Range concatenation grammars

Range concatenation grammar (RCG) is a grammar formalism developed by Pierre Boullier ^[1] in 1998 as an attempt to characterize a number of phenomena of natural language, such as Chinese numbers and German word order scrambling, which are outside the bounds of the Mildly context-sensitive languages.^[2]

From a theoretical point of view, any language that can be parsed in polynomial time belongs to the subset of RCG called positive range concatenation grammars, and reciprocally.^[3]

Though intended as a variant on Groenink's Literal movement grammars, RCGs treat the grammatical process more as a proof than as a production. Whereas LMGs produce a terminal string from a start predicate, RCGs aim to reduce a start predicate (which predicates of a terminal string) to the empty string, which constitutes a proof of the terminal strings membership in the language.

Description

Formal definition

A Positive Range Concatenation Grammar (PRCG) is a tuple $G=(N,~T,~V,~S,~P)$ , where:

$N$ , $T$ and $V$ are disjoint finite sets of (respectively) predicate names, terminal symbols and variable names. Each predicate name has an associated arity given by the function $\dim :N\rightarrow \mathbb {N} \setminus \{0\}$ .
$S\in N$ is the start predicate name and verify $\dim(S)=1$ .
$P$ is a finite set of clauses of the form $\psi _{0}\rightarrow \psi _{1}\ldots \psi _{m}$ , where the $\psi_i$ are predicates of the form $A_{i}(\alpha _{1},\ldots ,\alpha _{\dim(A_{i})})$ with $A_{i}\in N$ and $\alpha _{i}\in (T\cup V)^{\star }$ .

A Negative Range Concatenation Grammar (NRCG) is defined like a PRCG, but with the addition that some predicates occurring in the right-hand side of a clause can have the form ${\overline {A_{i}(\alpha _{1},\ldots ,\alpha _{\dim(A_{i})})}}$ . Such predicates are called negative predicates.

A Range Concatenation Grammar is a positive or a negative one. Although PRCGs are technically NRCGs, the terms are used to highlight the absence (PRCG) or presence (NRCG) of negative predicates.

A range in a word $w\in T^{\star }$ is a couple $\langle l,r\rangle _{w}$ , with $0\leq l\leq r\leq n$ , where $n$ is the length of $w$ . Two ranges $\langle l_{1},r_{1}\rangle _{w}$ and $\langle l_{2},r_{2}\rangle _{w}$ can be concatenated iff $r_{1}=l_{2}$ , and we then have: $\langle l_{1},r_{1}\rangle _{w}\cdot \langle l_{2},r_{2}\rangle _{w}=\langle l_{1},r_{2}\rangle _{w}$ .

For a word $w=w_{1}w_{2}\ldots w_{n}$ , with $w_{i}\in T$ , the dotted notation for ranges is: $\langle l,r\rangle _{w}=w_{1}\ldots w_{l-1}\bullet w_{l}\ldots w_{r-1}\bullet w_{r}\ldots w_{n}$ .

Recognition of strings

Like LMGs, RCG clauses have the general schema $A(x_{1},...,x_{n})\to \alpha$ , where in an RCG, $\alpha$ is either the empty string or a string of predicates. The arguments $x_{i}$ consist of strings of terminal symbols and/or variable symbols, which pattern match against actual argument values like in LMG. Adjacent variables constitute a family of matches against partitions, so that the argument $xy$ , with two variables, matches the literal string $ab$ in three different ways: $x=\epsilon ,\ y=ab;\ x=a,\ y=b;\ x=ab,\ y=\epsilon$ .

Predicate terms come in two forms, positive (which produce the empty string on success), and negative (which produce the empty string on failure/if the positive term does not produce the empty string). Negative terms are denoted the same as positive terms, with an overbar, as in ${\overline {A(x_{1},...,x_{n})}}$ .

The rewrite semantics for RCGs is rather simple, identical to the corresponding semantics of LMGs. Given a predicate string $A(\alpha _{1},...,\alpha _{n})$ , where the symbols $\alpha _{i}$ are terminal strings, if there is a rule $A(x_{1},...,x_{n})\to \beta$ in the grammar that the predicate string matches, the predicate string is replaced by $\beta$ , substituting for the matched variables in each $x_{i}$ .

For example, given the rule $A(x,ayb)\to B(axb,y)$ , where $x$ and $y$ are variable symbols and $a$ and $b$ are terminal symbols, the predicate string $A(a,abb)$ can be rewritten as $B(aab,b)$ , because $A(a,abb)$ matches $A(x,ayb)$ when $x=a,\ y=b$ . Similarly, if there were a rule $A(x,ayb)\to A(x,x)\ A(y,y)$ , $A(a,abb)$ could be rewritten as $A(a,a)\ A(b,b)$ .

A proof/recognition of a string $\alpha$ is done by showing that $S(\alpha )$ produces the empty string. For the individual rewrite steps, when multiple alternative variable matches are possible, any rewrite which could lead the whole proof to succeed is considered. Thus, if there is at least one way to produce the empty string from the initial string $S(\alpha )$ , the proof is considered a success, regardless of how many other ways to fail exist.

Example

RCGs are capable of recognizing the non-linear index language $\{www:w\in \{a,b\}^{*}\}$ as follows:

Letting x, y, and z be variable symbols:

$S(xyz)\to A(x,y,z)$

$A(ax,ay,az)\to A(x,y,z)$

$A(bx,by,bz)\to A(x,y,z)$

$A(\epsilon ,\epsilon ,\epsilon )\to \epsilon$

The proof for abbabbabb is then

$S(abbabbabb)\Rightarrow A(abb,abb,abb)\Rightarrow A(bb,bb,bb)\Rightarrow A(b,b,b)\Rightarrow A(\epsilon ,\epsilon ,\epsilon )\Rightarrow \epsilon$

Or, using the more correct dotted notation for ranges:

$S(\bullet {}abbabbabb\bullet {})\Rightarrow A(\bullet {}abb\bullet {}abbabb,abb\bullet {}abb\bullet {}abb,abbabb\bullet {}abb\bullet {})\Rightarrow A(a\bullet {}bb\bullet {}abbabb,abba\bullet {}bb\bullet {}abb,abbabba\bullet {}bb\bullet {})$ $\Rightarrow A(ab\bullet {}b\bullet {}abbabb,abbab\bullet {}b\bullet {}abb,abbabbab\bullet {}b\bullet {})\Rightarrow A(\epsilon ,\epsilon ,\epsilon )\Rightarrow \epsilon$

References

↑ Boullier, Pierre (Jan 1998). Proposal for a Natural Language Processing Syntactic Backbone (PDF) (Technical report). 3342. INRIA Rocquencourt (France).
↑ Pierre Boullier (1999). "Chinese Numbers, MIX, Scrambling, and Range Concatenation Grammars". Proc. EACL (PDF). pp. 53–60.
↑ Laura Kallmeyer (2010). Parsing Beyond Context-Free Grammars. Springer Science & Business Media. p. 37. ISBN 978-3-642-14846-0. citing http://mjn.host.cs.st-andrews.ac.uk/publications/2001d.pdf

Automata theory: formal languages and formal grammars

Chomsky hierarchy	Grammars	Languages	Abstract machines

Type-0 — Type-1 — — — — — Type-2 — — Type-3 — —	Unrestricted (no common name) Context-sensitive Positive range concatenation Indexed — Linear context-free rewriting systems Tree-adjoining Context-free Deterministic context-free Visibly pushdown Regular — Non-recursive	Recursively enumerable Decidable Context-sensitive Positive range concatenation^* Indexed^* — Linear context-free rewriting language Tree-adjoining Context-free Deterministic context-free Visibly pushdown Regular Star-free Finite	Turing machine Decider Linear-bounded PTIME Turing Machine Nested stack Thread automaton restricted Tree stack automaton Embedded pushdown Nondeterministic pushdown Deterministic pushdown Visibly pushdown Finite Counter-free (with aperiodic finite monoid) Acyclic finite

Each category of languages, except those marked by a ^*, is a proper subset of the category directly above it. Any language in each category is generated by a grammar and by an automaton in the category in the same line.

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