By Marcelo Finger, Mauricio S. C. Hernandes (auth.), Anuj Dawar, Ruy de Queiroz (eds.)
This booklet is edited in collaboration with FoLLI, the organization of good judgment, Language and knowledge. It constitutes the court cases of the seventeenth foreign Workshop on common sense, Language, details and Computation, WoLLIC 2010, held in Brasilia, Brazil, in July 2010. The publication offers 7 invited talks including thirteen papers which have been rigorously reviewed and chosen from 32 submissions. The papers conceal the most lively components of study at the frontiers among computation, good judgment, and linguistics, with specific curiosity in cross-disciplinary subject matters. standard parts of curiosity are: foundations of computing and programming; novel computation types and paradigms; vast notions of facts and trust; formal equipment in software program and improvement; logical method of traditional language and reasoning; logics of courses, activities and assets; foundational points of data association, seek, circulation, sharing, and safeguard.
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Extra resources for Logic, Language, Information and Computation: 17th International Workshop, WoLLIC 2010, Brasilia, Brazil, July 6-9, 2010. Proceedings
Example text
L and T , s |= EL (ϕRψ) iff ∃i ∈ N with T , si |= ψ and ∀j < i : T , sj |= ϕ ∃π = s0 , a0 , s1 , a1 , . . t. a0 a1 a2 . . t. T , sj |= ϕ ∀π = s0 , a0 , s1 , a1 , . . ∈ ΠT (s) : if a0 a1 a2 . . ∈ L then T , s |= AL (ϕUψ) ∃i ∈ N with T , si |= ψ and ∀j < i : T , sj |= ϕ T , s |= AL (ϕRψ) 3 iff ∀π = s0 , a0 , s1 , a1 , . . ∈ ΠT (s) if a0 a1 a2 . . t. T , sj |= ϕ Examples As a first example, consider an alarm clock T which can be set to count down an arbitrary number of steps and then ring.
Finally, F := F × S × {1}. A similiar construction is available for PDAs. The emptiness check for this ω-PDA can be done in PTIME [3]. Finally, CTL is hard for PTIME. Hence, so is CTLrel [A]. 3 Satisfiability Theorem 4. The satisfiability problem for CTLrel [ωCFL] is undecidable. Proof. ) for context-free languages (of finite words) is undecidable. Now let L ∈ CFL over some Σ and consider the formula ϕL := EΣ ∗ dω F¬q ∧ ALdω Gq. Remember the assumption about paths in CTLrel models being of the form Σ ω ∪ Σ ∗ dω .
Lin CTLrel [A] for Proof. The embedding of CTL is trivial using Σ ω as a quantifier restriction, and writing EXψ as EXa ψ for the unique action a the occurs in the underlying models. For the strictness, consider ϕ:=EL Gtt for a language L ∈ REG. If this formula had an equivalent CTL-formula then there would be also a B¨ uchi tree automaton which recognizes exactly the models of ϕ in a certain representation [18]. Hence, there would also be a B¨ uchi word automaton which accepts precisely the words in L which contradicts L ∈ ωREG.