Download Verified Software: Theories, Tools, Experiments: Third by Gary T. Leavens, Peter O'Hearn, Sriram K Rajamani PDF

By Gary T. Leavens, Peter O'Hearn, Sriram K Rajamani

This quantity comprises the lawsuits of the 3rd operating convention on demonstrated software program: Theories, instruments, and Experiments, VSTTE 2010, held in Edinburgh, united kingdom, in August 2010. The eleven papers offered including three invited talks have been conscientiously revised and chosen for inclusion within the ebook. This 3rd convention is a part of the validated software program Initiative (VSI), that's a fifteen 12 months foreign undertaking that makes a speciality of the clinical and technical demanding situations of manufacturing demonstrated software program. The aim of VSTTE 2010 was once to improve the state-of-the-art within the technology and know-how of software program verification in the course of the interplay of concept improvement, software evolution, and experimental validation. The authorized papers symbolize paintings on verification thoughts, specification languages, formal calculi, verification instruments, recommendations to problem difficulties, software program layout equipment, reusable parts, refinement methodologies, and standards modeling.

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Read or Download Verified Software: Theories, Tools, Experiments: Third International Conference, VSTTE 2010, Edinburgh, UK, August 16-19, 2010, Proceedings (Lecture Notes ... Programming and Software Engineering) PDF

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Extra resources for Verified Software: Theories, Tools, Experiments: Third International Conference, VSTTE 2010, Edinburgh, UK, August 16-19, 2010, Proceedings (Lecture Notes ... Programming and Software Engineering)

Example text

Base case of 0 occurrences is trivial. Let there be n + 1 occurrences of s1 and let the leftmost (s1 ,t) occurrence be in the transition (σi−1 , Δi−1 ) −−−→ (σi , Δi ). Then, by defini(s2 ,t) tion of simulation, either (σi−1 , Δi−1 ) −−−→ (σi , Δi ) holds, or there are two (s2 ,t) states (σi−1 , Δi−1 ), (σi , Δi ) such that (σi−1 , Δi−1 ) −−−→ (σi [err → −1], Δi ), (s2 ,t) (σi−1 [err → 1], Δi−1 ) −−−→ (σi , Δi ), σi−1 (err) = −2, σi (err) = 2. In the former case, we obtain a new failing run with n occurrences of s1 .

A program is failing for an invariant I, if it contains a failing run starting from a state in I; the program is safe for I, otherwise. Remark. Assume that P has a forward failing run. Then, P must have a run l1 l2 (σ0 , Δ0 ) −→ (σj , Δj ) −→ (σk , Δk ) such that (σ0 , Δ0 ) is initial, (σk , Δk ) is final, σi (err) = 1 for all 0 ≤ i < j, and σi (err) = 2 for all j ≤ i ≤ k. This is because every forward failing run necessarily has a prefix where each state has err assigned to 1, the prefix ends at a state which assigns 2 to err and by the definition of valuation updates, it is always possible to extend any run whose end state has err = 2 to a run ending at a final state.

Found <==> (∀j. found following it are combined into a single atomic block using the reduce-sequential rule. Once this level of atomicity is reached, the proof assumption that we had expressed as a tressa annotation is discharged easily by reasoning backwards within the atomic block. 5 Conclusion In this paper, we incorporated backward reasoning into static verification. We achieved this by augmenting the static verification tool QED with a new construct, tressa, along with a new proof rule for the introduction of prophecy variables.

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