Download Model Checking Software: 23rd International Symposium, SPIN by Dragan Bošnački, Anton Wijs PDF

By Dragan Bošnački, Anton Wijs

This ebook constitutes the refereed complaints of the twenty third foreign Symposium on version Checking software program, SPIN 2016, held in Eindhoven, The Netherlands, in April 2016.

The sixteen papers awarded, together with eleven commonplace papers, 1 suggestion paper, and four device demonstrations, have been conscientiously reviewed and chosen from 27 submissions. issues coated comprise version checking ideas, version checking instruments, concurrent process semantics, equivalence checking, temporal logics, probabilistic platforms, time table and method synthesis utilizing version checking, and verification case studies.

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Read or Download Model Checking Software: 23rd International Symposium, SPIN 2016, Co-located with ETAPS 2016, Eindhoven, The Netherlands, April 7-8, 2016, Proceedings PDF

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Extra info for Model Checking Software: 23rd International Symposium, SPIN 2016, Co-located with ETAPS 2016, Eindhoven, The Netherlands, April 7-8, 2016, Proceedings

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Done (d) Model for ¬A ∧ B . Fig. 1. Automata for valid products of M . illustrated in Table 1. Thus, to verify our family M we need to build and analyze models of four distinct, but very similar, programs. We show in Fig. 1, the standard regular-language representation of game semantics for these four programs where concrete values are used [12]. e. infinite-state automata), since we use infinite integers as data type. Hence, they can be used for automatic verification only if the attention is restricted to finite data types.

The following counterexample is generated: run · qy · 0y · readx [0] · 0x [0] · readx [1] · 0x [1] · runabort · doneabort · done. This counterexample is obtained after 2 iterations of the VP, and it corresponds to a computation which runs the body of ‘while’ two times. In the first iteration, an inconsistent unsafe play is found (its condition contains J = 2 ∧ J = 1, where the symbol J tracks the current value of j ). A consistent counterexample is obtained in the first iteration for products A ∧ ¬B ∧ ¬C and ¬A ∧ B ∧ C (for which j is 1), whereas for A ∧ ¬B ∧ C (j is assigned to 3) in the third iteration.

Verification procedure (VP) px px , then s although already visited, has to be re-explored since transitions that were disallowed for px during the first visit of q might be now allowed for px . The complete verification procedure for checking safety of term families is described in Fig. 5. In each iteration, it calls the BFS from Fig. 4 and finds some safe products and (unsafe) products for which a genuine (consistent) counterexample is reported. e. only for configurations with no conclusive results.

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