path: root/doc/ref/compiler.texi

@c -*-texinfo-*-
@c This is part of the GNU Guile Reference Manual.
@c Copyright (C)  2008, 2009, 2010, 2011, 2012, 2013, 2014, 2015
@c   Free Software Foundation, Inc.
@c See the file guile.texi for copying conditions.

@node Compiling to the Virtual Machine
@section Compiling to the Virtual Machine

Compilers!  The word itself inspires excitement and awe, even among
experienced practitioners.  But a compiler is just a program: an
eminently hackable thing.  This section aims to to describe Guile's
compiler in such a way that interested Scheme hackers can feel
comfortable reading and extending it.

@xref{Read/Load/Eval/Compile}, if you're lost and you just wanted to
know how to compile your @code{.scm} file.

@menu
* Compiler Tower::                   
* The Scheme Compiler::                   
* Tree-IL::                 
* Continuation-Passing Style::                 
* Bytecode::                
* Writing New High-Level Languages::
* Extending the Compiler::
@end menu

@node Compiler Tower
@subsection Compiler Tower

Guile's compiler is quite simple -- its @emph{compilers}, to put it more
accurately.  Guile defines a tower of languages, starting at Scheme and
progressively simplifying down to languages that resemble the VM
instruction set (@pxref{Instruction Set}).

Each language knows how to compile to the next, so each step is simple
and understandable.  Furthermore, this set of languages is not hardcoded
into Guile, so it is possible for the user to add new high-level
languages, new passes, or even different compilation targets.

Languages are registered in the module, @code{(system base language)}:

@example
(use-modules (system base language))
@end example

They are registered with the @code{define-language} form.

@deffn {Scheme Syntax} define-language @
                       [#:name] [#:title] [#:reader] [#:printer] @
                       [#:parser=#f] [#:compilers='()] @
                       [#:decompilers='()] [#:evaluator=#f] @
                       [#:joiner=#f] [#:for-humans?=#t] @
                       [#:make-default-environment=make-fresh-user-module]
Define a language.

This syntax defines a @code{<language>} object, bound to @var{name} in
the current environment.  In addition, the language will be added to the
global language set.  For example, this is the language definition for
Scheme:

@example
(define-language scheme
  #:title	"Scheme"
  #:reader      (lambda (port env) ...)
  #:compilers   `((tree-il . ,compile-tree-il))
  #:decompilers `((tree-il . ,decompile-tree-il))
  #:evaluator	(lambda (x module) (primitive-eval x))
  #:printer	write
  #:make-default-environment (lambda () ...))
@end example
@end deffn

The interesting thing about having languages defined this way is that
they present a uniform interface to the read-eval-print loop.  This
allows the user to change the current language of the REPL:

@example
scheme@@(guile-user)> ,language tree-il
Happy hacking with Tree Intermediate Language!  To switch back, type `,L scheme'.
tree-il@@(guile-user)> ,L scheme
Happy hacking with Scheme!  To switch back, type `,L tree-il'.
scheme@@(guile-user)> 
@end example

Languages can be looked up by name, as they were above.

@deffn {Scheme Procedure} lookup-language name
Looks up a language named @var{name}, autoloading it if necessary.

Languages are autoloaded by looking for a variable named @var{name} in
a module named @code{(language @var{name} spec)}.

The language object will be returned, or @code{#f} if there does not
exist a language with that name.
@end deffn

Defining languages this way allows us to programmatically determine
the necessary steps for compiling code from one language to another.

@deffn {Scheme Procedure} lookup-compilation-order from to
Recursively traverses the set of languages to which @var{from} can
compile, depth-first, and return the first path that can transform
@var{from} to @var{to}. Returns @code{#f} if no path is found.

This function memoizes its results in a cache that is invalidated by
subsequent calls to @code{define-language}, so it should be quite
fast.
@end deffn

There is a notion of a ``current language'', which is maintained in the
@code{current-language} parameter, defined in the core @code{(guile)}
module.  This language is normally Scheme, and may be rebound by the
user.  The run-time compilation interfaces
(@pxref{Read/Load/Eval/Compile}) also allow you to choose other source
and target languages.

The normal tower of languages when compiling Scheme goes like this:

@itemize
@item Scheme
@item Tree Intermediate Language (Tree-IL)
@item Continuation-Passing Style (CPS)
@item Bytecode
@end itemize

As discussed before (@pxref{Object File Format}), bytecode is in ELF
format, ready to be serialized to disk.  But when compiling Scheme at
run time, you want a Scheme value: for example, a compiled procedure.
For this reason, so as not to break the abstraction, Guile defines a
fake language at the bottom of the tower:

@itemize
@item Value
@end itemize

Compiling to @code{value} loads the bytecode into a procedure, turning
cold bytes into warm code.

Perhaps this strangeness can be explained by example:
@code{compile-file} defaults to compiling to bytecode, because it
produces object code that has to live in the barren world outside the
Guile runtime; but @code{compile} defaults to compiling to @code{value},
as its product re-enters the Guile world.

@c FIXME: This doesn't work anymore :(  Should we add some kind of
@c special GC pass, or disclaim this kind of code, or what?

Indeed, the process of compilation can circulate through these
different worlds indefinitely, as shown by the following quine:

@example
((lambda (x) ((compile x) x)) '(lambda (x) ((compile x) x)))
@end example

@node The Scheme Compiler
@subsection The Scheme Compiler

The job of the Scheme compiler is to expand all macros and all of Scheme
to its most primitive expressions.  The definition of ``primitive
expression'' is given by the inventory of constructs provided by
Tree-IL, the target language of the Scheme compiler: procedure calls,
conditionals, lexical references, and so on.  This is described more
fully in the next section.

The tricky and amusing thing about the Scheme-to-Tree-IL compiler is
that it is completely implemented by the macro expander.  Since the
macro expander has to run over all of the source code already in order
to expand macros, it might as well do the analysis at the same time,
producing Tree-IL expressions directly.

Because this compiler is actually the macro expander, it is extensible.
Any macro which the user writes becomes part of the compiler.

The Scheme-to-Tree-IL expander may be invoked using the generic
@code{compile} procedure:

@lisp
(compile '(+ 1 2) #:from 'scheme #:to 'tree-il)
@result{}
#<tree-il (call (toplevel +) (const 1) (const 2))>
@end lisp

@code{(compile @var{foo} #:from 'scheme #:to 'tree-il)} is entirely
equivalent to calling the macro expander as @code{(macroexpand @var{foo}
'c '(compile load eval))}.  @xref{Macro Expansion}.
@code{compile-tree-il}, the procedure dispatched by @code{compile} to
@code{'tree-il}, is a small wrapper around @code{macroexpand}, to make
it conform to the general form of compiler procedures in Guile's
language tower.

Compiler procedures take three arguments: an expression, an
environment, and a keyword list of options. They return three values:
the compiled expression, the corresponding environment for the target
language, and a ``continuation environment''. The compiled expression
and environment will serve as input to the next language's compiler.
The ``continuation environment'' can be used to compile another
expression from the same source language within the same module.

For example, you might compile the expression, @code{(define-module
(foo))}. This will result in a Tree-IL expression and environment. But
if you compiled a second expression, you would want to take into
account the compile-time effect of compiling the previous expression,
which puts the user in the @code{(foo)} module. That is purpose of the
``continuation environment''; you would pass it as the environment
when compiling the subsequent expression.

For Scheme, an environment is a module. By default, the @code{compile}
and @code{compile-file} procedures compile in a fresh module, such
that bindings and macros introduced by the expression being compiled
are isolated:

@example
(eq? (current-module) (compile '(current-module)))
@result{} #f

(compile '(define hello 'world))
(defined? 'hello)
@result{} #f

(define / *)
(eq? (compile '/) /)
@result{} #f
@end example

Similarly, changes to the @code{current-reader} fluid (@pxref{Loading,
@code{current-reader}}) are isolated:

@example
(compile '(fluid-set! current-reader (lambda args 'fail)))
(fluid-ref current-reader)
@result{} #f
@end example

Nevertheless, having the compiler and @dfn{compilee} share the same name
space can be achieved by explicitly passing @code{(current-module)} as
the compilation environment:

@example
(define hello 'world)
(compile 'hello #:env (current-module))
@result{} world
@end example

@node Tree-IL
@subsection Tree-IL

Tree Intermediate Language (Tree-IL) is a structured intermediate
language that is close in expressive power to Scheme. It is an
expanded, pre-analyzed Scheme.

Tree-IL is ``structured'' in the sense that its representation is
based on records, not S-expressions. This gives a rigidity to the
language that ensures that compiling to a lower-level language only
requires a limited set of transformations. For example, the Tree-IL
type @code{<const>} is a record type with two fields, @code{src} and
@code{exp}. Instances of this type are created via @code{make-const}.
Fields of this type are accessed via the @code{const-src} and
@code{const-exp} procedures. There is also a predicate, @code{const?}.
@xref{Records}, for more information on records.

@c alpha renaming

All Tree-IL types have a @code{src} slot, which holds source location
information for the expression. This information, if present, will be
residualized into the compiled object code, allowing backtraces to
show source information. The format of @code{src} is the same as that
returned by Guile's @code{source-properties} function. @xref{Source
Properties}, for more information.

Although Tree-IL objects are represented internally using records,
there is also an equivalent S-expression external representation for
each kind of Tree-IL. For example, the S-expression representation
of @code{#<const src: #f exp: 3>} expression would be:

@example
(const 3)
@end example

Users may program with this format directly at the REPL:

@example
scheme@@(guile-user)> ,language tree-il
Happy hacking with Tree Intermediate Language!  To switch back, type `,L scheme'.
tree-il@@(guile-user)> (call (primitive +) (const 32) (const 10))
@result{} 42
@end example

The @code{src} fields are left out of the external representation.

One may create Tree-IL objects from their external representations via
calling @code{parse-tree-il}, the reader for Tree-IL. If any source
information is attached to the input S-expression, it will be
propagated to the resulting Tree-IL expressions. This is probably the
easiest way to compile to Tree-IL: just make the appropriate external
representations in S-expression format, and let @code{parse-tree-il}
take care of the rest.

@deftp {Scheme Variable} <void> src
@deftpx {External Representation} (void)
An empty expression.  In practice, equivalent to Scheme's @code{(if #f
#f)}.
@end deftp

@deftp {Scheme Variable} <const> src exp
@deftpx {External Representation} (const @var{exp})
A constant.
@end deftp

@deftp {Scheme Variable} <primitive-ref> src name
@deftpx {External Representation} (primitive @var{name})
A reference to a ``primitive''.  A primitive is a procedure that, when
compiled, may be open-coded.  For example, @code{cons} is usually
recognized as a primitive, so that it compiles down to a single
instruction.

Compilation of Tree-IL usually begins with a pass that resolves some
@code{<module-ref>} and @code{<toplevel-ref>} expressions to
@code{<primitive-ref>} expressions.  The actual compilation pass has
special cases for calls to certain primitives, like @code{apply} or
@code{cons}.
@end deftp

@deftp {Scheme Variable} <lexical-ref> src name gensym
@deftpx {External Representation} (lexical @var{name} @var{gensym})
A reference to a lexically-bound variable.  The @var{name} is the
original name of the variable in the source program. @var{gensym} is a
unique identifier for this variable.
@end deftp

@deftp {Scheme Variable} <lexical-set> src name gensym exp
@deftpx {External Representation} (set! (lexical @var{name} @var{gensym}) @var{exp})
Sets a lexically-bound variable.
@end deftp

@deftp {Scheme Variable} <module-ref> src mod name public?
@deftpx {External Representation} (@@ @var{mod} @var{name})
@deftpx {External Representation} (@@@@ @var{mod} @var{name})
A reference to a variable in a specific module. @var{mod} should be
the name of the module, e.g.@: @code{(guile-user)}.

If @var{public?} is true, the variable named @var{name} will be looked
up in @var{mod}'s public interface, and serialized with @code{@@};
otherwise it will be looked up among the module's private bindings,
and is serialized with @code{@@@@}.
@end deftp

@deftp {Scheme Variable} <module-set> src mod name public? exp
@deftpx {External Representation} (set! (@@ @var{mod} @var{name}) @var{exp})
@deftpx {External Representation} (set! (@@@@ @var{mod} @var{name}) @var{exp})
Sets a variable in a specific module.
@end deftp

@deftp {Scheme Variable} <toplevel-ref> src name
@deftpx {External Representation} (toplevel @var{name})
References a variable from the current procedure's module.
@end deftp

@deftp {Scheme Variable} <toplevel-set> src name exp
@deftpx {External Representation} (set! (toplevel @var{name}) @var{exp})
Sets a variable in the current procedure's module.
@end deftp

@deftp {Scheme Variable} <toplevel-define> src name exp
@deftpx {External Representation} (define (toplevel @var{name}) @var{exp})
Defines a new top-level variable in the current procedure's module.
@end deftp

@deftp {Scheme Variable} <conditional> src test then else
@deftpx {External Representation} (if @var{test} @var{then} @var{else})
A conditional. Note that @var{else} is not optional.
@end deftp

@deftp {Scheme Variable} <call> src proc args
@deftpx {External Representation} (call @var{proc} . @var{args})
A procedure call.
@end deftp

@deftp {Scheme Variable} <primcall> src name args
@deftpx {External Representation} (primcall @var{name} . @var{args})
A call to a primitive.  Equivalent to @code{(call (primitive @var{name})
. @var{args})}.  This construct is often more convenient to generate and
analyze than @code{<call>}.

As part of the compilation process, instances of @code{(call (primitive
@var{name}) . @var{args})} are transformed into primcalls.
@end deftp

@deftp {Scheme Variable} <seq> src head tail
@deftpx {External Representation} (seq @var{head} @var{tail})
A sequence.  The semantics is that @var{head} is evaluated first, and
any resulting values are ignored.  Then @var{tail} is evaluated, in tail
position.
@end deftp

@deftp {Scheme Variable} <lambda> src meta body
@deftpx {External Representation} (lambda @var{meta} @var{body})
A closure.  @var{meta} is an association list of properties for the
procedure.  @var{body} is a single Tree-IL expression of type
@code{<lambda-case>}.  As the @code{<lambda-case>} clause can chain to
an alternate clause, this makes Tree-IL's @code{<lambda>} have the
expressiveness of Scheme's @code{case-lambda}.
@end deftp

@deftp {Scheme Variable} <lambda-case> req opt rest kw inits gensyms body alternate
@deftpx {External Representation} @
  (lambda-case ((@var{req} @var{opt} @var{rest} @var{kw} @var{inits} @var{gensyms})@
                @var{body})@
               [@var{alternate}])
One clause of a @code{case-lambda}.  A @code{lambda} expression in
Scheme is treated as a @code{case-lambda} with one clause.

@var{req} is a list of the procedure's required arguments, as symbols.
@var{opt} is a list of the optional arguments, or @code{#f} if there
are no optional arguments. @var{rest} is the name of the rest
argument, or @code{#f}.

@var{kw} is a list of the form, @code{(@var{allow-other-keys?}
(@var{keyword} @var{name} @var{var}) ...)}, where @var{keyword} is the
keyword corresponding to the argument named @var{name}, and whose
corresponding gensym is @var{var}.  @var{inits} are tree-il expressions
corresponding to all of the optional and keyword arguments, evaluated to
bind variables whose value is not supplied by the procedure caller.
Each @var{init} expression is evaluated in the lexical context of
previously bound variables, from left to right.

@var{gensyms} is a list of gensyms corresponding to all arguments:
first all of the required arguments, then the optional arguments if
any, then the rest argument if any, then all of the keyword arguments.

@var{body} is the body of the clause.  If the procedure is called with
an appropriate number of arguments, @var{body} is evaluated in tail
position.  Otherwise, if there is an @var{alternate}, it should be a
@code{<lambda-case>} expression, representing the next clause to try.
If there is no @var{alternate}, a wrong-number-of-arguments error is
signaled.
@end deftp

@deftp {Scheme Variable} <let> src names gensyms vals exp
@deftpx {External Representation} (let @var{names} @var{gensyms} @var{vals} @var{exp})
Lexical binding, like Scheme's @code{let}.  @var{names} are the original
binding names, @var{gensyms} are gensyms corresponding to the
@var{names}, and @var{vals} are Tree-IL expressions for the values.
@var{exp} is a single Tree-IL expression.
@end deftp

@deftp {Scheme Variable} <letrec> in-order? src names gensyms vals exp
@deftpx {External Representation} (letrec @var{names} @var{gensyms} @var{vals} @var{exp})
@deftpx {External Representation} (letrec* @var{names} @var{gensyms} @var{vals} @var{exp})
A version of @code{<let>} that creates recursive bindings, like
Scheme's @code{letrec}, or @code{letrec*} if @var{in-order?} is true.
@end deftp

@deftp {Scheme Variable} <prompt> escape-only? tag body handler
@deftpx {External Representation} (prompt @var{escape-only?} @var{tag} @var{body} @var{handler})
A dynamic prompt.  Instates a prompt named @var{tag}, an expression,
during the dynamic extent of the execution of @var{body}, also an
expression.  If an abort occurs to this prompt, control will be passed
to @var{handler}, also an expression, which should be a procedure.  The
first argument to the handler procedure will be the captured
continuation, followed by all of the values passed to the abort.  If
@var{escape-only?} is true, the handler should be a @code{<lambda>} with
a single @code{<lambda-case>} body expression with no optional or
keyword arguments, and no alternate, and whose first argument is
unreferenced.  @xref{Prompts}, for more information.
@end deftp

@deftp {Scheme Variable} <abort> tag args tail
@deftpx {External Representation} (abort @var{tag} @var{args} @var{tail})
An abort to the nearest prompt with the name @var{tag}, an expression.
@var{args} should be a list of expressions to pass to the prompt's
handler, and @var{tail} should be an expression that will evaluate to
a list of additional arguments.  An abort will save the partial
continuation, which may later be reinstated, resulting in the
@code{<abort>} expression evaluating to some number of values.
@end deftp

There are two Tree-IL constructs that are not normally produced by
higher-level compilers, but instead are generated during the
source-to-source optimization and analysis passes that the Tree-IL
compiler does.  Users should not generate these expressions directly,
unless they feel very clever, as the default analysis pass will generate
them as necessary.

@deftp {Scheme Variable} <let-values> src names gensyms exp body
@deftpx {External Representation} (let-values @var{names} @var{gensyms} @var{exp} @var{body})
Like Scheme's @code{receive} -- binds the values returned by
evaluating @code{exp} to the @code{lambda}-like bindings described by
@var{gensyms}.  That is to say, @var{gensyms} may be an improper list.

@code{<let-values>} is an optimization of a @code{<call>} to the
primitive, @code{call-with-values}.
@end deftp

@deftp {Scheme Variable} <fix> src names gensyms vals body
@deftpx {External Representation} (fix @var{names} @var{gensyms} @var{vals} @var{body})
Like @code{<letrec>}, but only for @var{vals} that are unset
@code{lambda} expressions.

@code{fix} is an optimization of @code{letrec} (and @code{let}).
@end deftp

Tree-IL is a convenient compilation target from source languages.  It
can be convenient as a medium for optimization, though CPS is usually
better.  The strength of Tree-IL is that it does not fix order of
evaluation, so it makes some code motion a bit easier.

Optimization passes performed on Tree-IL currently include:

@itemize
@item Open-coding (turning toplevel-refs into primitive-refs,
and calls to primitives to primcalls)
@item Partial evaluation (comprising inlining, copy propagation, and
constant folding)
@end itemize

@node Continuation-Passing Style
@subsection Continuation-Passing Style

@cindex CPS
Continuation-passing style (CPS) is Guile's principal intermediate
language, bridging the gap between languages for people and languages
for machines.  CPS gives a name to every part of a program: every
control point, and every intermediate value.  This makes it an excellent
medium for reasoning about programs, which is the principal job of a
compiler.

@menu
* An Introduction to CPS::
* CPS in Guile::
* Building CPS::
* CPS Soup::
* Compiling CPS::
@end menu

@node An Introduction to CPS
@subsubsection An Introduction to CPS

Consider the following Scheme expression:

@lisp
(begin
  (display "The sum of 32 and 10 is: ")
  (display 42)
  (newline))
@end lisp

Let us identify all of the sub-expressions in this expression,
annotating them with unique labels:

@lisp
(begin
  (display "The sum of 32 and 10 is: ")
  |k1      k2
  k0
  (display 42)
  |k4      k5
  k3
  (newline))
  |k7
  k6
@end lisp

Each of these labels identifies a point in a program.  One label may be
the continuation of another label.  For example, the continuation of
@code{k7} is @code{k6}.  This is because after evaluating the value of
@code{newline}, performed by the expression labelled @code{k7}, we
continue to apply it in @code{k6}.

Which expression has @code{k0} as its continuation?  It is either the
expression labelled @code{k1} or the expression labelled @code{k2}.
Scheme does not have a fixed order of evaluation of arguments, though it
does guarantee that they are evaluated in some order.  Unlike general
Scheme, continuation-passing style makes evaluation order explicit.  In
Guile, this choice is made by the higher-level language compilers.

Let us assume a left-to-right evaluation order.  In that case the
continuation of @code{k1} is @code{k2}, and the continuation of
@code{k2} is @code{k0}.

With this example established, we are ready to give an example of CPS in
Scheme:

@smalllisp
(lambda (ktail)
  (let ((k1 (lambda ()
              (let ((k2 (lambda (proc)
                          (let ((k0 (lambda (arg0)
                                      (proc k4 arg0))))
                            (k0 "The sum of 32 and 10 is: ")))))
                (k2 display))))
        (k4 (lambda _
              (let ((k5 (lambda (proc)
                          (let ((k3 (lambda (arg0)
                                      (proc k7 arg0))))
                            (k3 42)))))
                (k5 display))))
        (k7 (lambda _
              (let ((k6 (lambda (proc)
                          (proc ktail))))
                (k6 newline)))))
    (k1))
@end smalllisp

Holy code explosion, Batman!  What's with all the lambdas?  Indeed, CPS
is by nature much more verbose than ``direct-style'' intermediate
languages like Tree-IL.  At the same time, CPS is simpler than full
Scheme, because it makes things more explicit.

In the original program, the expression labelled @code{k0} is in effect
context.  Any values it returns are ignored.  In Scheme, this fact is
implicit.  In CPS, we can see it explicitly by noting that its
continuation, @code{k4}, takes any number of values and ignores them.
Compare this to @code{k2}, which takes a single value; in this way we
can say that @code{k1} is in a ``value'' context.  Likewise @code{k6} is
in tail context with respect to the expression as a whole, because its
continuation is the tail continuation, @code{ktail}.  CPS makes these
details manifest, and gives them names.

@node CPS in Guile
@subsubsection CPS in Guile

@cindex continuation, CPS
Guile's CPS language is composed of @dfn{continuations}.  A continuation
is a labelled program point.  If you are used to traditional compilers,
think of a continuation as a trivial basic block.  A program is a
``soup'' of continuations, represented as a map from labels to
continuations.

@cindex term, CPS
@cindex expression, CPS
Like basic blocks, each continuation belongs to only one function.  Some
continuations are special, like the continuation corresponding to a
function's entry point, or the continuation that represents the tail of
a function.  Others contain a @dfn{term}.  A term contains an
@dfn{expression}, which evaluates to zero or more values.  The term also
records the continuation to which it will pass its values.  Some terms,
like conditional branches, may continue to one of a number of
continuations.

Continuation labels are small integers.  This makes it easy to sort them
and to group them into sets.  Whenever a term refers to a continuation,
it does so by name, simply recording the label of the continuation.
Continuation labels are unique among the set of labels in a program.

Variables are also named by small integers.  Variable names are unique
among the set of variables in a program.

For example, a simple continuation that receives two values and adds
them together can be matched like this, using the @code{match} form from
@code{(ice-9 match)}:

@smallexample
(match cont
  (($ $kargs (x-name y-name) (x-var y-var)
      ($ $continue k src ($ $primcall '+ (x-var y-var))))
   (format #t "Add ~a and ~a and pass the result to label ~a"
           x-var y-var k)))
@end smallexample

Here we see the most common kind of continuation, @code{$kargs}, which
binds some number of values to variables and then evaluates a term.

@deftp {CPS Continuation} $kargs names vars term
Bind the incoming values to the variables @var{vars}, with original
names @var{names}, and then evaluate @var{term}.
@end deftp

The @var{names} of a @code{$kargs} are just for debugging, and will end
up residualized in the object file for use by the debugger.

The @var{term} in a @code{$kargs} is always a @code{$continue}, which
evaluates an expression and continues to a continuation.

@deftp {CPS Term} $continue k src exp
Evaluate the expression @var{exp} and pass the resulting values (if any)
to the continuation labelled @var{k}.  The source information associated
with the expression may be found in @var{src}, which is either an alist
as in @code{source-properties} or is @code{#f} if there is no associated
source.
@end deftp

There are a number of expression kinds.  Above you see an example of
@code{$primcall}.

@deftp {CPS Expression} $primcall name args
Perform the primitive operation identified by @code{name}, a well-known
symbol, passing it the arguments @var{args}, and pass all resulting
values to the continuation.  The set of available primitives includes
all primitives known to Tree-IL and then some more; see the source code
for details.
@end deftp

@cindex dominate, CPS
The variables that are used by @code{$primcall}, or indeed by any
expression, must be defined before the expression is evaluated.  An
equivalent way of saying this is that predecessor @code{$kargs}
continuation(s) that bind the variables(s) used by the expression must
@dfn{dominate} the continuation that uses the expression: definitions
dominate uses.  This condition is trivially satisfied in our example
above, but in general to determine the set of variables that are in
``scope'' for a given term, you need to do a flow analysis to see what
continuations dominate a term.  The variables that are in scope are
those variables defined by the continuations that dominate a term.

Here is an inventory of the kinds of expressions in Guile's CPS
language, besides @code{$primcall} which has already been described.
Recall that all expressions are wrapped in a @code{$continue} term which
specifies their continuation.

@deftp {CPS Expression} $const val
Continue with the constant value @var{val}.
@end deftp

@deftp {CPS Expression} $prim name
Continue with the procedure that implements the primitive operation
named by @var{name}.
@end deftp

@deftp {CPS Expression} $call proc args
Call @var{proc} with the arguments @var{args}, and pass all values to
the continuation.  @var{proc} and the elements of the @var{args} list
should all be variable names.  The continuation identified by the term's
@var{k} should be a @code{$kreceive} or a @code{$ktail} instance.
@end deftp

@deftp {CPS Expression} $values args
Pass the values named by the list @var{args} to the continuation.
@end deftp

@deftp {CPS Expression} $branch kt exp
Evaluate the branching expression @var{exp}, and continue to @var{kt}
with zero values if the test evaluates to true.  Otherwise continue to
the continuation named in the outer @code{$continue} term.

Only certain expressions are valid in a @var{$branch}.  Compiling a
@code{$branch} avoids allocating space for the test variable, so the
expression should be evaluatable without temporary values.  In practice
this condition is true for @code{$primcall}s to @code{null?}, @code{=},
and similar primitives that have corresponding @code{br-if-@var{foo}} VM
operations; see the source code for full details.  When in doubt, bind
the test expression to a variable, and branch on a @code{$values}
expression that references that variable.  The optimizer should inline
the reference if possible.
@end deftp

@deftp {CPS Expression} $prompt escape? tag handler
Push a prompt on the stack identified by the variable name @var{tag},
which may be escape-only if @var{escape?} is true, and continue with
zero values.  If the body aborts to this prompt, control will proceed at
the continuation labelled @var{handler}, which should be a
@code{$kreceive} continuation.  Prompts are later popped by
@code{pop-prompt} primcalls.
@end deftp

@cindex higher-order CPS
@cindex CPS, higher-order
@cindex first-order CPS
@cindex CPS, first-order
There are two sub-languages of CPS, @dfn{higher-order CPS} and
@dfn{first-order CPS}.  The difference is that in higher-order CPS,
there are @code{$fun} and @code{$rec} expressions that bind functions or
mutually-recursive functions in the implicit scope of their use sites.
Guile transforms higher-order CPS into first-order CPS by @dfn{closure
conversion}, which chooses representations for all closures and which
arranges to access free variables through the implicit closure parameter
that is passed to every function call.

@deftp {CPS Expression} $fun body
Continue with a procedure.  @var{body} names the entry point of the
function, which should be a @code{$kfun}.  This expression kind is only
valid in higher-order CPS, which is the CPS language before closure
conversion.
@end deftp

@deftp {CPS Expression} $rec names vars funs
Continue with a set of mutually recursive procedures denoted by
@var{names}, @var{vars}, and @var{funs}.  @var{names} is a list of
symbols, @var{vars} is a list of variable names (unique integers), and
@var{funs} is a list of @code{$fun} values.  Note that the @code{$kargs}
continuation should also define @var{names}/@var{vars} bindings.
@end deftp

The contification pass will attempt to transform the functions declared
in a @code{$rec} into local continuations.  Any remaining @code{$fun}
instances are later removed by the closure conversion pass.  By default,
a closure is represented as an object built by a @code{$closure}
expression.

@deftp {CPS Expression} $closure label nfree
Build a closure that joins the code at the continuation named
@var{label} with space for @var{nfree} free variables.  The variables
will be initialized later via @code{free-set!} primcalls.  This
expression kind is part of first-order CPS.
@end deftp

If the closure can be proven to never escape its scope then other
lighter-weight representations can be chosen.  Additionally, if all call
sites are known, closure conversion will hard-wire the calls by lowering
@code{$call} to @code{$callk}.

@deftp {CPS Expression} $callk label proc args
Like @code{$call}, but for the case where the call target is known to be
in the same compilation unit.  @var{label} should denote some
@code{$kfun} continuation in the program.  In this case the @var{proc}
is simply an additional argument, since it is not used to determine the
call target at run-time.
@end deftp

At this point we have described terms, expressions, and the most common
kind of continuation, @code{$kargs}.  @code{$kargs} is used when the
predecessors of the continuation can be instructed to pass the values
where the continuation wants them.  For example, if a @code{$kargs}
continuation @var{k} binds a variable @var{v}, and the compiler decides
to allocate @var{v} to slot 6, all predecessors of @var{k} should put
the value for @var{v} in slot 6 before jumping to @var{k}.  One
situation in which this isn't possible is receiving values from function
calls.  Guile has a calling convention for functions which currently
places return values on the stack.  A continuation of a call must check
that the number of values returned from a function matches the expected
number of values, and then must shuffle or collect those values to named
variables.  @code{$kreceive} denotes this kind of continuation.

@deftp {CPS Continuation} $kreceive arity k
Receive values on the stack.  Parse them according to @var{arity}, and
then proceed with the parsed values to the @code{$kargs} continuation
labelled @var{k}.  As a limitation specific to @code{$kreceive},
@var{arity} may only contain required and rest arguments.
@end deftp

@code{$arity} is a helper data structure used by @code{$kreceive} and
also by @code{$kclause}, described below.

@deftp {CPS Data} $arity req opt rest kw allow-other-keys?
A data type declaring an arity.  @var{req} and @var{opt} are lists of
source names of required and optional arguments, respectively.
@var{rest} is either the source name of the rest variable, or @code{#f}
if this arity does not accept additional values.  @var{kw} is a list of
the form @code{((@var{keyword} @var{name} @var{var}) ...)}, describing
the keyword arguments.  @var{allow-other-keys?} is true if other keyword
arguments are allowed and false otherwise.

Note that all of these names with the exception of the @var{var}s in the
@var{kw} list are source names, not unique variable names.
@end deftp

Additionally, there are three specific kinds of continuations that are
only used in function entries.

@deftp {CPS Continuation} $kfun src meta self tail clauses
Declare a function entry.  @var{src} is the source information for the
procedure declaration, and @var{meta} is the metadata alist as described
above in Tree-IL's @code{<lambda>}.  @var{self} is a variable bound to
the procedure being called, and which may be used for self-references.
@var{tail} is the label of the @code{$ktail} for this function,
corresponding to the function's tail continuation.  @var{clause} is the
label of the first @code{$kclause} for the first @code{case-lambda}
clause in the function, or otherwise @code{#f}.
@end deftp

@deftp {CPS Continuation} $ktail
A tail continuation.
@end deftp

@deftp {CPS Continuation} $kclause arity cont alternate
A clause of a function with a given arity.  Applications of a function
with a compatible set of actual arguments will continue to the
continuation labelled @var{cont}, a @code{$kargs} instance representing
the clause body.  If the arguments are incompatible, control proceeds to
@var{alternate}, which is a @code{$kclause} for the next clause, or
@code{#f} if there is no next clause.
@end deftp

@node Building CPS
@subsubsection Building CPS

Unlike Tree-IL, the CPS language is built to be constructed and
deconstructed with abstract macros instead of via procedural
constructors or accessors, or instead of S-expression matching.

Deconstruction and matching is handled adequately by the @code{match}
form from @code{(ice-9 match)}.  @xref{Pattern Matching}.  Construction
is handled by a set of mutually builder macros:
@code{build-term}, @code{build-cont}, and @code{build-exp}.

In the following interface definitions, consider @code{term} and
@code{exp} to be built by @code{build-term} or @code{build-exp},
respectively.  Consider any other name to be evaluated as a Scheme
expression.  Many of these forms recognize @code{unquote} in some
contexts, to splice in a previously-built value; see the specifications
below for full details.

@deffn {Scheme Syntax} build-term ,val
@deffnx {Scheme Syntax} build-term ($continue k src exp)
@deffnx {Scheme Syntax} build-exp ,val
@deffnx {Scheme Syntax} build-exp ($const val)
@deffnx {Scheme Syntax} build-exp ($prim name)
@deffnx {Scheme Syntax} build-exp ($branch kt exp)
@deffnx {Scheme Syntax} build-exp ($fun kentry)
@deffnx {Scheme Syntax} build-exp ($rec names syms funs)
@deffnx {Scheme Syntax} build-exp ($closure k nfree)
@deffnx {Scheme Syntax} build-exp ($call proc (arg ...))
@deffnx {Scheme Syntax} build-exp ($call proc args)
@deffnx {Scheme Syntax} build-exp ($callk k proc (arg ...))
@deffnx {Scheme Syntax} build-exp ($callk k proc args)
@deffnx {Scheme Syntax} build-exp ($primcall name (arg ...))
@deffnx {Scheme Syntax} build-exp ($primcall name args)
@deffnx {Scheme Syntax} build-exp ($values (arg ...))
@deffnx {Scheme Syntax} build-exp ($values args)
@deffnx {Scheme Syntax} build-exp ($prompt escape? tag handler)
@deffnx {Scheme Syntax} build-cont ,val
@deffnx {Scheme Syntax} build-cont ($kargs (name ...) (sym ...) term)
@deffnx {Scheme Syntax} build-cont ($kargs names syms term)
@deffnx {Scheme Syntax} build-cont ($kreceive req rest kargs)
@deffnx {Scheme Syntax} build-cont ($kfun src meta self ktail kclause)
@deffnx {Scheme Syntax} build-cont ($kclause ,arity kbody kalt)
@deffnx {Scheme Syntax} build-cont ($kclause (req opt rest kw aok?) kbody)
Construct a CPS term, expression, or continuation.
@end deffn

There are a few more miscellaneous interfaces as well.

@deffn {Scheme Procedure} make-arity req opt rest kw allow-other-keywords?
A procedural constructor for @code{$arity} objects.
@end deffn

@deffn {Scheme Syntax} rewrite-term val (pat term) ...
@deffnx {Scheme Syntax} rewrite-exp val (pat exp) ...
@deffnx {Scheme Syntax} rewrite-cont val (pat cont) ...
Match @var{val} against the series of patterns @var{pat...}, using
@code{match}.  The body of the matching clause should be a template in
the syntax of @code{build-term}, @code{build-exp}, or @code{build-cont},
respectively.
@end deffn

@node CPS Soup
@subsubsection CPS Soup

We describe programs in Guile's CPS language as being a kind of ``soup''
because all continuations in the program are mixed into the same
``pot'', so to speak, without explicit markers as to what function or
scope a continuation is in.  A program in CPS is a map from continuation
labels to continuation values.  As discussed in the introduction, a
continuation label is an integer.  No label may be negative.

As a matter of convention, label 0 should map to the @code{$kfun}
continuation of the entry to the program, which should be a function of
no arguments.  The body of a function consists of the labelled
continuations that are reachable from the function entry.  A program can
refer to other functions, either via @code{$fun} and @code{$rec} in
higher-order CPS, or via @code{$closure} and @code{$callk} in
first-order CPS.  The program logically contains all continuations of
all functions reachable from the entry function.  A compiler pass may
leave unreachable continuations in a program; subsequent compiler passes
should ensure that their transformations and analyses only take
reachable continuations into account.  It's OK though if transformation
runs over all continuations if including the unreachable continuations
has no effect on the transformations on the live continuations.

@cindex intmap
The ``soup'' itself is implemented as an @dfn{intmap}, a functional
array-mapped trie specialized for integer keys.  Intmaps associate
integers with values of any kind.  Currently intmaps are a private data
structure only used by the CPS phase of the compiler.  To work with
intmaps, load the @code{(language cps intmap)} module:

@example
(use-modules (language cps intmap))
@end example

Intmaps are functional data structures, so there is no constructor as
such: one can simply start with the empty intmap and add entries to it.

@example
(intmap? empty-intmap) @result{} #t
(define x (intmap-add empty-intmap 42 "hi"))
(intmap? x) @result{} #t
(intmap-ref x 42) @result{} "hi"
(intmap-ref x 43) @result{} @i{error: 43 not present}
(intmap-ref x 43 (lambda (k) "yo!")) @result{} "yo"
(intmap-add x 42 "hej") @result{} @i{error: 42 already present}
@end example

@code{intmap-ref} and @code{intmap-add} are the core of the intmap
interface.  There is also @code{intmap-replace}, which replaces the
value associated with a given key, requiring that the key was present
already, and @code{intmap-remove}, which removes a key from an intmap.

Intmaps have a tree-like structure that is well-suited to set operations
such as union and intersection, so there is are also the binary
@code{intmap-union} and @code{intmap-intersect} procedures.  If the
result is equivalent to either argument, that argument is returned
as-is; in that way, one can detect whether the set operation produced a
new result simply by checking with @code{eq?}.  This makes intmaps
useful when computing fixed points.

If a key is present in both intmaps and the associated values are not
the same in the sense of @code{eq?}, the resulting value is determined
by a ``meet'' procedure, which is the optional last argument to
@code{intmap-union}, @code{intmap-intersect}, and also to
@code{intmap-add}, @code{intmap-replace}, and similar functions.  The
meet procedure will be called with the two values and should return the
intersected or unioned value in some domain-specific way.  If no meet
procedure is given, the default meet procedure will raise an error.

To traverse over the set of values in an intmap, there are the
@code{intmap-next} and @code{intmap-prev} procedures.  For example, if
intmap @var{x} has one entry mapping 42 to some value, we would have:

@example
(intmap-next x) @result{} 42
(intmap-next x 0) @result{} 42
(intmap-next x 42) @result{} 42
(intmap-next x 43) @result{} #f
(intmap-prev x) @result{} 42
(intmap-prev x 42) @result{} 42
(intmap-prev x 41) @result{} #f
@end example

There is also the @code{intmap-fold} procedure, which folds over keys
and values in the intmap from lowest to highest value, and
@code{intmap-fold-right} which does so in the opposite direction.  These
procedures may take up to 3 seed values.  The number of values that the
fold procedure returns is the number of seed values.

@example
(define q (intmap-add (intmap-add empty-intmap 1 2) 3 4))
(intmap-fold acons q '()) @result{} ((3 . 4) (1 . 2))
(intmap-fold-right acons q '()) @result{} ((1 . 2) (3 . 4))
@end example

When an entry in an intmap is updated (removed, added, or changed), a
new intmap is created that shares structure with the original intmap.
This operation ensures that the result of existing computations is not
affected by future computations: no mutation is ever visible to user
code.  This is a great property in a compiler data structure, as it lets
us hold a copy of a program before a transformation and use it while we
build a post-transformation program.  Updating an intmap is O(log
@var{n}) in the size of the intmap.

However, the O(log @var{n}) allocation costs are sometimes too much,
especially in cases when we know that we can just update the intmap in
place.  As an example, say we have an intmap mapping the integers 1 to
100 to the integers 42 to 141.  Let's say that we want to transform this
map by adding 1 to each value.  There is already an efficient
@code{intmap-map} procedure in the @code{(language cps utils}) module,
but if we didn't know about that we might do:

@example
(define (intmap-increment map)
  (let lp ((k 0) (map map))
    (let ((k (intmap-next map k)))
      (if k
          (let ((v (intmap-ref map k)))
            (lp (1+ k) (intmap-replace map k (1+ v))))
          map))))
@end example

@cindex intmap, transient
@cindex transient intmaps
Observe that the intermediate values created by @code{intmap-replace}
are completely invisible to the program -- only the last result of
@code{intmap-replace} value is needed.  The rest might as well share
state with the last one, and we could update in place.  Guile allows
this kind of interface via @dfn{transient intmaps}, inspired by
Clojure's transient interface (@uref{http://clojure.org/transients}).

The in-place @code{intmap-add!} and @code{intmap-replace!} procedures
return transient intmaps.  If one of these in-place procedures is called
on a normal persistent intmap, a new transient intmap is created.  This
is an O(1) operation.  In all other respects the interface is like their
persistent counterparts, @code{intmap-add} and @code{intmap-replace}.
If an in-place procedure is called on a transient intmap, the intmap is
mutated in-place and the same value is returned.

If a persistent operation like @code{intmap-add} is called on a
transient intmap, the transient's mutable substructure is then marked as
persistent, and @code{intmap-add} then runs on a new persistent intmap
sharing structure but not state with the original transient.  Mutating a
transient will cause enough copying to ensure that it can make its
change, but if part of its substructure is already ``owned'' by it, no
more copying is needed.

We can use transients to make @code{intmap-increment} more efficient.
The two changed elements have been marked @strong{like this}.

@example
(define (intmap-increment map)
  (let lp ((k 0) (map map))
    (let ((k (intmap-next map k)))
      (if k
          (let ((v (intmap-ref map k)))
            (lp (1+ k) (@strong{intmap-replace!} map k (1+ v))))
          (@strong{persistent-intmap} map)))))
@end example

Be sure to tag the result as persistent using the
@code{persistent-intmap} procedure to prevent the mutability from
leaking to other parts of the program.  For added paranoia, you could
call @code{persistent-intmap} on the incoming map, to ensure that if it
were already transient, that the mutations in the body of
@code{intmap-increment} wouldn't affect the incoming value.

In summary, programs in CPS are intmaps whose values are continuations.
See the source code of @code{(language cps utils)} for a number of
useful facilities for working with CPS values.

@node Compiling CPS
@subsubsection Compiling CPS

Compiling CPS in Guile has three phases: conversion, optimization, and
code generation.

CPS conversion is the process of taking a higher-level language and
compiling it to CPS.  Source languages can do this directly, or they can
convert to Tree-IL (which is probably easier) and let Tree-IL convert to
CPS later.  Going through Tree-IL has the advantage of running Tree-IL
optimization passes, like partial evaluation.  Also, the compiler from
Tree-IL to CPS handles assignment conversion, in which assigned local
variables (in Tree-IL, locals that are @code{<lexical-set>}) are
converted to being boxed values on the heap.  @xref{Variables and the
VM}.

After CPS conversion, Guile runs some optimization passes over the CPS.
Most optimization in Guile is done on the CPS language.  The one major
exception is partial evaluation, which for historic reasons is done on
Tree-IL.

The major optimization performed on CPS is contification, in which
functions that are always called with the same continuation are
incorporated directly into a function's body.  This opens up space for
more optimizations, and turns procedure calls into @code{goto}.  It can
also make loops out of recursive function nests.  Guile also does dead
code elimination, common subexpression elimination, loop peeling and
invariant code motion, and range and type inference.

The rest of the optimization passes are really cleanups and
canonicalizations.  CPS spans the gap between high-level languages and
low-level bytecodes, which allows much of the compilation process to be
expressed as source-to-source transformations.  Such is the case for
closure conversion, in which references to variables that are free in a
function are converted to closure references, and in which functions are
converted to closures.  There are a few more passes to ensure that the
only primcalls left in the term are those that have a corresponding
instruction in the virtual machine, and that their continuations expect
the right number of values.

Finally, the backend of the CPS compiler emits bytecode for each
function, one by one.  To do so, it determines the set of live variables
at all points in the function.  Using this liveness information, it
allocates stack slots to each variable, such that a variable can live in
one slot for the duration of its lifetime, without shuffling.  (Of
course, variables with disjoint lifetimes can share a slot.)  Finally
the backend emits code, typically just one VM instruction, for each
continuation in the function.


@node Bytecode
@subsection Bytecode

As mentioned before, Guile compiles all code to bytecode, and that
bytecode is contained in ELF images.  @xref{Object File Format}, for
more on Guile's use of ELF.

To produce a bytecode image, Guile provides an assembler and a linker.

The assembler, defined in the @code{(system vm assembler)} module, has a
relatively straightforward imperative interface.  It provides a
@code{make-assembler} function to instantiate an assembler and a set of
@code{emit-@var{inst}} procedures to emit instructions of each kind.

The @code{emit-@var{inst}} procedures are actually generated at
compile-time from a machine-readable description of the VM.  With a few
exceptions for certain operand types, each operand of an emit procedure
corresponds to an operand of the corresponding instruction.

Consider @code{vector-length}, from @pxref{Miscellaneous Instructions}.
It is documented as:

@deftypefn Instruction {} vector-length u12:@var{dst} u12:@var{src}
@end deftypefn

Therefore the emit procedure has the form:

@deffn {Scheme Procedure} emit-vector-length asm dst src
@end deffn

All emit procedure take the assembler as their first argument, and
return no useful values.

The argument types depend on the operand types.  @xref{Instruction Set}.
Most are integers within a restricted range, though labels are generally
expressed as opaque symbols.

There are a few macro-instructions as well.

@deffn {Scheme Procedure} emit-label asm label
Define a label at the current program point.
@end deffn

@deffn {Scheme Procedure} emit-source asm source
Associate @var{source} with the current program point.
@end deffn

@deffn {Scheme Procedure} emit-cache-current-module! asm module scope
@deffnx {Scheme Procedure} emit-cached-toplevel-box asm dst scope sym bound?
@deffnx {Scheme Procedure} emit-cached-module-box asm dst module-name sym public? bound?
Macro-instructions to implement caching of top-level variables.  The
first takes the current module, in the slot @var{module}, and associates
it with a cache location identified by @var{scope}.  The second takes a
@var{scope}, and resolves the variable.  @xref{Top-Level Environment
Instructions}.  The last does not need a cached module, rather taking
the module name directly.
@end deffn

@deffn {Scheme Procedure} emit-load-constant asm dst constant
Load the Scheme datum @var{constant} into @var{dst}.
@end deffn

@deffn {Scheme Procedure} emit-begin-program asm label properties
@deffnx {Scheme Procedure} emit-end-program asm
Delimit the bounds of a procedure, with the given @var{label} and the
metadata @var{properties}.
@end deffn

@deffn {Scheme Procedure} emit-load-static-procedure asm dst label
Load a procedure with the given @var{label} into local @var{dst}.  This
macro-instruction should only be used with procedures without free
variables -- procedures that are not closures.
@end deffn

@deffn {Scheme Procedure} emit-begin-standard-arity asm req nlocals alternate
@deffnx {Scheme Procedure} emit-begin-opt-arity asm req opt rest nlocals alternate
@deffnx {Scheme Procedure} emit-begin-kw-arity asm req opt rest kw-indices allow-other-keys? nlocals alternate
@deffnx {Scheme Procedure} emit-end-arity asm
Delimit a clause of a procedure.
@end deffn

@deffn {Scheme Procedure} emit-br-if-symbol asm slot invert? label
@deffnx {Scheme Procedure} emit-br-if-variable asm slot invert? label
@deffnx {Scheme Procedure} emit-br-if-vector asm slot invert? label
@deffnx {Scheme Procedure} emit-br-if-string asm slot invert? label
@deffnx {Scheme Procedure} emit-br-if-bytevector asm slot invert? label
@deffnx {Scheme Procedure} emit-br-if-bitvector asm slot invert? label
TC7-specific test-and-branch instructions.  The TC7 is a 7-bit code that
is part of a heap object's type.  @xref{The SCM Type in Guile}.  Also,
@xref{Branch Instructions}.
@end deffn

The linker is a complicated beast.  Hackers interested in how it works
would do well do read Ian Lance Taylor's series of articles on linkers.
Searching the internet should find them easily.  From the user's
perspective, there is only one knob to control: whether the resulting
image will be written out to a file or not.  If the user passes
@code{#:to-file? #t} as part of the compiler options (@pxref{The Scheme
Compiler}), the linker will align the resulting segments on page
boundaries, and otherwise not.

@deffn {Scheme Procedure} link-assembly asm #:page-aligned?=#t
Link an ELF image, and return the bytevector.  If @var{page-aligned?} is
true, Guile will align the segments with different permissions on
page-sized boundaries, in order to maximize code sharing between
different processes.  Otherwise, padding is minimized, to minimize
address space consumption.
@end deffn

To write an image to disk, just use @code{put-bytevector} from
@code{(ice-9 binary-ports)}.

Compiling object code to the fake language, @code{value}, is performed
via loading objcode into a program, then executing that thunk with
respect to the compilation environment. Normally the environment
propagates through the compiler transparently, but users may specify the
compilation environment manually as well, as a module.  Procedures to
load images can be found in the @code{(system vm loader)} module:

@lisp
(use-modules (system vm loader))
@end lisp

@deffn {Scheme Variable} load-thunk-from-file file
@deffnx {C Function} scm_load_thunk_from_file (file)
Load object code from a file named @var{file}. The file will be mapped
into memory via @code{mmap}, so this is a very fast operation.
@end deffn

@deffn {Scheme Variable} load-thunk-from-memory bv
@deffnx {C Function} scm_load_thunk_from_memory (bv)
Load object code from a bytevector.  The data will be copied out of the
bytevector in order to ensure proper alignment of embedded Scheme
values.
@end deffn

Additionally there are procedures to find the ELF image for a given
pointer, or to list all mapped ELF images:

@deffn {Scheme Variable} find-mapped-elf-image ptr
Given the integer value @var{ptr}, find and return the ELF image that
contains that pointer, as a bytevector.  If no image is found, return
@code{#f}.  This routine is mostly used by debuggers and other
introspective tools.
@end deffn

@deffn {Scheme Variable} all-mapped-elf-images
Return all mapped ELF images, as a list of bytevectors.
@end deffn


@node Writing New High-Level Languages
@subsection Writing New High-Level Languages

In order to integrate a new language @var{lang} into Guile's compiler
system, one has to create the module @code{(language @var{lang} spec)}
containing the language definition and referencing the parser,
compiler and other routines processing it. The module hierarchy in
@code{(language brainfuck)} defines a very basic Brainfuck
implementation meant to serve as easy-to-understand example on how to
do this. See for instance @url{http://en.wikipedia.org/wiki/Brainfuck}
for more information about the Brainfuck language itself.


@node Extending the Compiler
@subsection Extending the Compiler

At this point we take a detour from the impersonal tone of the rest of
the manual.  Admit it: if you've read this far into the compiler
internals manual, you are a junkie.  Perhaps a course at your university
left you unsated, or perhaps you've always harbored a desire to hack the
holy of computer science holies: a compiler.  Well you're in good
company, and in a good position.  Guile's compiler needs your help.

There are many possible avenues for improving Guile's compiler.
Probably the most important improvement, speed-wise, will be some form
of native compilation, both just-in-time and ahead-of-time. This could
be done in many ways. Probably the easiest strategy would be to extend
the compiled procedure structure to include a pointer to a native code
vector, and compile from bytecode to native code at run-time after a
procedure is called a certain number of times.

The name of the game is a profiling-based harvest of the low-hanging
fruit, running programs of interest under a system-level profiler and
determining which improvements would give the most bang for the buck.
It's really getting to the point though that native compilation is the
next step.

The compiler also needs help at the top end, enhancing the Scheme that
it knows to also understand R6RS, and adding new high-level compilers.
We have JavaScript and Emacs Lisp mostly complete, but they could use
some love; Lua would be nice as well, but whatever language it is
that strikes your fancy would be welcome too.

Compilers are for hacking, not for admiring or for complaining about.
Get to it!