Download Automated Technology for Verification and Analysis: 12th by Franck Cassez, Jean-François Raskin (eds.) PDF

By Franck Cassez, Jean-François Raskin (eds.)

This publication constitutes the court cases of the twelfth foreign Symposium on computerized expertise for Verification and research, ATVA 2014, held in Sydney, Australia, in November 2014.

The 29 revised papers provided during this quantity have been rigorously reviewed and chosen from seventy six submissions. They exhibit present learn on theoretical and useful features of computerized research, verification and synthesis through delivering a global discussion board for interplay one of the researchers in academia and industry.

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Read or Download Automated Technology for Verification and Analysis: 12th International Symposium, ATVA 2014, Sydney, NSW, Australia, November 3-7, 2014, Proceedings PDF

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Extra resources for Automated Technology for Verification and Analysis: 12th International Symposium, ATVA 2014, Sydney, NSW, Australia, November 3-7, 2014, Proceedings

Sample text

In all this we have assumed that the automaton reads a k-DST, but that can be arranged using Prop. 5, completing the proof. As an immediate application we have the following theorem. Theorem 9. The bounded split-width reachability problem for SQDS over (A, Σ) is Exptime-complete. The complexity is, however, only polynomial in the size of the SQDS. Reachability problem for S reduces to the emptiness problem for AkS . Notice that an SQMSC M of split-width at most k is accepted by S iff all k-DSTs 12 C.

The SMT-solver is usually very efficient on unsatisfiable proof obligations, but might struggle on satisfiable ones. The BMC analysis executed before this module, however, is generally able to find the corresponding traces, reporting the unsafety of the code before starting this acceleration procedure. , the loops of simple0A -programs. Transition System Generation. If the program is not a simple0A -program or the SMT-solver exploited by the “Acceleration (1)” module times out, the CG of the program is translated into a transition system and then fed into mcmt.

N − 1 loop −−% a s s e r t (B(A( I ) ) = I ) ; end loop ; end P r o p e r t y C h e c k ; ✝ ☎ ✆ The problem is described as follows: Invert an injective (and thus surjective) array A of N elements in the subrange from 0 to N-1. The verification tasks are to prove that the output array B is injective and that B(A(I)) = I for 0 <= I < N. SPARK-BMC succeeds in both tasks for the given bound, with no further annotations in addition to the assumes and asserts shown in the PropertyCheck procedure, which state that the properties described above hold after calls to Invert, for executions corresponding to an injective array A.

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