python-peps/pep-0617.rst

PEP: 0617
Title: New PEG parser for CPython
Version: $Revision$
Last-Modified: $Date$
Author: Guido van Rossum <guido@python.org>,
 Pablo Galindo <pablogsal@gmail.com>,
 Lysandros Nikolaou <lisandrosnik@gmail.com>
Discussions-To: Python-Dev <python-dev@python.org>
Status: Draft
Type: Standards Track
Content-Type: text/x-rst
Created: 24-March-2020
Python-Version: 3.9
Post-History: 02-Apr-2020

========
Overview
========

This PEP proposes to replace the current LL(1)-based parser of CPython
with a new PEG-based parser. This new parser will allow eliminating the multiple
"hacks" that exist in the current grammar to circumvent the LL(1)-limitation
while substantially reducing the maintenance costs in some areas related to the
compiling pipeline such as the grammar, the parser and the AST generation. The new PEG
parser will also lift the LL(1) restriction over the current Python grammar.

===========================
Background on LL(1) parsers
===========================

The current Python grammar is an LL(1)-based grammar. A grammar can be said to be
LL(1) if it can be parsed by an LL(1) parser, which in turn is defined as a
top-down parser that parses the input from left to right, performing leftmost
derivation of the sentence, and can only use one token of lookahead when parsing a
sentence. The traditional approach to construct or generate an LL(1) parser is to
produce a *parse table* which encodes the possible transitions between all possible
states of the parser. These tables are normally constructed from the *first sets*
and the *follow sets* of the grammar:

* Given a rule, the *first set* are the collection of all terminals that can occur
  first in a full derivation of that rule. Intuitively this helps the parser decide
  among multiple alternatives if a rule can have multiple possibilities. For
  instance, given the rule ::

      rule: A | B

  if only ``A`` can start with the terminal *a* and only ``B`` can start with the
  terminal *b* and the parser sees the token *b* when parsing this rule, it knows
  that it needs to follow the non-terminal ``B``.

* Given a rule, the *follow set* are the collection of terminals that can appear
  immediately to the right of that rule in a partial derivation. Intuitively this
  solves the problem in which a rule can expand to the empty string. For instance,
  given this rule::

    rule: A 'b'

  if the parser has the token *b* and the rule A can only start with the token *a*
  we know it is an invalid program but if A can be expanded also to the empty string
  (called an ε-production) then we can consume the next token, 'b'. Therefore, *b*
  is in the *follow set*  of ``A``.


The Python grammar does not allow ε-productions so the *follow sets* are not
needed when creating the parse tables. Currently, in CPython, a parser generator
program reads the grammar and produces a parsing table representing a set of
deterministic finite automata (DFA) that can be included in a C program, the
parser, which is a pushdown automaton that uses this data to produce a Concrete
Syntax Tree (CST) sometimes known directly as a "parse tree". In this process, the
*first sets* are used indirectly when generating the DFAs.

LL(1) parsers and grammars are usually known for being efficient and simple to
implement and generate, but the reality is that expressing some constructs
currently present in the Python language is notably difficult or impossible with
such a restriction. As LL(1) parsers can only look one token ahead to distinguish
possibilities, some rules in the grammar may be ambiguous. For instance the rule::

    rule: A | B

is ambiguous if the *first sets* of both ``A`` and ``B`` have some elements in
common. This is because if the parser sees a token in the input
program that both *A* and *B* can start with it is impossible for it to deduce
which option to expand as no further token of the program can be examined to
disambiguate. As will be shown later in this document, the current LL(1)-based
grammar suffers a lot from this scenario.

Also, it is relevant to note (as other sections of this document will deal with this
concept) that a given grammar cannot be LL(1) if it is left recursive. A grammar is
left-recursive if and only if there exists a nonterminal that can derive to a
sentential form with itself as the leftmost symbol. For instance this rule::

    rule: rule 'a'

is left-recursive because the rule can be expanded to an expression that starts
with itself. As will be described later, left-recursion can be very useful to
express some desired properties directly in the grammar and the lack of
it can lead to some undesired scenarios.

=========================
Background on PEG parsers
=========================

A PEG (Parsing Expression Grammar) grammar differs from a context-free grammar
(like the current one) in the fact that the way it is written more closely
reflects how the parser will operate when parsing it. The fundamental technical
difference is that the choice operator is ordered. This means that when writing::

  rule: A | B | C

a context-free-grammar parser (like an LL(1) parser) will generate constructions
that given an input string will *deduce* which alternative (``A``, ``B`` or ``C``)
must be expanded, while a PEG parser will check if the first alternative succeeds
and only if it fails, will it continue with the second or the third one in the
order in which they are written. This makes the choice operator not commutative.

Unlike LL(1) parsers PEG-based parsers cannot be ambiguous: if a string parses,
it has exactly one valid parse tree. This means that a PEG-based parser cannot
suffer from the ambiguity problems described in the previous section.

PEG parsers are usually constructed as a recursive descent parser in which every
rule in the grammar corresponds to a function in the program implementing the
parser and the parsing expression (the "expansion" or "definition" of the rule)
represents the "code" in said function. Each parsing function conceptually takes
an input string as its argument, and yields one of the following results:

* A "success" result. This result indicates that the expression can be parsed by
  that rule and the function may optionally move forward or consume one or more
  characters of the input string supplied to it.
* A "failure" result, in which case no input is consumed.

Notice that "failure" results do not imply that the program is incorrect or a
parsing failure because as the choice operator is ordered, a "failure" result
merely indicates "try the following option". A direct implementation of a PEG
parser as a recursive descent parser will present exponential time performance in
the worst case as compared with LL(1) parsers, because PEG parsers have infinite lookahead
(this means that they can consider an arbitrary number of tokens before deciding
for a rule). Usually, PEG parsers avoid this exponential time complexity with a
technique called "packrat parsing" [1]_ which not only loads the entire
program in memory before parsing it but also allows the parser to backtrack
arbitrarily. This is made efficient by memoizing the rules already matched for
each position. The cost of the memoization cache is that the parser will naturally
use more memory than a simple LL(1) parser, which normally are table-based. We
will explain later in this document why we consider this cost acceptable.

=========
Rationale
=========

In this section, we describe a list of problems that are present in the current parser
machinery in CPython that motivates the need for a new parser.

---------------------------------
Some rules are not actually LL(1)
---------------------------------

Although the Python grammar is technically an LL(1) grammar (because is parsed by
an LL(1) parser) several rules are not LL(1) and several workarounds are
implemented in the grammar and in other parts of CPython to deal with this. For
example, consider the rule for assignment expressions::

    namedexpr_test: NAME [':=' test]

This simple rule is not compatible with the Python grammar as *NAME* is among the
elements of the *first set* of the rule *test*. To work around this limitation the
actual rule that appears in the current grammar is::

    namedexpr_test: test [':=' test]

Which is a much broader rule than the previous one allowing constructs like ``[x
for x in y] := [1,2,3]``. The way the rule is limited to its desired form is by
disallowing these unwanted constructions when transforming the parse tree to the
abstract syntax tree. This is not only inelegant but a considerable maintenance
burden as it forces the AST creation routines and the compiler into a situation in
which they need to know how to separate valid programs from invalid programs,
which should be a responsibility solely of the parser. This also leads to the
actual grammar file not reflecting correctly what the *actual* grammar is (that
is, the collection of all valid Python programs).

Similar workarounds appear in multiple other rules of the current grammar.
Sometimes this problem is unsolvable. For instance, `bpo-12782: Multiple context
expressions do not support parentheses for continuation across lines
<http://bugs.python.org/issue12782>`_ shows how making an LL(1) rule that supports
writing::

  with (
      open("a_really_long_foo") as foo,
      open("a_really_long_baz") as baz,
      open("a_really_long_bar") as bar
  ):
    ...

is not possible since the first sets of the grammar items that can
appear as context managers include the open parenthesis, making the rule
ambiguous. This rule is not only consistent with other parts of the language (like
the rule for multiple imports), but is also very useful to auto-formatting tools,
as parenthesized groups are normally used to group elements to be
formatted together (in the same way the tools operate on the contents of lists,
sets...).

-----------------------
Complicated AST parsing
-----------------------

Another problem of the current parser is that there is a huge coupling between the
AST generation routines and the particular shape of the produced parse trees. This
makes the code for generating the AST especially complicated as many actions and
choices are implicit. For instance, the AST generation code knows what
alternatives of a certain rule are produced based on the number of child nodes
present in a given parse node. This makes the code difficult to follow as this
property is not directly related to the grammar file and is influenced by
implementation details. As a result of this, a considerable amount of the AST
generation code needs to deal with inspecting and reasoning about the particular
shape of the parse trees that it receives.

----------------------
Lack of left recursion
----------------------

As described previously, a limitation of LL(1) grammars is that they cannot allow
left-recursion. This makes writing some rules very unnatural and far from how
programmers normally think about the program. For instance this construct (a simpler
variation of several rules present in the current grammar)::

  expr: expr '+' term | term

cannot be parsed by an LL(1) parser. The traditional remedy is to rewrite the
grammar to circumvent the problem::

  expr: term ('+' term)*

The problem that appears with this form is that the parse tree is forced to have a
very unnatural shape. This is because with this rule, for the input program ``a +
b + c`` the parse tree will be flattened (``['a', '+', 'b', '+', 'c']``) and must
be post-processed to construct a left-recursive parse tree (``[['a', '+', 'b'],
'+', 'c']``). Being forced to write the second rule not only leads to the parse
tree not correctly reflecting the desired associativity, but also imposes further
pressure on later compilation stages to detect and post-process these cases.

-----------------------
Intermediate parse tree
-----------------------

The last problem present in the current parser is the intermediate creation of a
parse tree or Concrete Syntax Tree that is later transformed to an Abstract Syntax
Tree. Although the construction of a CST is very common in parser and compiler
pipelines, in CPython this intermediate CST is not used by anything else (it is
only indirectly exposed by the *parser* module and a surprisingly small part of
the code in the CST production is reused in the module). Which is worse: the whole
tree is kept in memory, keeping many branches that consist of chains of nodes with
a single child. This has been shown to consume a considerable ammount of memory (for
instance in `bpo-26451: Excessive peak memory consumption by the Python
parser <https://bugs.python.org/issue26415>`_).

Having to produce an intermediate result between the grammar and the AST is not only
undesirable but also makes the AST generation step much more complicated, raising
considerably the maintenance burden.

===========================
The new proposed PEG parser
===========================

The new proposed PEG parser contains the following pieces:

* A parser generator that can read a grammar file and produce a PEG parser
  written in Python or C that can parse said grammar.

* A PEG meta-grammar that automatically generates a Python parser that is used
  for the parser generator itself (this means that there are no manually-written
  parsers).

* A generated parser (using the parser generator) that can directly produce C and
  Python AST objects.

--------------
Left recursion
--------------

PEG parsers normally do not support left recursion but we have implemented a
technique similar to the one described in Medeiros et al. [2]_ but using the
memoization cache instead of static variables. This approach is closer to the one
described in Warth et al. [3]_. This allows us to write not only simple left-recursive
rules but also more complicated rules that involve indirect left-recursion like::

  rule1: rule2 | 'a'
  rule2: rule3 | 'b'
  rule3: rule1 | 'c'

and "hidden left-recursion" like::

  rule: 'optional'? rule '@' some_other_rule

------
Syntax
------

The grammar consists of a sequence of rules of the form: ::

   rule_name: expression

Optionally, a type can be included right after the rule name, which
specifies the return type of the C or Python function corresponding to
the rule: ::

   rule_name[return_type]: expression

If the return type is omitted, then a ``void *`` is returned in C and an
``Any`` in Python.

The full meta-grammar for the grammars supported by the PEG generator is:

::

    start[Grammar]: grammar ENDMARKER { grammar }

    grammar[Grammar]:
        | metas rules { Grammar(rules, metas) }
        | rules { Grammar(rules, []) }

    metas[MetaList]:
        | meta metas { [meta] + metas }
        | meta { [meta] }

    meta[MetaTuple]:
        | "@" NAME NEWLINE { (name.string, None) }
        | "@" a=NAME b=NAME NEWLINE { (a.string, b.string) }
        | "@" NAME STRING NEWLINE { (name.string, literal_eval(string.string)) }

    rules[RuleList]:
        | rule rules { [rule] + rules }
        | rule { [rule] }

    rule[Rule]:
        | rulename ":" alts NEWLINE INDENT more_alts DEDENT {
              Rule(rulename[0], rulename[1], Rhs(alts.alts + more_alts.alts)) }
        | rulename ":" NEWLINE INDENT more_alts DEDENT { Rule(rulename[0], rulename[1], more_alts) }
        | rulename ":" alts NEWLINE { Rule(rulename[0], rulename[1], alts) }

    rulename[RuleName]:
        | NAME '[' type=NAME '*' ']' {(name.string, type.string+"*")}
        | NAME '[' type=NAME ']' {(name.string, type.string)}
        | NAME {(name.string, None)}

    alts[Rhs]:
        | alt "|" alts { Rhs([alt] + alts.alts)}
        | alt { Rhs([alt]) }

    more_alts[Rhs]:
        | "|" alts NEWLINE more_alts { Rhs(alts.alts + more_alts.alts) }
        | "|" alts NEWLINE { Rhs(alts.alts) }

    alt[Alt]:
        | items '$' action { Alt(items + [NamedItem(None, NameLeaf('ENDMARKER'))], action=action) }
        | items '$' { Alt(items + [NamedItem(None, NameLeaf('ENDMARKER'))], action=None) }
        | items action { Alt(items, action=action) }
        | items { Alt(items, action=None) }

    items[NamedItemList]:
        | named_item items { [named_item] + items }
        | named_item { [named_item] }

    named_item[NamedItem]:
        | NAME '=' ~ item {NamedItem(name.string, item)}
        | item {NamedItem(None, item)}
        | it=lookahead {NamedItem(None, it)}

    lookahead[LookaheadOrCut]:
        | '&' ~ atom {PositiveLookahead(atom)}
        | '!' ~ atom {NegativeLookahead(atom)}
        | '~' {Cut()}

    item[Item]:
        | '[' ~ alts ']' {Opt(alts)}
        |  atom '?' {Opt(atom)}
        |  atom '*' {Repeat0(atom)}
        |  atom '+' {Repeat1(atom)}
        |  sep=atom '.' node=atom '+' {Gather(sep, node)}
        |  atom {atom}

    atom[Plain]:
        | '(' ~ alts ')' {Group(alts)}
        | NAME {NameLeaf(name.string) }
        | STRING {StringLeaf(string.string)}

    # Mini-grammar for the actions

    action[str]: "{" ~ target_atoms "}" { target_atoms }

    target_atoms[str]:
        | target_atom target_atoms { target_atom + " " + target_atoms }
        | target_atom { target_atom }

    target_atom[str]:
        | "{" ~ target_atoms "}" { "{" + target_atoms + "}" }
        | NAME { name.string }
        | NUMBER { number.string }
        | STRING { string.string }
        | "?" { "?" }
        | ":" { ":" }


Grammar Expressions
~~~~~~~~~~~~~~~~~~~

``# comment``
'''''''''''''

Python-style comments.

``e1 e2``
'''''''''

Match e1, then match e2.

::

   rule_name: first_rule second_rule

.. _e1-e2-1:

``e1 | e2``
'''''''''''

Match e1 or e2.

The first alternative can also appear on the line after the rule name
for formatting purposes. In that case, a \| must be used before the
first alternative, like so:

::

   rule_name[return_type]:
       | first_alt
       | second_alt

``( e )``
'''''''''

Match e.

::

   rule_name: (e)

A slightly more complex and useful example includes using the grouping
operator together with the repeat operators:

::

   rule_name: (e1 e2)*

``[ e ] or e?``
'''''''''''''''

Optionally match e.

::

   rule_name: [e]

A more useful example includes defining that a trailing comma is
optional:

::

   rule_name: e (',' e)* [',']

.. _e-1:

``e*``
''''''

Match zero or more occurrences of e.

::

   rule_name: (e1 e2)*

.. _e-2:

``e+``
''''''

Match one or more occurrences of e.

::

   rule_name: (e1 e2)+

``s.e+``
''''''''

Match one or more occurrences of e, separated by s. The generated parse
tree does not include the separator. This is otherwise identical to
``(e (s e)*)``.

::

   rule_name: ','.e+

.. _e-3:

``&e``
''''''

Succeed if e can be parsed, without consuming any input.

.. _e-4:

``!e``
''''''

Fail if e can be parsed, without consuming any input.

An example taken from the proposed Python grammar specifies that a primary
consists of an atom, which is not followed by a ``.`` or a ``(`` or a
``[``:

::

   primary: atom !'.' !'(' !'['

.. _e-5:

``~``
''''''

Commit to the current alternative, even if it fails to parse.

::

   rule_name: '(' ~ some_rule ')' | some_alt

In this example, if a left parenthesis is parsed, then the other
alternative won’t be considered, even if some_rule or ‘)’ fail to be
parsed.

Variables in the Grammar
~~~~~~~~~~~~~~~~~~~~~~~~

A subexpression can be named by preceding it with an identifier and an
``=`` sign. The name can then be used in the action (see below), like this: ::

   rule_name[return_type]: '(' a=some_other_rule ')' { a }

---------------
Grammar actions
---------------

To avoid the intermediate steps that obscure the relationship between the
grammar and the AST generation the proposed PEG parser allows directly generating
AST nodes for a rule via grammar actions. Grammar actions are C expressions that
are evaluated when a grammar rule is successfully parsed. This allows to directly
describe how the AST is composed in the grammar itself, making it more clear and
maintainable. This AST generation process is supported by the use of some helper
functions that factor out common AST object manipulations and some other required
operations that are not directly related to the grammar.

To indicate these actions each alternative can be followed by a the action code
inside curly-braces, which specifies the return value of the alternative:::

   rule_name[return_type]:
       | first_alt1 first_alt2 { first_alt1 }
       | second_alt1 second_alt2 { second_alt1 }

If the action is omitted and C code is being generated, then there are two
different possibilities: 1. If there’s a single name in the alternative, this gets
returned. 2. If not, a dummy name object gets returned (this case should be avoided).

If Python code is being generated, then a list with all the parsed
expressions get returned if no action is specified (this is meant for debugging).

As an illustrative example this simple grammar file allows to directly generate a full
parser that can parse simple aritmetic expressions and that returns a valid Python AST:

::

    start[mod_ty]: a=stmt* $ { Module(a, NULL, p->arena) }
    stmt[stmt_ty]: a=expr_stmt { a }
    expr_stmt[stmt_ty]: a=expression NEWLINE { _Py_Expr(a, EXTRA) }
    expression[expr_ty]: ( l=expression '+' r=term { _Py_BinOp(l, Add, r, EXTRA) }
                        | l=expression '-' r=term { _Py_BinOp(l, Sub, r, EXTRA) }
                        | t=term { t }
                        )
    term[expr_ty]: ( l=term '*' r=factor { _Py_BinOp(l, Mult, r, EXTRA }
                  | l=term '/' r=factor { _Py_BinOp(l, Div, r, EXTRA) }
                  | f=factor { f }
                  )
    factor[expr_ty]: ('(' e=expression ')' { e }
                    | a=atom { a }
                    )
    atom[expr_ty]: ( n=NAME { n }
                  | n=NUMBER { n }
                  | s=STRING { s }
                  )

here ``EXTRA`` is a macro that expands to ``start_lineno, start_col_offset,
end_lineno, end_col_offset, p->arena``, being the values for this variables
automatically injected by the parser; ``p`` points to an object
that holds on to all state for the parser.

==============
Migration plan
==============

This section describes the migration plan when porting to the new PEG-based parser
if this PEP is accepted. The migration will be executed in a series of steps that allow
initially to fallback to the previous parser if needed:

1.  Before Python 3.9 beta 1, include the new PEG-based parser machinery in CPython
    with a command-line flag and environment variable that allows switching between
    the new and the old parsers together with explicit APIs that allow invoking the
    new and the old parsers independently. At this step, all Python APIs like ``ast.parse``
    and ``compile`` will use the parser set by the flags or the environment variable and
    the default parser will be the current parser.

2.  After Python 3.9 beta 1 the default parser will be the new parser.

3.  Between Python 3.9 and Python 3.10, the old parser and related code (like the
    "parser" module) will be kept until a new Python release happens (Python 3.10). In
    the meanwhile and until the old parser is removed, **no new Python Grammar
    addition will be added that requires the PEG parser**. This means that the grammar
    will be kept LL(1) until the old parser is removed.

4.  In Python 3.10, remove the old parser, the command-line flag, the environment
    variable and the "parser" module and related code.

==========================
Performance and validation
==========================

We have done extensive timing and validation of the new parser, and
this gives us confidence that the new parser is of high enough quality
to replace the current parser.

----------
Validation
----------

To start with validation, we regularly compile the entire Python 3.8
stdlib and compare every aspect of the resulting AST with that
produced by the standard compiler. (In the process we found a few bugs
in the standard parser's treatment of line and column numbers, which
we have all fixed upstream via a series of issues and PRs.)

We have also occasionally compiled a much larger codebase (the 100
most popular packages on PyPI) and this has helped us find a (very)
few additional bugs in the new parser.

(One area we have not explored extensively is rejection of all wrong
programs. We have unit tests that check for a certain number of
explicit rejections, but more work could be done, e.g. by using a
fuzzer that inserts random subtle bugs into existing code. We're open
to help in this area.)

-----------
Performance
-----------

We have tuned the performance of the new parser to come within 10% of
the current parser both in speed and memory consumption. While the
PEG/packrat parsing algorithm inherently consumes more memory than the
current LL(1) parser, we have an advantage because we don't construct
an intermediate CST.

Below are some benchmarks. These are focused on compiling source code
to bytecode, because this is the most realistic situation. Returning
an AST to Python code is not as representative, because the process to
convert the *internal* AST (only accessible to C code) to an
*external* AST (an instance of ``ast.AST``) takes more time than the
parser itself.

All measurements reported here are done on a recent MacBook Pro,
taking the median of three runs. No particular care was taken to stop
other applications running on the same machine.

The first timings are for our canonical test file, which has 100,000
lines endlessly repeating the following three lines::

    1 + 2 + 4 + 5 + 6 + 7 + 8 + 9 + 10 + ((((((11 * 12 * 13 * 14 * 15 + 16 * 17 + 18 * 19 * 20))))))
    2*3 + 4*5*6
    12 + (2 * 3 * 4 * 5 + 6 + 7 * 8)

- Just parsing and throwing away the internal AST takes 1.16 seconds
  with a max RSS of 681 MiB.

- Parsing and converting to ``ast.AST`` takes 6.34 seconds, max RSS
  1029 MiB.

- Parsing and compiling to bytecode takes 1.28 seconds, max RSS 681
  MiB.

- With the current parser, parsing and compiling takes 1.44 seconds,
  max RSS 836 MiB.

For this particular test file, the new parser is faster and uses less
memory than the current parser (compare the last two bullets).

We also did timings with a more realistic payload, the entire Python
3.8 stdlib. This payload consists of 1,641 files, 749,570 lines,
27,622,497 bytes. (Though 11 files can't be compiled by any Python 3
parser due to encoding issues, sometimes intentional.)

- Compiling and throwing away the internal AST took 2.141 seconds.
  That's 350,040 lines/sec, or 12,899,367 bytes/sec. The max RSS was
  74 MiB (the largest file in the stdlib is much smaller than out
  canonical test file).

- Compiling to bytecode took 3.290 seconds. That's 227,861 lines/sec,
  or 8,396,942 bytes/sec. Max RSS 77 MiB.

- Compiling to bytecode using the current parser took 3.367 seconds.
  That's 222,620 lines/sec, or 8,203,780 bytes/sec. Max RSS 70 MiB.

Comparing the last two bullets we find that the new parser is slightly
faster but uses slightly (about 10%) more memory. We believe this is
acceptable. (Also, there are probably some more tweaks we can make to
reduce memory usage.)

==========
References
==========

.. [1] Ford, Bryan
   http://pdos.csail.mit.edu/~baford/packrat/thesis

.. [2] Medeiros et al.
   https://arxiv.org/pdf/1509.02439v1.pdf

.. [3] Warth et al.
   http://web.cs.ucla.edu/~todd/research/pepm08.pdf

.. [#GUIDO_PEG]
   Guido's series on PEG parsing
   https://medium.com/@gvanrossum_83706/peg-parsing-series-de5d41b2ed60

=========
Copyright
=========

This document has been placed in the public domain.