
grammar consists of all strings of terminals that can be derived from the
start symbol by applying productions as rewrite rules.

The syntax of an Isabelle logic is specified by a {\bf priority
  grammar}.\index{priorities} Each nonterminal is decorated by an integer
priority, as in~$A^{(p)}$.  A nonterminal $A^{(p)}$ in a derivation may be
rewritten using a production $A^{(q)} = \gamma$ only if~$p \le q$.  Any
priority grammar can be translated into a normal context free grammar by
introducing new nonterminals and productions.

Formally, a set of context free productions $G$ induces a derivation
relation $\longrightarrow@G$.  Let $\alpha$ and $\beta$ denote strings of
terminal or nonterminal symbols.  Then
\[ \alpha\, A^{(p)}\, \beta ~\longrightarrow@G~ \alpha\,\gamma\,\beta \] 
if and only if $G$ contains some production $A^{(q)}=\gamma$ for~$p \le q$.

The following simple grammar for arithmetic expressions demonstrates how
binding power and associativity of operators can be enforced by priorities.
\begin{center}
\begin{tabular}{rclr}
  $A^{(9)}$ & = & {\tt0} \\
  $A^{(9)}$ & = & {\tt(} $A^{(0)}$ {\tt)} \\
  $A^{(0)}$ & = & $A^{(0)}$ {\tt+} $A^{(1)}$ \\
  $A^{(2)}$ & = & $A^{(3)}$ {\tt*} $A^{(2)}$ \\
  $A^{(3)}$ & = & {\tt-} $A^{(3)}$
\end{tabular}
\end{center}
The choice of priorities determines that {\tt -} binds tighter than {\tt *},
which binds tighter than {\tt +}.  Furthermore {\tt +} associates to the
left and {\tt *} to the right.

For clarity, grammars obey these conventions:
\begin{itemize}
\item All priorities must lie between~0 and \ttindex{max_pri}, which is a
  some fixed integer.  Sometimes {\tt max_pri} is written as $\infty$.
\item Priority 0 on the right-hand side and priority \ttindex{max_pri} on
  the left-hand side may be omitted.
\item The production $A^{(p)} = \alpha$ is written as $A = \alpha~(p)$; the
  priority of the left-hand side actually appears in a column on the far
  right.  
\item Alternatives are separated by~$|$.  
\item Repetition is indicated by dots~(\dots) in an informal but obvious
  way.
\end{itemize}

Using these conventions and assuming $\infty=9$, the grammar
takes the form
\begin{center}
\begin{tabular}{rclc}
$A$ & = & {\tt0} & \hspace*{4em} \\
 & $|$ & {\tt(} $A$ {\tt)} \\
 & $|$ & $A$ {\tt+} $A^{(1)}$ & (0) \\
 & $|$ & $A^{(3)}$ {\tt*} $A^{(2)}$ & (2) \\
 & $|$ & {\tt-} $A^{(3)}$ & (3)
\end{tabular}
\end{center}
\index{priority grammars|)}


\begin{figure}
\begin{center}
\begin{tabular}{rclc}
$prop$ &=& {\tt PROP} $aprop$ ~~$|$~~ {\tt(} $prop$ {\tt)} \\
     &$|$& $logic^{(3)}$ {\tt ==} $logic^{(2)}$ & (2) \\
     &$|$& $logic^{(3)}$ {\tt =?=} $logic^{(2)}$ & (2) \\
     &$|$& $prop^{(2)}$ {\tt ==>} $prop^{(1)}$ & (1) \\
     &$|$& {\tt[|} $prop$ {\tt;} \dots {\tt;} $prop$ {\tt|]} {\tt==>} $prop^{(1)}$ & (1) \\
     &$|$& {\tt!!} $idts$ {\tt.} $prop$ & (0) \\\\
$logic$ &=& $prop$ ~~$|$~~ $fun$ \\\\
$aprop$ &=& $id$ ~~$|$~~ $var$
    ~~$|$~~ $fun^{(\infty)}$ {\tt(} $logic$ {\tt,} \dots {\tt,} $logic$ {\tt)} \\\\
$fun$ &=& $id$ ~~$|$~~ $var$ ~~$|$~~ {\tt(} $fun$ {\tt)} \\
    &$|$& $fun^{(\infty)}$ {\tt(} $logic$ {\tt,} \dots {\tt,} $logic$ {\tt)} \\
    &$|$& $fun^{(4)}$ {\tt::} $type$ & (4) \\
    &$|$& {\tt \%} $idts$ {\tt.} $logic$ & (0) \\\\
$idts$ &=& $idt$ ~~$|$~~ $idt^{(1)}$ $idts$ \\\\
$idt$ &=& $id$ ~~$|$~~ {\tt(} $idt$ {\tt)} \\
    &$|$& $id$ {\tt ::} $type$ & (0) \\\\
$type$ &=& $tid$ ~~$|$~~ $tvar$ ~~$|$~~ $tid$ {\tt::} $sort$
  ~~$|$~~ $tvar$ {\tt::} $sort$ \\
     &$|$& $id$ ~~$|$~~ $type^{(\infty)}$ $id$
                ~~$|$~~ {\tt(} $type$ {\tt,} \dots {\tt,} $type$ {\tt)} $id$ \\
     &$|$& $type^{(1)}$ {\tt =>} $type$ & (0) \\
     &$|$& {\tt[}  $type$ {\tt,} \dots {\tt,} $type$ {\tt]} {\tt=>} $type$&(0)\\
     &$|$& {\tt(} $type$ {\tt)} \\\\
$sort$ &=& $id$ ~~$|$~~ {\tt\ttlbrace\ttrbrace}
                ~~$|$~~ {\tt\ttlbrace} $id$ {\tt,} \dots {\tt,} $id$ {\tt\ttrbrace}
\end{tabular}
\index{*PROP symbol}
\index{*== symbol}\index{*=?= symbol}\index{*==> symbol}
\index{*:: symbol}\index{*=> symbol}
\index{sort constraints}
%the index command: a percent is permitted, but braces must match!
\index{%@{\tt\%} symbol}
\index{{}@{\tt\ttlbrace} symbol}\index{{}@{\tt\ttrbrace} symbol}
\index{*[ symbol}\index{*] symbol}
\index{*"!"! symbol}
\index{*"["| symbol}
\index{*"|"] symbol}
\end{center}
\caption{Meta-logic syntax}\label{fig:pure_gram}
\end{figure}


\section{The Pure syntax} \label{sec:basic_syntax}
\index{syntax!Pure|(}

At the root of all object-logics lies the theory \thydx{Pure}.  It
contains, among many other things, the Pure syntax.  An informal account of
this basic syntax (types, terms and formulae) appears in 
\iflabelundefined{sec:forward}{{\em Introduction to Isabelle}}%
{\S\ref{sec:forward}}.  A more precise description using a priority grammar
appears in Fig.\ts\ref{fig:pure_gram}.  It defines the following
nonterminals:
\begin{ttdescription}
\item[\ndxbold{prop}] denotes terms of type {\tt prop}.  These are formulae
  of the meta-logic.

\item[\ndxbold{aprop}] denotes atomic propositions.  These typically
  include the judgement forms of the object-logic; its definition
  introduces a meta-level predicate for each judgement form.

\item[\ndxbold{logic}] denotes terms whose type belongs to class
  \cldx{logic}.  As the syntax is extended by new object-logics, more
  productions for {\tt logic} are added automatically (see below).

  \item[\ndxbold{fun}] denotes terms potentially of function type.

  \item[\ndxbold{type}] denotes types of the meta-logic.

  \item[\ndxbold{idts}] denotes a list of identifiers, possibly constrained
    by types.
\end{ttdescription}

\begin{warn}
  In {\tt idts}, note that \verb|x::nat y| is parsed as \verb|x::(nat y)|,
  treating {\tt y} like a type constructor applied to {\tt nat}.  The
  likely result is an error message.  To avoid this interpretation, use
  parentheses and write \verb|(x::nat) y|.
  \index{type constraints}\index{*:: symbol}

  Similarly, \verb|x::nat y::nat| is parsed as \verb|x::(nat y::nat)| and
  yields an error.  The correct form is \verb|(x::nat) (y::nat)|.
\end{warn}

\subsection{Logical types and default syntax}\label{logical-types}
\index{lambda calc@$\lambda$-calculus}

Isabelle's representation of mathematical languages is based on the simply
typed $\lambda$-calculus.  All logical types, namely those of class
\cldx{logic}, are automatically equipped with a basic syntax of types,
identifiers, variables, parentheses, $\lambda$-abstractions and
applications.

More precisely, for each type constructor $ty$ with arity $(\vec{s})c$,
where $c$ is a subclass of \cldx{logic}, several productions are added:
\begin{center}
\begin{tabular}{rclc}
$ty$ &=& $id$ ~~$|$~~ $var$ ~~$|$~~ {\tt(} $ty$ {\tt)} \\
  &$|$& $fun^{(\infty)}$ {\tt(} $logic$ {\tt,} \dots {\tt,} $logic$ {\tt)}\\
  &$|$& $ty^{(4)}$ {\tt::} $type$ ~~~~~~~ (3) \\\\
$logic$ &=& $ty$
\end{tabular}
\end{center}

\begin{warn}
  Type constraints bind very weakly. For example, \verb!x<y::nat! is normally
  parsed as \verb!(x<y)::nat!, unless \verb$<$ has priority of 4 or less, in
  which case the string is likely to be ambiguous. The correct form is
  \verb!x<(y::nat)!.
\end{warn}

\subsection{Lexical matters}
The parser does not process input strings directly.  It operates on token
lists provided by Isabelle's \bfindex{lexer}.  There are two kinds of
tokens: \bfindex{delimiters} and \bfindex{name tokens}.

\index{reserved words}
Delimiters can be regarded as reserved words of the syntax.  You can
add new ones when extending theories.  In Fig.\ts\ref{fig:pure_gram} they
appear in typewriter font, for example {\tt ==}, {\tt =?=} and
{\tt PROP}\@.

Name tokens have a predefined syntax.  The lexer distinguishes four
disjoint classes of names: \rmindex{identifiers}, \rmindex{unknowns}, type
identifiers\index{type identifiers}, type unknowns\index{type unknowns}.
They are denoted by \ndxbold{id}, \ndxbold{var}, \ndxbold{tid},
\ndxbold{tvar}, respectively.  Typical examples are {\tt x}, {\tt ?x7},
{\tt 'a}, {\tt ?'a3}.  Here is the precise syntax:
\begin{eqnarray*}
id        & =   & letter~quasiletter^* \\
var       & =   & \mbox{\tt ?}id ~~|~~ \mbox{\tt ?}id\mbox{\tt .}nat \\
tid       & =   & \mbox{\tt '}id \\
tvar      & =   & \mbox{\tt ?}tid ~~|~~
                  \mbox{\tt ?}tid\mbox{\tt .}nat \\[1ex]
letter    & =   & \mbox{one of {\tt a}\dots {\tt z} {\tt A}\dots {\tt Z}} \\
digit     & =   & \mbox{one of {\tt 0}\dots {\tt 9}} \\
quasiletter & =  & letter ~~|~~ digit ~~|~~ \mbox{\tt _} ~~|~~ \mbox{\tt '} \\
nat       & =   & digit^+
\end{eqnarray*}
A \ndxbold{var} or \ndxbold{tvar} describes an unknown, which is internally
a pair of base name and index (\ML\ type \mltydx{indexname}).  These
components are either separated by a dot as in {\tt ?x.1} or {\tt ?x7.3} or
run together as in {\tt ?x1}.  The latter form is possible if the base name
does not end with digits.  If the index is 0, it may be dropped altogether:
{\tt ?x} abbreviates both {\tt ?x0} and {\tt ?x.0}.

The lexer repeatedly takes the maximal prefix of the input string that
forms a valid token.  A maximal prefix that is both a delimiter and a name
is treated as a delimiter.  Spaces, tabs and newlines are separators; they
never occur within tokens.

Delimiters need not be separated by white space.  For example, if {\tt -}
is a delimiter but {\tt --} is not, then the string {\tt --} is treated as
two consecutive occurrences of the token~{\tt -}.  In contrast, \ML\ 
treats {\tt --} as a single symbolic name.  The consequence of Isabelle's
more liberal scheme is that the same string may be parsed in different ways
after extending the syntax: after adding {\tt --} as a delimiter, the input
{\tt --} is treated as a single token.

Although name tokens are returned from the lexer rather than the parser, it
is more logical to regard them as nonterminals.  Delimiters, however, are
terminals; they are just syntactic sugar and contribute nothing to the
abstract syntax tree.


\subsection{*Inspecting the syntax}
\begin{ttbox}
syn_of              : theory -> Syntax.syntax
Syntax.print_syntax : Syntax.syntax -> unit
Syntax.print_gram   : Syntax.syntax -> unit
Syntax.print_trans  : Syntax.syntax -> unit
\end{ttbox}
The abstract type \mltydx{Syntax.syntax} allows manipulation of syntaxes
in \ML.  You can display values of this type by calling the following
functions:
\begin{ttdescription}
\item[\ttindexbold{syn_of} {\it thy}] returns the syntax of the Isabelle
  theory~{\it thy} as an \ML\ value.

\item[\ttindexbold{Syntax.print_syntax} {\it syn}] shows virtually all
  information contained in the syntax {\it syn}.  The displayed output can
  be large.  The following two functions are more selective.

\item[\ttindexbold{Syntax.print_gram} {\it syn}] shows the grammar part
  of~{\it syn}, namely the lexicon, roots and productions.  These are
  discussed below.

\item[\ttindexbold{Syntax.print_trans} {\it syn}] shows the translation
  part of~{\it syn}, namely the constants, parse/print macros and
  parse/print translations.
\end{ttdescription}

Let us demonstrate these functions by inspecting Pure's syntax.  Even that
is too verbose to display in full.
\begin{ttbox}\index{*Pure theory}
Syntax.print_syntax (syn_of Pure.thy);
{\out lexicon: "!!" "\%" "(" ")" "," "." "::" ";" "==" "==>" \dots}
{\out roots: logic type fun prop}
{\out prods:}
{\out   type = tid  (1000)}
{\out   type = tvar  (1000)}
{\out   type = id  (1000)}
{\out   type = tid "::" sort[0]  => "_ofsort" (1000)}
{\out   type = tvar "::" sort[0]  => "_ofsort" (1000)}
{\out   \vdots}
\ttbreak
{\out consts: "_K" "_appl" "_aprop" "_args" "_asms" "_bigimpl" \dots}
{\out parse_ast_translation: "_appl" "_bigimpl" "_bracket"}
{\out   "_idtyp" "_lambda" "_tapp" "_tappl"}
{\out parse_rules:}
{\out parse_translation: "!!" "_K" "_abs" "_aprop"}
{\out print_translation: "all"}
{\out print_rules:}
{\out print_ast_translation: "==>" "_abs" "_idts" "fun"}
\end{ttbox}

As you can see, the output is divided into labelled sections.  The grammar
is represented by {\tt lexicon}, {\tt roots} and {\tt prods}.  The rest
refers to syntactic translations and macro expansion.  Here is an
explanation of the various sections.
\begin{description}
  \item[{\tt lexicon}] lists the delimiters used for lexical
    analysis.\index{delimiters} 

  \item[{\tt roots}] lists the grammar's nonterminal symbols.  You must
    name the desired root when calling lower level functions or specifying
    macros.  Higher level functions usually expect a type and derive the
    actual root as described in~\S\ref{sec:grammar}.

  \item[{\tt prods}] lists the \rmindex{productions} of the priority grammar.
    The nonterminal $A^{(n)}$ is rendered in {\sc ascii} as {\tt $A$[$n$]}.
    Each delimiter is quoted.  Some productions are shown with {\tt =>} and
    an attached string.  These strings later become the heads of parse
    trees; they also play a vital role when terms are printed (see
    \S\ref{sec:asts}).

    Productions with no strings attached are called {\bf copy
      productions}\indexbold{productions!copy}.  Their right-hand side must
    have exactly one nonterminal symbol (or name token).  The parser does
    not create a new parse tree node for copy productions, but simply
    returns the parse tree of the right-hand symbol.

    If the right-hand side consists of a single nonterminal with no
    delimiters, then the copy production is called a {\bf chain
      production}.  Chain productions act as abbreviations:
    conceptually, they are removed from the grammar by adding new
    productions.  Priority information attached to chain productions is
    ignored; only the dummy value $-1$ is displayed.

  \item[{\tt consts}, {\tt parse_rules}, {\tt print_rules}]
    relate to macros (see \S\ref{sec:macros}).

  \item[{\tt parse_ast_translation}, {\tt print_ast_translation}]
    list sets of constants that invoke translation functions for abstract
    syntax trees.  Section \S\ref{sec:asts} below discusses this obscure
    matter.\index{constants!for translations}

  \item[{\tt parse_translation}, {\tt print_translation}] list sets
    of constants that invoke translation functions for terms (see
    \S\ref{sec:tr_funs}).
\end{description}
\index{syntax!Pure|)}


\section{Mixfix declarations} \label{sec:mixfix}
\index{mixfix declarations|(} 

When defining a theory, you declare new constants by giving their names,
their type, and an optional {\bf mixfix annotation}.  Mixfix annotations
allow you to extend Isabelle's basic $\lambda$-calculus syntax with
readable notation.  They can express any context-free priority grammar.
Isabelle syntax definitions are inspired by \OBJ~\cite{OBJ}; they are more
general than the priority declarations of \ML\ and Prolog.  

A mixfix annotation defines a production of the priority grammar.  It
describes the concrete syntax, the translation to abstract syntax, and the
pretty printing.  Special case annotations provide a simple means of
specifying infix operators, binders and so forth.

\subsection{Grammar productions}\label{sec:grammar}\index{productions}

Let us examine the treatment of the production
\[ A^{(p)}= w@0\, A@1^{(p@1)}\, w@1\, A@2^{(p@2)}\, \ldots\,  
                  A@n^{(p@n)}\, w@n. \]
Here $A@i^{(p@i)}$ is a nonterminal with priority~$p@i$ for $i=1$,
\ldots,~$n$, while $w@0$, \ldots,~$w@n$ are strings of terminals.
In the corresponding mixfix annotation, the priorities are given separately
as $[p@1,\ldots,p@n]$ and~$p$.  The nonterminal symbols are identified with
types~$\tau$, $\tau@1$, \ldots,~$\tau@n$ respectively, and the production's
effect on nonterminals is expressed as the function type
\[ [\tau@1, \ldots, \tau@n]\To \tau. \]
Finally, the template
\[ w@0  \;_\; w@1 \;_\; \ldots \;_\; w@n \]
describes the strings of terminals.

A simple type is typically declared for each nonterminal symbol.  In
first-order logic, type~$i$ stands for terms and~$o$ for formulae.  Only
the outermost type constructor is taken into account.  For example, any
type of the form $\sigma list$ stands for a list;  productions may refer
to the symbol {\tt list} and will apply to lists of any type.

The symbol associated with a type is called its {\bf root} since it may
serve as the root of a parse tree.  Precisely, the root of $(\tau@1, \dots,
\tau@n)ty$ is $ty$, where $\tau@1$, \ldots, $\tau@n$ are types and $ty$ is
a type constructor.  Type infixes are a special case of this; in
particular, the root of $\tau@1 \To \tau@2$ is {\tt fun}.  Finally, the
root of a type variable is {\tt logic}; general productions might
refer to this nonterminal.

Identifying nonterminals with types allows a constant's type to specify
syntax as well.  We can declare the function~$f$ to have type $[\tau@1,
\ldots, \tau@n]\To \tau$ and, through a mixfix annotation, specify the
layout of the function's $n$ arguments.  The constant's name, in this
case~$f$, will also serve as the label in the abstract syntax tree.  There
are two exceptions to this treatment of constants:
\begin{enumerate}\index{constants!syntactic}
  \item A production need not map directly to a logical function.  In this
    case, you must declare a constant whose purpose is purely syntactic.
    By convention such constants begin with the symbol~{\tt\at}, 
    ensuring that they can never be written in formulae.

  \item A copy production has no associated constant.\index{productions!copy}
\end{enumerate}
There is something artificial about this representation of productions,
but it is convenient, particularly for simple theory extensions.

\subsection{The general mixfix form}
Here is a detailed account of mixfix declarations.  Suppose the following
line occurs within the {\tt consts} section of a {\tt .thy} file:
\begin{center}
  {\tt $c$ ::\ "$\sigma$" ("$template$" $ps$ $p$)}
\end{center}
This constant declaration and mixfix annotation are interpreted as follows:
\begin{itemize}\index{productions}
\item The string {\tt $c$} is the name of the constant associated with the
  production; unless it is a valid identifier, it must be enclosed in
  quotes.  If $c$ is empty (given as~{\tt ""}) then this is a copy
  production.\index{productions!copy} Otherwise, parsing an instance of the
  phrase $template$ generates the \AST{} {\tt ("$c$" $a@1$ $\ldots$
    $a@n$)}, where $a@i$ is the \AST{} generated by parsing the $i$-th
  argument.

  \item The constant $c$, if non-empty, is declared to have type $\sigma$.

  \item The string $template$ specifies the right-hand side of
    the production.  It has the form
    \[ w@0 \;_\; w@1 \;_\; \ldots \;_\; w@n, \] 
    where each occurrence of {\tt_} denotes an argument position and
    the~$w@i$ do not contain~{\tt _}.  (If you want a literal~{\tt _} in
    the concrete syntax, you must escape it as described below.)  The $w@i$
    may consist of \rmindex{delimiters}, spaces or 
    \rmindex{pretty printing} annotations (see below).

  \item The type $\sigma$ specifies the production's nonterminal symbols
    (or name tokens).  If $template$ is of the form above then $\sigma$
    must be a function type with at least~$n$ argument positions, say
    $\sigma = [\tau@1, \dots, \tau@n] \To \tau$.  Nonterminal symbols are
    derived from the types $\tau@1$, \ldots,~$\tau@n$, $\tau$ as described
    above.  Any of these may be function types; the corresponding root is
    then \tydx{fun}.

  \item The optional list~$ps$ may contain at most $n$ integers, say {\tt
      [$p@1$, $\ldots$, $p@m$]}, where $p@i$ is the minimal
    priority\indexbold{priorities} required of any phrase that may appear
    as the $i$-th argument.  Missing priorities default to~0.

  \item The integer $p$ is the priority of this production.  If omitted, it
    defaults to the maximal priority.
    Priorities range between 0 and \ttindexbold{max_pri} (= 1000).
\end{itemize}
%
The declaration {\tt $c$ ::\ "$\sigma$" ("$template$")} specifies no
priorities.  The resulting production puts no priority constraints on any
of its arguments and has maximal priority itself.  Omitting priorities in
this manner will introduce syntactic ambiguities unless the production's
right-hand side is fully bracketed, as in \verb|"if _ then _ else _ fi"|.

Omitting the mixfix annotation completely, as in {\tt $c$ ::\ "$\sigma$"},
is sensible only if~$c$ is an identifier.  Otherwise you will be unable to
write terms involving~$c$.

\begin{warn}
  Theories must sometimes declare types for purely syntactic purposes.  One
  example is \tydx{type}, the built-in type of types.  This is a `type of
  all types' in the syntactic sense only.  Do not declare such types under
  {\tt arities} as belonging to class {\tt logic}\index{*logic class}, for
  that would allow their use in arbitrary Isabelle
  expressions~(\S\ref{logical-types}).
\end{warn}

\subsection{Example: arithmetic expressions}
\index{examples!of mixfix declarations}
This theory specification contains a {\tt consts} section with mixfix
declarations encoding the priority grammar from
\S\ref{sec:priority_grammars}:
\begin{ttbox}
EXP = Pure +
types
  exp
arities
  exp :: logic
consts
  "0" :: "exp"                ("0"      9)
  "+" :: "[exp, exp] => exp"  ("_ + _"  [0, 1] 0)
  "*" :: "[exp, exp] => exp"  ("_ * _"  [3, 2] 2)
  "-" :: "exp => exp"         ("- _"    [3] 3)
end
\end{ttbox}
The {\tt arities} declaration causes {\tt exp} to be added as a new root.
If you put this into a file {\tt EXP.thy} and load it via {\tt
  use_thy "EXP"}, you can run some tests:
\begin{ttbox}
val read_exp = Syntax.test_read (syn_of EXP.thy) "exp";
{\out val it = fn : string -> unit}
read_exp "0 * 0 * 0 * 0 + 0 + 0 + 0";
{\out tokens: "0" "*" "0" "*" "0" "*" "0" "+" "0" "+" "0" "+" "0"}
{\out raw: ("+" ("+" ("+" ("*" "0" ("*" "0" ("*" "0" "0"))) "0") "0") "0")}
{\out \vdots}
read_exp "0 + - 0 + 0";
{\out tokens: "0" "+" "-" "0" "+" "0"}
{\out raw: ("+" ("+" "0" ("-" "0")) "0")}
{\out \vdots}
\end{ttbox}
The output of \ttindex{Syntax.test_read} includes the token list ({\tt
  tokens}) and the raw \AST{} directly derived from the parse tree,
ignoring parse \AST{} translations.  The rest is tracing information
provided by the macro expander (see \S\ref{sec:macros}).

Executing {\tt Syntax.print_gram} reveals the productions derived
from our mixfix declarations (lots of additional information deleted):
\begin{ttbox}
Syntax.print_gram (syn_of EXP.thy);
{\out exp = "0"  => "0" (9)}
{\out exp = exp[0] "+" exp[1]  => "+" (0)}
{\out exp = exp[3] "*" exp[2]  => "*" (2)}
{\out exp = "-" exp[3]  => "-" (3)}
\end{ttbox}


\subsection{The mixfix template}
Let us take a closer look at the string $template$ appearing in mixfix
annotations.  This string specifies a list of parsing and printing
directives: delimiters\index{delimiters}, arguments, spaces, blocks of
indentation and line breaks.  These are encoded by the following character
sequences:
\index{pretty printing|(}
\begin{description}
\item[~$d$~] is a delimiter, namely a non-empty sequence of characters
  other than the special characters {\tt _}, {\tt(}, {\tt)} and~{\tt/}.
  Even these characters may appear if escaped; this means preceding it with
  a~{\tt '} (single quote).  Thus you have to write {\tt ''} if you really
  want a single quote.  Delimiters may never contain spaces.

\item[~{\tt_}~] is an argument position, which stands for a nonterminal symbol
  or name token.

\item[~$s$~] is a non-empty sequence of spaces for printing.  This and the
  following specifications do not affect parsing at all.

\item[~{\tt(}$n$~] opens a pretty printing block.  The optional number $n$
  specifies how much indentation to add when a line break occurs within the
  block.  If {\tt(} is not followed by digits, the indentation defaults
  to~0.

\item[~{\tt)}~] closes a pretty printing block.

\item[~{\tt//}~] forces a line break.

\item[~{\tt/}$s$~] allows a line break.  Here $s$ stands for the string of
  spaces (zero or more) right after the {\tt /} character.  These spaces
  are printed if the break is not taken.
\end{description}
For example, the template {\tt"(_ +/ _)"} specifies an infix operator.
There are two argument positions; the delimiter~{\tt+} is preceded by a
space and followed by a space or line break; the entire phrase is a pretty
printing block.  Other examples appear in Fig.\ts\ref{fig:set_trans} below.
Isabelle's pretty printer resembles the one described in
Paulson~\cite{paulson91}.

\index{pretty printing|)}


\subsection{Infixes}
\indexbold{infixes}

Infix operators associating to the left or right can be declared
using {\tt infixl} or {\tt infixr}.
Roughly speaking, the form {\tt $c$ ::\ "$\sigma$" (infixl $p$)}
abbreviates the constant declarations
\begin{ttbox}
"op \(c\)" :: "\(\sigma\)"   ("op \(c\)")
"op \(c\)" :: "\(\sigma\)"   ("(_ \(c\)/ _)" [\(p\), \(p+1\)] \(p\))
\end{ttbox}
and {\tt $c$ ::\ "$\sigma$" (infixr $p$)} abbreviates the constant declarations
\begin{ttbox}
"op \(c\)" :: "\(\sigma\)"   ("op \(c\)")
"op \(c\)" :: "\(\sigma\)"   ("(_ \(c\)/ _)" [\(p+1\), \(p\)] \(p\))
\end{ttbox}
The infix operator is declared as a constant with the prefix {\tt op}.
Thus, prefixing infixes with \sdx{op} makes them behave like ordinary
function symbols, as in \ML.  Special characters occurring in~$c$ must be
escaped, as in delimiters, using a single quote.

The expanded forms above would be actually illegal in a {\tt .thy} file
because they declare the constant \hbox{\tt"op \(c\)"} twice.


\subsection{Binders}
\indexbold{binders}
\begingroup
\def\Q{{\cal Q}}
A {\bf binder} is a variable-binding construct such as a quantifier.  The
constant declaration
\begin{ttbox}
\(c\) :: "\(\sigma\)"   (binder "\(\Q\)" \(p\))
\end{ttbox}
introduces a constant~$c$ of type~$\sigma$, which must have the form
$(\tau@1 \To \tau@2) \To \tau@3$.  Its concrete syntax is $\Q~x.P$, where
$x$ is a bound variable of type~$\tau@1$, the body~$P$ has type $\tau@2$
and the whole term has type~$\tau@3$.  Special characters in $\Q$ must be
escaped using a single quote.

The declaration is expanded internally to
\begin{ttbox}
\(c\)    :: "(\(\tau@1\) => \(\tau@2\)) => \(\tau@3\)"
"\(\Q\)"\hskip-3pt  :: "[idts, \(\tau@2\)] => \(\tau@3\)"   ("(3\(\Q\)_./ _)" \(p\))
\end{ttbox}
Here \ndx{idts} is the nonterminal symbol for a list of identifiers with
\index{type constraints}
optional type constraints (see Fig.\ts\ref{fig:pure_gram}).  The
declaration also installs a parse translation\index{translations!parse}
for~$\Q$ and a print translation\index{translations!print} for~$c$ to
translate between the internal and external forms.

A binder of type $(\sigma \To \tau) \To \tau$ can be nested by giving a
list of variables.  The external form $\Q~x@1~x@2 \ldots x@n. P$
corresponds to the internal form
\[ c(\lambda x@1. c(\lambda x@2. \ldots c(\lambda x@n. P) \ldots)). \]

\medskip
For example, let us declare the quantifier~$\forall$:\index{quantifiers}
\begin{ttbox}
All :: "('a => o) => o"   (binder "ALL " 10)
\end{ttbox}
This lets us write $\forall x.P$ as either {\tt All(\%$x$.$P$)} or {\tt ALL
  $x$.$P$}.  When printing, Isabelle prefers the latter form, but must fall
back on ${\tt All}(P)$ if $P$ is not an abstraction.  Both $P$ and {\tt ALL
  $x$.$P$} have type~$o$, the type of formulae, while the bound variable
can be polymorphic.
\endgroup

\index{mixfix declarations|)}


\section{Example: some minimal logics} \label{sec:min_logics}
\index{examples!of logic definitions}

This section presents some examples that have a simple syntax.  They
demonstrate how to define new object-logics from scratch.

First we must define how an object-logic syntax embedded into the
meta-logic.  Since all theorems must conform to the syntax for~\ndx{prop} (see
Fig.\ts\ref{fig:pure_gram}), that syntax has to be extended with the
object-level syntax.  Assume that the syntax of your object-logic defines a
nonterminal symbol~\ndx{o} of formulae.  These formulae can now appear in
axioms and theorems wherever \ndx{prop} does if you add the production
\[ prop ~=~ o. \]
This is not a copy production but a coercion from formulae to propositions:
\begin{ttbox}
Base = Pure +
types
  o
arities
  o :: logic
consts
  Trueprop :: "o => prop"   ("_" 5)
end
\end{ttbox}
The constant \cdx{Trueprop} (the name is arbitrary) acts as an invisible
coercion function.  Assuming this definition resides in a file {\tt Base.thy},
you have to load it with the command {\tt use_thy "Base"}.

One of the simplest nontrivial logics is {\bf minimal logic} of
implication.  Its definition in Isabelle needs no advanced features but
illustrates the overall mechanism nicely:
\begin{ttbox}
Hilbert = Base +
consts
  "-->" :: "[o, o] => o"   (infixr 10)
rules
  K     "P --> Q --> P"
  S     "(P --> Q --> R) --> (P --> Q) --> P --> R"
  MP    "[| P --> Q; P |] ==> Q"
end
\end{ttbox}
After loading this definition from the file {\tt Hilbert.thy}, you can
start to prove theorems in the logic:
\begin{ttbox}
goal Hilbert.thy "P --> P";
{\out Level 0}
{\out P --> P}
{\out  1.  P --> P}
\ttbreak
by (resolve_tac [Hilbert.MP] 1);
{\out Level 1}
{\out P --> P}
{\out  1.  ?P --> P --> P}
{\out  2.  ?P}
\ttbreak
by (resolve_tac [Hilbert.MP] 1);
{\out Level 2}
{\out P --> P}
{\out  1.  ?P1 --> ?P --> P --> P}
{\out  2.  ?P1}
{\out  3.  ?P}
\ttbreak
by (resolve_tac [Hilbert.S] 1);
{\out Level 3}
{\out P --> P}
{\out  1.  P --> ?Q2 --> P}
{\out  2.  P --> ?Q2}
\ttbreak
by (resolve_tac [Hilbert.K] 1);
{\out Level 4}
{\out P --> P}
{\out  1.  P --> ?Q2}
\ttbreak
by (resolve_tac [Hilbert.K] 1);
{\out Level 5}
{\out P --> P}
{\out No subgoals!}
\end{ttbox}
As we can see, this Hilbert-style formulation of minimal logic is easy to
define but difficult to use.  The following natural deduction formulation is
better:
\begin{ttbox}
MinI = Base +
consts
  "-->" :: "[o, o] => o"   (infixr 10)
rules
  impI  "(P ==> Q) ==> P --> Q"
  impE  "[| P --> Q; P |] ==> Q"
end
\end{ttbox}
Note, however, that although the two systems are equivalent, this fact
cannot be proved within Isabelle.  Axioms {\tt S} and {\tt K} can be
derived in {\tt MinI} (exercise!), but {\tt impI} cannot be derived in {\tt
  Hilbert}.  The reason is that {\tt impI} is only an {\bf admissible} rule
in {\tt Hilbert}, something that can only be shown by induction over all
possible proofs in {\tt Hilbert}.

We may easily extend minimal logic with falsity:
\begin{ttbox}
MinIF = MinI +
consts
  False :: "o"
rules
  FalseE "False ==> P"
end
\end{ttbox}
On the other hand, we may wish to introduce conjunction only:
\begin{ttbox}
MinC = Base +
consts
  "&" :: "[o, o] => o"   (infixr 30)
\ttbreak
rules
  conjI  "[| P; Q |] ==> P & Q"
  conjE1 "P & Q ==> P"
  conjE2 "P & Q ==> Q"
end
\end{ttbox}
And if we want to have all three connectives together, we create and load a
theory file consisting of a single line:\footnote{We can combine the
  theories without creating a theory file using the ML declaration
\begin{ttbox}
val MinIFC_thy = merge_theories(MinIF,MinC)
\end{ttbox}
\index{*merge_theories|fnote}}
\begin{ttbox}
MinIFC = MinIF + MinC
\end{ttbox}
Now we can prove mixed theorems like
\begin{ttbox}
goal MinIFC.thy "P & False --> Q";
by (resolve_tac [MinI.impI] 1);
by (dresolve_tac [MinC.conjE2] 1);
by (eresolve_tac [MinIF.FalseE] 1);
\end{ttbox}
Try this as an exercise!