doc-src/Ref/syntax.tex

Re-organised to perform the tests independently. Now test
is defined in terms of separate targets IMP, ex, etc. If ISABELLECOMP is set
wrongly then "exit 1" causes the Make to fail. Defines the macro "LOGIC" to
refer to the right command for running the object-logic. Uses "suffix
substitution" to shorten macro definitions.

%% $Id$
\chapter{Syntax Transformations} \label{chap:syntax}
\newcommand\ttapp{\mathrel{\hbox{\tt\$}}}
\newcommand\mtt[1]{\mbox{\tt #1}}
\newcommand\ttfct[1]{\mathop{\mtt{#1}}\nolimits}
\newcommand\Constant{\ttfct{Constant}}
\newcommand\Variable{\ttfct{Variable}}
\newcommand\Appl[1]{\ttfct{Appl}\,[#1]}
\index{syntax!transformations|(}

This chapter is intended for experienced Isabelle users who need to define
macros or code their own translation functions.  It describes the
transformations between parse trees, abstract syntax trees and terms.


\section{Abstract syntax trees} \label{sec:asts}
\index{ASTs|(}

The parser, given a token list from the lexer, applies productions to yield
a parse tree\index{parse trees}.  By applying some internal transformations
the parse tree becomes an abstract syntax tree, or \AST{}.  Macro
expansion, further translations and finally type inference yields a
well-typed term.  The printing process is the reverse, except for some
subtleties to be discussed later.

Figure~\ref{fig:parse_print} outlines the parsing and printing process.
Much of the complexity is due to the macro mechanism.  Using macros, you
can specify most forms of concrete syntax without writing any \ML{} code.

\begin{figure}
\begin{center}
\begin{tabular}{cl}
string          & \\
$\downarrow$    & parser \\
parse tree      & \\
$\downarrow$    & parse \AST{} translation \\
\AST{}             & \\
$\downarrow$    & \AST{} rewriting (macros) \\
\AST{}             & \\
$\downarrow$    & parse translation, type inference \\
--- well-typed term --- & \\
$\downarrow$    & print translation \\
\AST{}             & \\
$\downarrow$    & \AST{} rewriting (macros) \\
\AST{}             & \\
$\downarrow$    & print \AST{} translation, printer \\
string          &
\end{tabular}

\end{center}
\caption{Parsing and printing}\label{fig:parse_print}
\end{figure}

Abstract syntax trees are an intermediate form between the raw parse trees
and the typed $\lambda$-terms.  An \AST{} is either an atom (constant or
variable) or a list of {\em at least two\/} subtrees.  Internally, they
have type \mltydx{Syntax.ast}: \index{*Constant} \index{*Variable}
\index{*Appl}
\begin{ttbox}
datatype ast = Constant of string
             | Variable of string
             | Appl of ast list
\end{ttbox}
%
Isabelle uses an S-expression syntax for abstract syntax trees.  Constant
atoms are shown as quoted strings, variable atoms as non-quoted strings and
applications as a parenthesised list of subtrees.  For example, the \AST
\begin{ttbox}
Appl [Constant "_constrain",
      Appl [Constant "_abs", Variable "x", Variable "t"],
      Appl [Constant "fun", Variable "'a", Variable "'b"]]
\end{ttbox}
is shown as {\tt ("_constrain" ("_abs" x t) ("fun" 'a 'b))}.
Both {\tt ()} and {\tt (f)} are illegal because they have too few
subtrees.

The resemblance to Lisp's S-expressions is intentional, but there are two
kinds of atomic symbols: $\Constant x$ and $\Variable x$.  Do not take the
names {\tt Constant} and {\tt Variable} too literally; in the later
translation to terms, $\Variable x$ may become a constant, free or bound
variable, even a type constructor or class name; the actual outcome depends
on the context.

Similarly, you can think of ${\tt (} f~x@1~\ldots~x@n{\tt )}$ as the
application of~$f$ to the arguments $x@1, \ldots, x@n$.  But the kind of
application is determined later by context; it could be a type constructor
applied to types.

Forms like {\tt (("_abs" x $t$) $u$)} are legal, but \AST{}s are
first-order: the {\tt "_abs"} does not bind the {\tt x} in any way.  Later
at the term level, {\tt ("_abs" x $t$)} will become an {\tt Abs} node and
occurrences of {\tt x} in $t$ will be replaced by bound variables (the term
constructor \ttindex{Bound}).


\section{Transforming parse trees to \AST{}s}\label{sec:astofpt}
\index{ASTs!made from parse trees}
\newcommand\astofpt[1]{\lbrakk#1\rbrakk}

The parse tree is the raw output of the parser.  Translation functions,
called {\bf parse AST translations}\indexbold{translations!parse AST},
transform the parse tree into an abstract syntax tree.

The parse tree is constructed by nesting the right-hand sides of the
productions used to recognize the input.  Such parse trees are simply lists
of tokens and constituent parse trees, the latter representing the
nonterminals of the productions.  Let us refer to the actual productions in
the form displayed by {\tt print_syntax} (see \S\ref{sec:inspct-thy} for an
example).

Ignoring parse \AST{} translations, parse trees are transformed to \AST{}s
by stripping out delimiters and copy productions.  More precisely, the
mapping $\astofpt{-}$ is derived from the productions as follows:
\begin{itemize}
\item Name tokens: $\astofpt{t} = \Variable s$, where $t$ is an \ndx{id},
  \ndx{var}, \ndx{tid}, \ndx{tvar}, \ndx{xnum} or \ndx{xstr} token, and $s$
  its associated string. Note that for {\tt xstr} this does not include the
  quotes.

\item Copy productions:\index{productions!copy}
  $\astofpt{\ldots P \ldots} = \astofpt{P}$.  Here $\ldots$ stands for
  strings of delimiters, which are discarded.  $P$ stands for the single
  constituent that is not a delimiter; it is either a nonterminal symbol or
  a name token.

  \item 0-ary productions: $\astofpt{\ldots \mtt{=>} c} = \Constant c$.
    Here there are no constituents other than delimiters, which are
    discarded.

  \item $n$-ary productions, where $n \ge 1$: delimiters are discarded and
    the remaining constituents $P@1$, \ldots, $P@n$ are built into an
    application whose head constant is~$c$:
    \[ \astofpt{\ldots P@1 \ldots P@n \ldots \mtt{=>} c} =
       \Appl{\Constant c, \astofpt{P@1}, \ldots, \astofpt{P@n}}
    \]
\end{itemize}
Figure~\ref{fig:parse_ast} presents some simple examples, where {\tt ==},
{\tt _appl}, {\tt _args}, and so forth name productions of the Pure syntax.
These examples illustrate the need for further translations to make \AST{}s
closer to the typed $\lambda$-calculus.  The Pure syntax provides
predefined parse \AST{} translations\index{translations!parse AST} for
ordinary applications, type applications, nested abstractions, meta
implications and function types.  Figure~\ref{fig:parse_ast_tr} shows their
effect on some representative input strings.


\begin{figure}
\begin{center}
\tt\begin{tabular}{ll}
\rm input string    & \rm \AST \\\hline
"f"                 & f \\
"'a"                & 'a \\
"t == u"            & ("==" t u) \\
"f(x)"              & ("_appl" f x) \\
"f(x, y)"           & ("_appl" f ("_args" x y)) \\
"f(x, y, z)"        & ("_appl" f ("_args" x ("_args" y z))) \\
"\%x y.\ t"         & ("_lambda" ("_idts" x y) t) \\
\end{tabular}
\end{center}
\caption{Parsing examples using the Pure syntax}\label{fig:parse_ast}
\end{figure}

\begin{figure}
\begin{center}
\tt\begin{tabular}{ll}
\rm input string            & \rm \AST{} \\\hline
"f(x, y, z)"                & (f x y z) \\
"'a ty"                     & (ty 'a) \\
"('a, 'b) ty"               & (ty 'a 'b) \\
"\%x y z.\ t"               & ("_abs" x ("_abs" y ("_abs" z t))) \\
"\%x ::\ 'a.\ t"            & ("_abs" ("_constrain" x 'a) t) \\
"[| P; Q; R |] => S"        & ("==>" P ("==>" Q ("==>" R S))) \\
"['a, 'b, 'c] => 'd"        & ("fun" 'a ("fun" 'b ("fun" 'c 'd)))
\end{tabular}
\end{center}
\caption{Built-in parse \AST{} translations}\label{fig:parse_ast_tr}
\end{figure}

The names of constant heads in the \AST{} control the translation process.
The list of constants invoking parse \AST{} translations appears in the
output of {\tt print_syntax} under {\tt parse_ast_translation}.


\section{Transforming \AST{}s to terms}\label{sec:termofast}
\index{terms!made from ASTs}
\newcommand\termofast[1]{\lbrakk#1\rbrakk}

The \AST{}, after application of macros (see \S\ref{sec:macros}), is
transformed into a term.  This term is probably ill-typed since type
inference has not occurred yet.  The term may contain type constraints
consisting of applications with head {\tt "_constrain"}; the second
argument is a type encoded as a term.  Type inference later introduces
correct types or rejects the input.

Another set of translation functions, namely parse
translations\index{translations!parse}, may affect this process.  If we
ignore parse translations for the time being, then \AST{}s are transformed
to terms by mapping \AST{} constants to constants, \AST{} variables to
schematic or free variables and \AST{} applications to applications.

More precisely, the mapping $\termofast{-}$ is defined by
\begin{itemize}
\item Constants: $\termofast{\Constant x} = \ttfct{Const} (x,
  \mtt{dummyT})$.

\item Schematic variables: $\termofast{\Variable \mtt{"?}xi\mtt"} =
  \ttfct{Var} ((x, i), \mtt{dummyT})$, where $x$ is the base name and $i$
  the index extracted from~$xi$.

\item Free variables: $\termofast{\Variable x} = \ttfct{Free} (x,
  \mtt{dummyT})$.

\item Function applications with $n$ arguments:
    \[ \termofast{\Appl{f, x@1, \ldots, x@n}} =
       \termofast{f} \ttapp
         \termofast{x@1} \ttapp \ldots \ttapp \termofast{x@n}
    \]
\end{itemize}
Here \ttindex{Const}, \ttindex{Var}, \ttindex{Free} and
\verb|$|\index{$@{\tt\$}} are constructors of the datatype \mltydx{term},
while \ttindex{dummyT} stands for some dummy type that is ignored during
type inference.

So far the outcome is still a first-order term.  Abstractions and bound
variables (constructors \ttindex{Abs} and \ttindex{Bound}) are introduced
by parse translations.  Such translations are attached to {\tt "_abs"},
{\tt "!!"} and user-defined binders.


\section{Printing of terms}
\newcommand\astofterm[1]{\lbrakk#1\rbrakk}\index{ASTs!made from terms}

The output phase is essentially the inverse of the input phase.  Terms are
translated via abstract syntax trees into strings.  Finally the strings are
pretty printed.

Print translations (\S\ref{sec:tr_funs}) may affect the transformation of
terms into \AST{}s.  Ignoring those, the transformation maps
term constants, variables and applications to the corresponding constructs
on \AST{}s.  Abstractions are mapped to applications of the special
constant {\tt _abs}.

More precisely, the mapping $\astofterm{-}$ is defined as follows:
\begin{itemize}
  \item $\astofterm{\ttfct{Const} (x, \tau)} = \Constant x$.

  \item $\astofterm{\ttfct{Free} (x, \tau)} = constrain (\Variable x,
    \tau)$.

  \item $\astofterm{\ttfct{Var} ((x, i), \tau)} = constrain (\Variable
    \mtt{"?}xi\mtt", \tau)$, where $\mtt?xi$ is the string representation of
    the {\tt indexname} $(x, i)$.

  \item For the abstraction $\lambda x::\tau.t$, let $x'$ be a variant
    of~$x$ renamed to differ from all names occurring in~$t$, and let $t'$
    be obtained from~$t$ by replacing all bound occurrences of~$x$ by
    the free variable $x'$.  This replaces corresponding occurrences of the
    constructor \ttindex{Bound} by the term $\ttfct{Free} (x',
    \mtt{dummyT})$:
   \[ \astofterm{\ttfct{Abs} (x, \tau, t)} =
      \Appl{\Constant \mtt{"_abs"},
        constrain(\Variable x', \tau), \astofterm{t'}}.
    \]

  \item $\astofterm{\ttfct{Bound} i} = \Variable \mtt{"B.}i\mtt"$.
    The occurrence of constructor \ttindex{Bound} should never happen
    when printing well-typed terms; it indicates a de Bruijn index with no
    matching abstraction.

  \item Where $f$ is not an application,
    \[ \astofterm{f \ttapp x@1 \ttapp \ldots \ttapp x@n} =
       \Appl{\astofterm{f}, \astofterm{x@1}, \ldots,\astofterm{x@n}}
    \]
\end{itemize}
%
Type constraints\index{type constraints} are inserted to allow the printing
of types.  This is governed by the boolean variable \ttindex{show_types}:
\begin{itemize}
  \item $constrain(x, \tau) = x$ \ if $\tau = \mtt{dummyT}$ \index{*dummyT} or
    \ttindex{show_types} is set to {\tt false}.

  \item $constrain(x, \tau) = \Appl{\Constant \mtt{"_constrain"}, x,
         \astofterm{\tau}}$ \ otherwise.

    Here, $\astofterm{\tau}$ is the \AST{} encoding of $\tau$: type
    constructors go to {\tt Constant}s; type identifiers go to {\tt
      Variable}s; type applications go to {\tt Appl}s with the type
    constructor as the first element.  If \ttindex{show_sorts} is set to
    {\tt true}, some type variables are decorated with an \AST{} encoding
    of their sort.
\end{itemize}
%
The \AST{}, after application of macros (see \S\ref{sec:macros}), is
transformed into the final output string.  The built-in {\bf print AST
  translations}\indexbold{translations!print AST} reverse the
parse \AST{} translations of Fig.\ts\ref{fig:parse_ast_tr}.

For the actual printing process, the names attached to productions
of the form $\ldots A^{(p@1)}@1 \ldots A^{(p@n)}@n \ldots \mtt{=>} c$ play
a vital role.  Each \AST{} with constant head $c$, namely $\mtt"c\mtt"$ or
$(\mtt"c\mtt"~ x@1 \ldots x@n)$, is printed according to the production
for~$c$.  Each argument~$x@i$ is converted to a string, and put in
parentheses if its priority~$(p@i)$ requires this.  The resulting strings
and their syntactic sugar (denoted by \dots{} above) are joined to make a
single string.

If an application $(\mtt"c\mtt"~ x@1 \ldots x@m)$ has more arguments than the
corresponding production, it is first split into $((\mtt"c\mtt"~ x@1 \ldots
x@n) ~ x@{n+1} \ldots x@m)$.  Applications with too few arguments or with
non-constant head or without a corresponding production are printed as
$f(x@1, \ldots, x@l)$ or $(\alpha@1, \ldots, \alpha@l) ty$.  An occurrence of
$\Variable x$ is simply printed as~$x$.

Blanks are {\em not\/} inserted automatically.  If blanks are required to
separate tokens, specify them in the mixfix declaration, possibly preceded
by a slash~({\tt/}) to allow a line break.
\index{ASTs|)}



\section{Macros: Syntactic rewriting} \label{sec:macros}
\index{macros|(}\index{rewriting!syntactic|(}

Mixfix declarations alone can handle situations where there is a direct
connection between the concrete syntax and the underlying term.  Sometimes
we require a more elaborate concrete syntax, such as quantifiers and list
notation.  Isabelle's {\bf macros} and {\bf translation functions} can
perform translations such as
\begin{center}\tt
  \begin{tabular}{r@{$\quad\protect\rightleftharpoons\quad$}l}
    ALL x:A.P   & Ball(A, \%x.P)        \\ \relax
    [x, y, z]   & Cons(x, Cons(y, Cons(z, Nil)))
  \end{tabular}
\end{center}
Translation functions (see \S\ref{sec:tr_funs}) must be coded in ML; they
are the most powerful translation mechanism but are difficult to read or
write.  Macros are specified by first-order rewriting systems that operate
on abstract syntax trees.  They are usually easy to read and write, and can
express all but the most obscure translations.

Figure~\ref{fig:set_trans} defines a fragment of first-order logic and set
theory.\footnote{This and the following theories are complete working
  examples, though they specify only syntax, no axioms.  The file {\tt
    ZF/ZF.thy} presents a full set theory definition, including many
  macro rules.}  Theory {\tt SET} defines constants for set comprehension
({\tt Collect}), replacement ({\tt Replace}) and bounded universal
quantification ({\tt Ball}).  Each of these binds some variables.  Without
additional syntax we should have to write $\forall x \in A.  P$ as {\tt
  Ball(A,\%x.P)}, and similarly for the others.

\begin{figure}
\begin{ttbox}
SET = Pure +
types
  i o
arities
  i, o :: logic
consts
  Trueprop      :: "o => prop"              ("_" 5)
  Collect       :: "[i, i => o] => i"
  Replace       :: "[i, [i, i] => o] => i"
  Ball          :: "[i, i => o] => o"
syntax
  "{\at}Collect"    :: "[idt, i, o] => i"       ("(1{\ttlbrace}_:_./ _{\ttrbrace})")
  "{\at}Replace"    :: "[idt, idt, i, o] => i"  ("(1{\ttlbrace}_./ _:_, _{\ttrbrace})")
  "{\at}Ball"       :: "[idt, i, o] => o"       ("(3ALL _:_./ _)" 10)
translations
  "{\ttlbrace}x:A. P{\ttrbrace}"    == "Collect(A, \%x. P)"
  "{\ttlbrace}y. x:A, Q{\ttrbrace}" == "Replace(A, \%x y. Q)"
  "ALL x:A. P"  == "Ball(A, \%x. P)"
end
\end{ttbox}
\caption{Macro example: set theory}\label{fig:set_trans}
\end{figure}

The theory specifies a variable-binding syntax through additional productions
that have mixfix declarations.  Each non-copy production must specify some
constant, which is used for building \AST{}s. \index{constants!syntactic} The
additional constants are decorated with {\tt\at} to stress their purely
syntactic purpose; they may not occur within the final well-typed terms,
being declared as {\tt syntax} rather than {\tt consts}.

The translations cause the replacement of external forms by internal forms
after parsing, and vice versa before printing of terms.  As a specification
of the set theory notation, they should be largely self-explanatory.  The
syntactic constants, {\tt\at Collect}, {\tt\at Replace} and {\tt\at Ball},
appear implicitly in the macro rules via their mixfix forms.

Macros can define variable-binding syntax because they operate on \AST{}s,
which have no inbuilt notion of bound variable.  The macro variables {\tt
  x} and~{\tt y} have type~{\tt idt} and therefore range over identifiers,
in this case bound variables.  The macro variables {\tt P} and~{\tt Q}
range over formulae containing bound variable occurrences.

Other applications of the macro system can be less straightforward, and
there are peculiarities.  The rest of this section will describe in detail
how Isabelle macros are preprocessed and applied.


\subsection{Specifying macros}
Macros are basically rewrite rules on \AST{}s.  But unlike other macro
systems found in programming languages, Isabelle's macros work in both
directions.  Therefore a syntax contains two lists of rewrites: one for
parsing and one for printing.

\index{*translations section}
The {\tt translations} section specifies macros.  The syntax for a macro is
\[ (root)\; string \quad
   \left\{\begin{array}[c]{c} \mtt{=>} \\ \mtt{<=} \\ \mtt{==} \end{array}
   \right\} \quad
   (root)\; string
\]
%
This specifies a parse rule ({\tt =>}), a print rule ({\tt <=}), or both
({\tt ==}).  The two strings specify the left and right-hand sides of the
macro rule.  The $(root)$ specification is optional; it specifies the
nonterminal for parsing the $string$ and if omitted defaults to {\tt
  logic}.  \AST{} rewrite rules $(l, r)$ must obey certain conditions:
\begin{itemize}
\item Rules must be left linear: $l$ must not contain repeated variables.

\item Rules must have constant heads, namely $l = \mtt"c\mtt"$ or $l =
  (\mtt"c\mtt" ~ x@1 \ldots x@n)$.

\item Every variable in~$r$ must also occur in~$l$.
\end{itemize}

Macro rules may refer to any syntax from the parent theories.  They may
also refer to anything defined before the {\tt .thy} file's {\tt
  translations} section --- including any mixfix declarations.

Upon declaration, both sides of the macro rule undergo parsing and parse
\AST{} translations (see \S\ref{sec:asts}), but do not themselves undergo
macro expansion.  The lexer runs in a different mode that additionally
accepts identifiers of the form $\_~letter~quasiletter^*$ (like {\tt _idt},
{\tt _K}).  Thus, a constant whose name starts with an underscore can
appear in macro rules but not in ordinary terms.

Some atoms of the macro rule's \AST{} are designated as constants for
matching.  These are all names that have been declared as classes, types or
constants (logical and syntactic).

The result of this preprocessing is two lists of macro rules, each stored
as a pair of \AST{}s.  They can be viewed using {\tt print_syntax}
(sections \ttindex{parse_rules} and \ttindex{print_rules}).  For
theory~{\tt SET} of Fig.~\ref{fig:set_trans} these are
\begin{ttbox}
parse_rules:
  ("{\at}Collect" x A P)  ->  ("Collect" A ("_abs" x P))
  ("{\at}Replace" y x A Q)  ->  ("Replace" A ("_abs" x ("_abs" y Q)))
  ("{\at}Ball" x A P)  ->  ("Ball" A ("_abs" x P))
print_rules:
  ("Collect" A ("_abs" x P))  ->  ("{\at}Collect" x A P)
  ("Replace" A ("_abs" x ("_abs" y Q)))  ->  ("{\at}Replace" y x A Q)
  ("Ball" A ("_abs" x P))  ->  ("{\at}Ball" x A P)
\end{ttbox}

\begin{warn}
  Avoid choosing variable names that have previously been used as
  constants, types or type classes; the {\tt consts} section in the output
  of {\tt print_syntax} lists all such names.  If a macro rule works
  incorrectly, inspect its internal form as shown above, recalling that
  constants appear as quoted strings and variables without quotes.
\end{warn}

\begin{warn}
If \ttindex{eta_contract} is set to {\tt true}, terms will be
$\eta$-contracted {\em before\/} the \AST{} rewriter sees them.  Thus some
abstraction nodes needed for print rules to match may vanish.  For example,
\verb|Ball(A, %x. P(x))| contracts to {\tt Ball(A, P)}; the print rule does
not apply and the output will be {\tt Ball(A, P)}.  This problem would not
occur if \ML{} translation functions were used instead of macros (as is
done for binder declarations).
\end{warn}


\begin{warn}
Another trap concerns type constraints.  If \ttindex{show_types} is set to
{\tt true}, bound variables will be decorated by their meta types at the
binding place (but not at occurrences in the body).  Matching with
\verb|Collect(A, %x. P)| binds {\tt x} to something like {\tt ("_constrain" y
"i")} rather than only {\tt y}.  \AST{} rewriting will cause the constraint to
appear in the external form, say \verb|{y::i:A::i. P::o}|.

To allow such constraints to be re-read, your syntax should specify bound
variables using the nonterminal~\ndx{idt}.  This is the case in our
example.  Choosing {\tt id} instead of {\tt idt} is a common error,
especially since it appears in former versions of most of Isabelle's
object-logics.
\end{warn}



\subsection{Applying rules}
As a term is being parsed or printed, an \AST{} is generated as an
intermediate form (recall Fig.\ts\ref{fig:parse_print}).  The \AST{} is
normalised by applying macro rules in the manner of a traditional term
rewriting system.  We first examine how a single rule is applied.

Let $t$ be the abstract syntax tree to be normalised and $(l, r)$ some
translation rule.  A subtree~$u$ of $t$ is a {\bf redex} if it is an
instance of~$l$; in this case $l$ is said to {\bf match}~$u$.  A redex
matched by $l$ may be replaced by the corresponding instance of~$r$, thus
{\bf rewriting} the \AST~$t$.  Matching requires some notion of {\bf
  place-holders} that may occur in rule patterns but not in ordinary
\AST{}s; {\tt Variable} atoms serve this purpose.

The matching of the object~$u$ by the pattern~$l$ is performed as follows:
\begin{itemize}
  \item Every constant matches itself.

  \item $\Variable x$ in the object matches $\Constant x$ in the pattern.
    This point is discussed further below.

  \item Every \AST{} in the object matches $\Variable x$ in the pattern,
    binding~$x$ to~$u$.

  \item One application matches another if they have the same number of
    subtrees and corresponding subtrees match.

  \item In every other case, matching fails.  In particular, {\tt
      Constant}~$x$ can only match itself.
\end{itemize}
A successful match yields a substitution that is applied to~$r$, generating
the instance that replaces~$u$.

The second case above may look odd.  This is where {\tt Variable}s of
non-rule \AST{}s behave like {\tt Constant}s.  Recall that \AST{}s are not
far removed from parse trees; at this level it is not yet known which
identifiers will become constants, bounds, frees, types or classes.  As
\S\ref{sec:asts} describes, former parse tree heads appear in \AST{}s as
{\tt Constant}s, while the name tokens \ndx{id}, \ndx{var}, \ndx{tid},
\ndx{tvar}, \ndx{xnum} and \ndx{xstr} become {\tt Variable}s.  On the other
hand, when \AST{}s generated from terms for printing, all constants and type
constructors become {\tt Constant}s; see \S\ref{sec:asts}.  Thus \AST{}s may
contain a messy mixture of {\tt Variable}s and {\tt Constant}s.  This is
insignificant at macro level because matching treats them alike.

Because of this behaviour, different kinds of atoms with the same name are
indistinguishable, which may make some rules prone to misbehaviour.  Example:
\begin{ttbox}
types
  Nil
consts
  Nil     :: "'a list"
syntax
  "[]"    :: "'a list"    ("[]")
translations
  "[]"    == "Nil"
\end{ttbox}
The term {\tt Nil} will be printed as {\tt []}, just as expected.
The term \verb|%Nil.t| will be printed as \verb|%[].t|, which might not be
expected!  Guess how type~{\tt Nil} is printed?

Normalizing an \AST{} involves repeatedly applying macro rules until none
are applicable.  Macro rules are chosen in the order that they appear in the
{\tt translations} section.  You can watch the normalization of \AST{}s
during parsing and printing by setting \ttindex{Syntax.trace_norm_ast} to
{\tt true}.\index{tracing!of macros} Alternatively, use
\ttindex{Syntax.test_read}.  The information displayed when tracing
includes the \AST{} before normalization ({\tt pre}), redexes with results
({\tt rewrote}), the normal form finally reached ({\tt post}) and some
statistics ({\tt normalize}).  If tracing is off,
\ttindex{Syntax.stat_norm_ast} can be set to {\tt true} in order to enable
printing of the normal form and statistics only.


\subsection{Example: the syntax of finite sets}
\index{examples!of macros}

This example demonstrates the use of recursive macros to implement a
convenient notation for finite sets.
\index{*empty constant}\index{*insert constant}\index{{}@\verb'{}' symbol}
\index{"@Enum@{\tt\at Enum} constant}
\index{"@Finset@{\tt\at Finset} constant}
\begin{ttbox}
FINSET = SET +
types
  is
syntax
  ""            :: "i => is"                ("_")
  "{\at}Enum"       :: "[i, is] => is"          ("_,/ _")
consts
  empty         :: "i"                      ("{\ttlbrace}{\ttrbrace}")
  insert        :: "[i, i] => i"
syntax
  "{\at}Finset"     :: "is => i"                ("{\ttlbrace}(_){\ttrbrace}")
translations
  "{\ttlbrace}x, xs{\ttrbrace}"     == "insert(x, {\ttlbrace}xs{\ttrbrace})"
  "{\ttlbrace}x{\ttrbrace}"         == "insert(x, {\ttlbrace}{\ttrbrace})"
end
\end{ttbox}
Finite sets are internally built up by {\tt empty} and {\tt insert}.  The
declarations above specify \verb|{x, y, z}| as the external representation
of
\begin{ttbox}
insert(x, insert(y, insert(z, empty)))
\end{ttbox}
The nonterminal symbol~\ndx{is} stands for one or more objects of type~{\tt
  i} separated by commas.  The mixfix declaration \hbox{\verb|"_,/ _"|}
allows a line break after the comma for \rmindex{pretty printing}; if no
line break is required then a space is printed instead.

The nonterminal is declared as the type~{\tt is}, but with no {\tt arities}
declaration.  Hence {\tt is} is not a logical type and may be used safely as
a new nonterminal for custom syntax.  The nonterminal~{\tt is} can later be
re-used for other enumerations of type~{\tt i} like lists or tuples. If we
had needed polymorphic enumerations, we could have used the predefined
nonterminal symbol \ndx{args} and skipped this part altogether.

\index{"@Finset@{\tt\at Finset} constant}
Next follows {\tt empty}, which is already equipped with its syntax
\verb|{}|, and {\tt insert} without concrete syntax.  The syntactic
constant {\tt\at Finset} provides concrete syntax for enumerations of~{\tt
  i} enclosed in curly braces.  Remember that a pair of parentheses, as in
\verb|"{(_)}"|, specifies a block of indentation for pretty printing.

The translations may look strange at first.  Macro rules are best
understood in their internal forms:
\begin{ttbox}
parse_rules:
  ("{\at}Finset" ("{\at}Enum" x xs))  ->  ("insert" x ("{\at}Finset" xs))
  ("{\at}Finset" x)  ->  ("insert" x "empty")
print_rules:
  ("insert" x ("{\at}Finset" xs))  ->  ("{\at}Finset" ("{\at}Enum" x xs))
  ("insert" x "empty")  ->  ("{\at}Finset" x)
\end{ttbox}
This shows that \verb|{x,xs}| indeed matches any set enumeration of at least
two elements, binding the first to {\tt x} and the rest to {\tt xs}.
Likewise, \verb|{xs}| and \verb|{x}| represent any set enumeration.
The parse rules only work in the order given.

\begin{warn}
  The \AST{} rewriter cannot distinguish constants from variables and looks
  only for names of atoms.  Thus the names of {\tt Constant}s occurring in
  the (internal) left-hand side of translation rules should be regarded as
  \rmindex{reserved words}.  Choose non-identifiers like {\tt\at Finset} or
  sufficiently long and strange names.  If a bound variable's name gets
  rewritten, the result will be incorrect; for example, the term
\begin{ttbox}
\%empty insert. insert(x, empty)
\end{ttbox}
\par\noindent is incorrectly printed as \verb|%empty insert. {x}|.
\end{warn}


\subsection{Example: a parse macro for dependent types}\label{prod_trans}
\index{examples!of macros}

As stated earlier, a macro rule may not introduce new {\tt Variable}s on
the right-hand side.  Something like \verb|"K(B)" => "%x.B"| is illegal;
if allowed, it could cause variable capture.  In such cases you usually
must fall back on translation functions.  But a trick can make things
readable in some cases: {\em calling\/} translation functions by parse
macros:
\begin{ttbox}
PROD = FINSET +
consts
  Pi            :: "[i, i => i] => i"
syntax
  "{\at}PROD"       :: "[idt, i, i] => i"     ("(3PROD _:_./ _)" 10)
  "{\at}->"         :: "[i, i] => i"          ("(_ ->/ _)" [51, 50] 50)
\ttbreak
translations
  "PROD x:A. B" => "Pi(A, \%x. B)"
  "A -> B"      => "Pi(A, _K(B))"
end
ML
  val print_translation = [("Pi", dependent_tr' ("{\at}PROD", "{\at}->"))];
\end{ttbox}

Here {\tt Pi} is a logical constant for constructing general products.
Two external forms exist: the general case {\tt PROD x:A.B} and the
function space {\tt A -> B}, which abbreviates \verb|Pi(A, %x.B)| when {\tt B}
does not depend on~{\tt x}.

The second parse macro introduces {\tt _K(B)}, which later becomes
\verb|%x.B| due to a parse translation associated with \cdx{_K}.
Unfortunately there is no such trick for printing, so we have to add a {\tt
ML} section for the print translation \ttindex{dependent_tr'}.

Recall that identifiers with a leading {\tt _} are allowed in translation
rules, but not in ordinary terms.  Thus we can create \AST{}s containing
names that are not directly expressible.

The parse translation for {\tt _K} is already installed in Pure, and {\tt
dependent_tr'} is exported by the syntax module for public use.  See
\S\ref{sec:tr_funs} below for more of the arcane lore of translation functions.
\index{macros|)}\index{rewriting!syntactic|)}


\section{Translation functions} \label{sec:tr_funs}
\index{translations|(}
%
This section describes the translation function mechanism.  By writing
\ML{} functions, you can do almost everything with terms or \AST{}s during
parsing and printing.  The logic \LK\ is a good example of sophisticated
transformations between internal and external representations of sequents;
here, macros would be useless.

A full understanding of translations requires some familiarity
with Isabelle's internals, especially the datatypes {\tt term}, {\tt typ},
{\tt Syntax.ast} and the encodings of types and terms as such at the various
stages of the parsing or printing process.  Most users should never need to
use translation functions.

\subsection{Declaring translation functions}
There are four kinds of translation functions.  Each such function is
associated with a name, which triggers calls to it.  Such names can be
constants (logical or syntactic) or type constructors.

{\tt print_syntax} displays the sets of names associated with the
translation functions of a {\tt Syntax.syntax} under
\ttindex{parse_ast_translation}, \ttindex{parse_translation},
\ttindex{print_translation} and \ttindex{print_ast_translation}.  You can
add new ones via the {\tt ML} section\index{*ML section} of
a {\tt .thy} file.  There may never be more than one function of the same
kind per name.  Even though the {\tt ML} section is the very last part of a
{\tt .thy} file, newly installed translation functions are effective when
processing the preceding section.

The {\tt ML} section is copied verbatim near the beginning of the \ML\ file
generated from a {\tt .thy} file.  Definitions made here are accessible as
components of an \ML\ structure; to make some definitions private, use an
\ML{} {\tt local} declaration.  The {\tt ML} section may install translation
functions by declaring any of the following identifiers:
\begin{ttbox}
val parse_ast_translation : (string * (ast list -> ast)) list
val print_ast_translation : (string * (ast list -> ast)) list
val parse_translation     : (string * (term list -> term)) list
val print_translation     : (string * (term list -> term)) list
\end{ttbox}

\subsection{The translation strategy}
All four kinds of translation functions are treated similarly.  They are
called during the transformations between parse trees, \AST{}s and terms
(recall Fig.\ts\ref{fig:parse_print}).  Whenever a combination of the form
$(\mtt"c\mtt"~x@1 \ldots x@n)$ is encountered, and a translation function
$f$ of appropriate kind exists for $c$, the result is computed by the \ML{}
function call $f \mtt[ x@1, \ldots, x@n \mtt]$.

For \AST{} translations, the arguments $x@1, \ldots, x@n$ are \AST{}s.  A
combination has the form $\Constant c$ or $\Appl{\Constant c, x@1, \ldots,
  x@n}$.  For term translations, the arguments are terms and a combination
has the form $\ttfct{Const} (c, \tau)$ or $\ttfct{Const} (c, \tau) \ttapp
x@1 \ttapp \ldots \ttapp x@n$.  Terms allow more sophisticated
transformations than \AST{}s do, typically involving abstractions and bound
variables.

Regardless of whether they act on terms or \AST{}s, parse translations differ
from print translations in their overall behaviour fundamentally:
\begin{description}
\item[Parse translations] are applied bottom-up.  The arguments are already
  in translated form.  The translations must not fail; exceptions trigger
  an error message.

\item[Print translations] are applied top-down.  They are supplied with
  arguments that are partly still in internal form.  The result again
  undergoes translation; therefore a print translation should not introduce
  as head the very constant that invoked it.  The function may raise
  exception \xdx{Match} to indicate failure; in this event it has no
  effect.
\end{description}

Only constant atoms --- constructor \ttindex{Constant} for \AST{}s and
\ttindex{Const} for terms --- can invoke translation functions.  This
causes another difference between parsing and printing.

Parsing starts with a string and the constants are not yet identified.
Only parse tree heads create {\tt Constant}s in the resulting \AST, as
described in \S\ref{sec:astofpt}.  Macros and parse \AST{} translations may
introduce further {\tt Constant}s.  When the final \AST{} is converted to a
term, all {\tt Constant}s become {\tt Const}s, as described in
\S\ref{sec:termofast}.

Printing starts with a well-typed term and all the constants are known.  So
all logical constants and type constructors may invoke print translations.
These, and macros, may introduce further constants.


\subsection{Example: a print translation for dependent types}
\index{examples!of translations}\indexbold{*dependent_tr'}

Let us continue the dependent type example (page~\pageref{prod_trans}) by
examining the parse translation for~\cdx{_K} and the print translation
{\tt dependent_tr'}, which are both built-in.  By convention, parse
translations have names ending with {\tt _tr} and print translations have
names ending with {\tt _tr'}.  Search for such names in the Isabelle
sources to locate more examples.

Here is the parse translation for {\tt _K}:
\begin{ttbox}
fun k_tr [t] = Abs ("x", dummyT, incr_boundvars 1 t)
  | k_tr ts = raise TERM ("k_tr", ts);
\end{ttbox}
If {\tt k_tr} is called with exactly one argument~$t$, it creates a new
{\tt Abs} node with a body derived from $t$.  Since terms given to parse
translations are not yet typed, the type of the bound variable in the new
{\tt Abs} is simply {\tt dummyT}.  The function increments all {\tt Bound}
nodes referring to outer abstractions by calling \ttindex{incr_boundvars},
a basic term manipulation function defined in {\tt Pure/term.ML}.

Here is the print translation for dependent types:
\begin{ttbox}
fun dependent_tr' (q, r) (A :: Abs (x, T, B) :: ts) =
      if 0 mem (loose_bnos B) then
        let val (x', B') = variant_abs (x, dummyT, B);
        in list_comb (Const (q, dummyT) $ Free (x', T) $ A $ B', ts)
        end
      else list_comb (Const (r, dummyT) $ A $ B, ts)
  | dependent_tr' _ _ = raise Match;
\end{ttbox}
The argument {\tt (q,r)} is supplied to the curried function {\tt
  dependent_tr'} by a partial application during its installation.  We
can set up print translations for both {\tt Pi} and {\tt Sigma} by
including
\begin{ttbox}\index{*ML section}
val print_translation =
  [("Pi",    dependent_tr' ("{\at}PROD", "{\at}->")),
   ("Sigma", dependent_tr' ("{\at}SUM", "{\at}*"))];
\end{ttbox}
within the {\tt ML} section.  The first of these transforms ${\tt Pi}(A,
\mtt{Abs}(x, T, B))$ into $\hbox{\tt{\at}PROD}(x', A, B')$ or
$\hbox{\tt{\at}->}(A, B)$, choosing the latter form if $B$ does not depend
on~$x$.  It checks this using \ttindex{loose_bnos}, yet another function
from {\tt Pure/term.ML}.  Note that $x'$ is a version of $x$ renamed away
from all names in $B$, and $B'$ is the body $B$ with {\tt Bound} nodes
referring to the {\tt Abs} node replaced by $\ttfct{Free} (x',
\mtt{dummyT})$.

We must be careful with types here.  While types of {\tt Const}s are
ignored, type constraints may be printed for some {\tt Free}s and
{\tt Var}s if \ttindex{show_types} is set to {\tt true}.  Variables of type
\ttindex{dummyT} are never printed with constraint, though.  The line
\begin{ttbox}
        let val (x', B') = variant_abs (x, dummyT, B);
\end{ttbox}\index{*variant_abs}
replaces bound variable occurrences in~$B$ by the free variable $x'$ with
type {\tt dummyT}.  Only the binding occurrence of~$x'$ is given the
correct type~{\tt T}, so this is the only place where a type
constraint might appear.
\index{translations|)}
\index{syntax!transformations|)}