By George C. Necula, Sumit Gulwani (auth.), Kousha Etessami, Sriram K. Rajamani (eds.)
This quantity includes the complaints of the foreign convention on laptop Aided Veri?cation (CAV), held in Edinburgh, Scotland, July 6–10, 2005. CAV 2005 was once the 17th in a sequence of meetings devoted to the development of the idea and perform of computer-assisted formal an- ysis tools for software program and platforms. The convention lined the spectrum from theoretical effects to concrete functions, with an emphasis on useful veri?cation instruments and the algorithms and strategies which are wanted for his or her implementation. We acquired 123 submissions for normal papers and 32 submissions for instrument papers.Ofthesesubmissions,theProgramCommitteeselected32regularpapers and sixteen device papers, which shaped the technical application of the convention. The convention had 3 invited talks, by way of Bob Bentley (Intel), Bud Mishra (NYU), and George C. Necula (UC Berkeley). The convention used to be preceded by way of an instructional day, with tutorials: – computerized Abstraction Re?nement, by way of Thomas Ball (Microsoft) and Ken McMillan (Cadence); and – thought and perform of choice methods for mixtures of (First- Order) Theories, through Clark Barrett (NYU) and Cesare Tinelli (U Iowa). CAV 2005 had six a?liated workshops: – BMC 2005: third Int. Workshop on Bounded version Checking; – FATES 2005: fifth Workshop on Formal techniques to checking out software program; – GDV 2005: 2d Workshop on video games in layout and Veri?cation; – PDPAR 2005: third Workshop on Pragmatics of choice approaches in - tomated Reasoning; – RV 2005: fifth Workshop on Runtime Veri?cation; and – SoftMC 2005: third Workshop on software program version Checking.
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Additional resources for Computer Aided Verification: 17th International Conference, CAV 2005, Edinburgh, Scotland, UK, July 6-10, 2005. Proceedings
Ball, and B. Cook 1. Partition the set of terms in terms(G) into equivalence classes using the G= predicates. At any point in the algorithm, let EC (t) denote the equivalence class for any term t ∈ terms(G). (a) Initially, each term belongs to its own distinct equivalence class. (b) We deﬁne a procedure merge(t1 , t2 ) that takes two terms as inputs. The procedure ﬁrst merges the equivalence classes of t1 and t2 . If there are two terms . s1 = f (u1 , . . , un ) and s2 = f (v1 , . . , vn ) such that EC (ui ) = EC (vi ), for every 1 ≤ i ≤ n, then it recursively calls merge(s1 , s2 ).
If there are two terms . s1 = f (u1 , . . , un ) and s2 = f (v1 , . . , vn ) such that EC (ui ) = EC (vi ), for every 1 ≤ i ≤ n, then it recursively calls merge(s1 , s2 ). (c) For each t1 = t2 ∈ G= , call merge(t1 , t2 ). 2. If there exists a predicate t1 = t2 in G= , such that EC (t1 ) = EC (t2 ), then return unsatisfiable; else satisfiable. Fig. 5. Simple description of the congruence closure algorithm terms t1 and t2 in terms(G), the predicate t1 = t2 will be derived within 3m iterations of the loop in step 2 of DPT (G) if and only if EC (t1 ) = EC (t2 ) after step (1) of the congruence closure algorithm (the proof can be found in ).
For a set of DIF predicates G, if m is the number of variables in G, then maxDerivDepth T (G) for the DIF theory is bound by lg(m). Complexity of SDPT . Let cmax be the absolute value of the largest constant in the set G. We can ignore any derived predicate in of the form x y + C from the set W where the absolute value of C is greater than (m − 1) ∗ cmax . This is because the maximum weight of any simple path between x and y can be at most (m − 1) ∗ cmax . Again, let const(g) be the absolute value of the constant in a predicate g.
Computer Aided Verification: 17th International Conference, CAV 2005, Edinburgh, Scotland, UK, July 6-10, 2005. Proceedings by George C. Necula, Sumit Gulwani (auth.), Kousha Etessami, Sriram K. Rajamani (eds.)