On Decision Problems for Probabilistic Büchi Automata
|
|
- Preston Freeman
- 6 years ago
- Views:
Transcription
1 On Decision Prolems for Proailistic Büchi Automata Christel Baier 1, Nathalie Bertrand 2, Marcus Größer 1 1 TU Dresden, Germany 2 IRISA, INRIA Rennes, France Cachan 05 février 2008 Séminaire LSV 05/02/08, p.1
2 Introduction Proailistic Büchi Automata [Baier, Größer 05] PBA = NBA with proailities instead of non-determinism Séminaire LSV 05/02/08, p.2
3 Introduction Proailistic Büchi Automata [Baier, Größer 05] PBA = NBA with proailities instead of non-determinism a a a F L(A) = {w Σ ω ρ Runs(w) with ρ = F } Séminaire LSV 05/02/08, p.2
4 Introduction Proailistic Büchi Automata [Baier, Größer 05] PBA = NBA with proailities instead of non-determinism a, 1 2 a,1 a, 1 2 F,1 L(A) = {w Σ ω P A ({ρ Runs(w) ρ = F }) > 0} L NBA (A) = (a + ) a ω = L PBA (A) Séminaire LSV 05/02/08, p.2
5 Introduction Proailistic Büchi Automata [Baier, Größer 05] PBA = NBA with proailities instead of non-determinism c a, 1 2 a, 1 2 Séminaire LSV 05/02/08, p.3
6 Introduction Proailistic Büchi Automata [Baier, Größer 05] PBA = NBA with proailities instead of non-determinism c a, 1 2 a, 1 2 L NBA (A) = (a + ac) ω and L PBA (A) = Séminaire LSV 05/02/08, p.3
7 Introduction Expressiveness: PBA vs DBA PBA are strictly more expressive than DBA any DBA A can e turned into a PBA P Séminaire LSV 05/02/08, p.4
8 Introduction Expressiveness: PBA vs DBA PBA are strictly more expressive than DBA any DBA A can e turned into a PBA P there is a PBA whose language can t e recognized y a DBA a, 1 2 a a, 1 2 L(A) = (a + ) a ω Séminaire LSV 05/02/08, p.4
9 Introduction Expressiveness: PBA vs NBA PBA are strictly more expressive than NBA any NBA A can e turned into a PBA P Trick: replace A y an equivalent NBA deterministic in the limit Séminaire LSV 05/02/08, p.5
10 Introduction Expressiveness: PBA vs NBA PBA are strictly more expressive than NBA any NBA A can e turned into a PBA P Trick: replace A y an equivalent NBA deterministic in the limit there is a PBA whose language can t e recognized y an NBA a, 1 2 a a, 1 2 L(A) = {a k 1 a k 2 i (1 1 2k i ) > 0)} Séminaire LSV 05/02/08, p.5
11 Complementation Outline 1 Introduction 2 Complementation 3 Emptiness prolem Langage dependency on proailities Undecidaility of emptiness 4 Alternative semantics Expressivity Emptiness prolem 5 Conclusion Séminaire LSV 05/02/08, p.6
12 Complementation Complementation Theorem For each PBA P there exists a PBA P with P = O(exp( P ) such that L(P ) = Σ ω \ L(P). Moreover, P can e effectively constructed from P. Séminaire LSV 05/02/08, p.7
13 Complementation Complementation Theorem For each PBA P there exists a PBA P with P = O(exp( P ) such that L(P ) = Σ ω \ L(P). Moreover, P can e effectively constructed from P. Proof Scheme P PBA P R 0/1-PRA with L(P R ) = L(P) 0/1-PRA: Proailistic Rain Automaton s.t. all words have acceptance proaility in {0,1} Séminaire LSV 05/02/08, p.7
14 Complementation Complementation Theorem For each PBA P there exists a PBA P with P = O(exp( P ) such that L(P ) = Σ ω \ L(P). Moreover, P can e effectively constructed from P. Proof Scheme P PBA P R 0/1-PRA with L(P R ) = L(P) P S 0/1-PSA with L(P S ) = Σ ω \ L(P R ) 0/1-PSA: Proailistic Strett Automaton s.t. all words have acceptance proaility in {0,1} Séminaire LSV 05/02/08, p.7
15 Complementation Complementation Theorem For each PBA P there exists a PBA P with P = O(exp( P ) such that L(P ) = Σ ω \ L(P). Moreover, P can e effectively constructed from P. Proof Scheme P PBA P R 0/1-PRA with L(P R ) = L(P) P S 0/1-PSA with L(P S ) = Σ ω \ L(P R ) P PBA with L(P) = L(P S ) Séminaire LSV 05/02/08, p.7
16 Complementation Complementation Theorem For each PBA P there exists a PBA P with P = O(exp( P ) such that L(P ) = Σ ω \ L(P). Moreover, P can e effectively constructed from P. Proof Scheme P PBA P R 0/1-PRA with L(P R ) = L(P) P S 0/1-PSA with L(P S ) = Σ ω \ L(P R ) P PBA with L(P) = L(P S ) Difficult step: PBA equivalent 0/1-PRA Séminaire LSV 05/02/08, p.7
17 Complementation Complementation: First step in details From P uild an equivalent 0/1-PRA. Construction idea: Organize the infinite computation tree into a finite-state automaton y merging runs meeting at some point. Séminaire LSV 05/02/08, p.8
18 Complementation Complementation: First step in details From P uild an equivalent 0/1-PRA. Construction idea: Organize the infinite computation tree into a finite-state automaton y merging runs meeting at some point. States: tuples p 1, ξ 1,, p k, ξ k, R p i Q pairwise distinct, ξ i {0, 1} and R Q. R-component: usual powerset construction p i state witnessing sample runs ξ i it indicating whether the last step is a proper P-transition Séminaire LSV 05/02/08, p.8
19 Complementation Complementation: First step in details From P uild an equivalent 0/1-PRA. Construction idea: Organize the infinite computation tree into a finite-state automaton y merging runs meeting at some point. States: tuples p 1, ξ 1,, p k, ξ k, R p i Q pairwise distinct, ξ i {0, 1} and R Q. R-component: usual powerset construction p i state witnessing sample runs ξ i it indicating whether the last step is a proper P-transition Rain condition: for some index j, the j-th run visits F infinitely often and from some point on the attached it is 0. Séminaire LSV 05/02/08, p.8
20 Complementation Complementation: First step in details (2) Possile a-successors of p = p 1, ξ 1,, p k, ξ k, R : q = q 1, ζ 1,, q k, ζ k, q k+1, ζ k+1 q m, ζ m, S 1. q i δ(p i,a) for 1 i k 2. {q k+1,,q m } = (δ(r,a) F) \ {q 1,,q k } 3. ζ 1 = = ζ k = 0 and ζ k+1 = = ζ m = 1 4. S = δ(r,a) Séminaire LSV 05/02/08, p.9
21 Complementation Complementation: First step in details (2) Possile a-successors of p = p 1, ξ 1,, p k, ξ k, R : q = q 1, ζ 1,, q k, ζ k, q k+1, ζ k+1 q m, ζ m, S 1. q i δ(p i,a) for 1 i k 2. {q k+1,,q m } = (δ(r,a) F) \ {q 1,,q k } 3. ζ 1 = = ζ k = 0 and ζ k+1 = = ζ m = 1 4. S = δ(r,a) P PRA (ρ) > 0 P PBA (ρ) > 0 P PRA (ρ) = 1 Séminaire LSV 05/02/08, p.9
22 Complementation Complementation: First step in details (2) Possile a-successors of p = p 1, ξ 1,, p k, ξ k, R : q = q 1, ζ 1,, q k, ζ k, q k+1, ζ k+1 q m, ζ m, S 1. q i δ(p i,a) for 1 i k 2. {q k+1,,q m } = (δ(r,a) F) \ {q 1,,q k } 3. ζ 1 = = ζ k = 0 and ζ k+1 = = ζ m = 1 4. S = δ(r,a) P PRA (ρ) > 0 P PBA (ρ) > 0 P PRA (ρ) = 1 Example a a q r s L(P) = (a + ) a ω Séminaire LSV 05/02/08, p.9
23 Complementation Complementation: First step in details (3) q, 0, {q} Séminaire LSV 05/02/08, p.10
24 Complementation Complementation: First step in details (3) q, 0, {q} q, 0, r, 1, {q, r} r, 0, {q, r} Séminaire LSV 05/02/08, p.10
25 Complementation Complementation: First step in details (3) q, 0, {q} q, 0, r, 1, {q, r} q,0, s,0, {q, s} q, 0, r, 0, {q, r} r, 0, {q, r} Séminaire LSV 05/02/08, p.10
26 Complementation Complementation: First step in details (3) a q, 0, {q} q, 0, r, 1, {q, r} q,0, s,0, {q, s} q, 0, r, 0, {q, r} q, 0, s, 0, r, 1, {q, r, s} r, 0, {q, r} s, 0, {q, s} r, 0, s, 0, {q, r, s} a a a s,0, r, 1, {q,r, s} s,0, r, 0, {q,r, s} q, 0, s, 0, r, 0, {q, r, s} a Séminaire LSV 05/02/08, p.10
27 Complementation Complementation: First step in details (3) a q, 0, {q} q, 0, r, 1, {q, r} q,0, s,0, {q, s} q, 0, r, 0, {q, r} q, 0, s, 0, r, 1, {q, r, s} r, 0, {q, r} s, 0, {q, s} r, 0, s, 0, {q, r, s} a a a s,0, r, 1, {q,r, s} s,0, r, 0, {q,r, s} q, 0, s, 0, r, 0, {q, r, s} P PR (aa ω ) > 0 a Séminaire LSV 05/02/08, p.10
28 Complementation Complementation: First step in details (3) a q, 0, {q} q, 0, r, 1, {q, r} q,0, s,0, {q, s} q, 0, r, 0, {q, r} q, 0, s, 0, r, 1, {q, r, s} r, 0, {q, r} s, 0, {q, s} r, 0, s, 0, {q, r, s} a a a s,0, r, 1, {q,r, s} s,0, r, 0, {q,r, s} q, 0, s, 0, r, 0, {q, r, s} P PR (aa ω ) = 1 a Séminaire LSV 05/02/08, p.10
29 Emptiness prolem Outline 1 Introduction 2 Complementation 3 Emptiness prolem Langage dependency on proailities Undecidaility of emptiness 4 Alternative semantics Expressivity Emptiness prolem 5 Conclusion Séminaire LSV 05/02/08, p.11
30 Emptiness prolem A weird example a, λ a a, 1 λ P λ : q r L(P λ ) = {a k 1 a k 2 i (1 λk i) > 0)} Séminaire LSV 05/02/08, p.12
31 Emptiness prolem A weird example a, λ a a, 1 λ P λ : q r L(P λ ) = {a k 1 a k 2 i (1 λk i) > 0)} Lemma For 0 < λ < 1 2 < µ < 1, L(P λ) L(P µ ). Hint w = a k 1 a k 2 with for all m, 2 m elements of (k i ) set to m. w L(P λ ) \ L(P µ ) Séminaire LSV 05/02/08, p.12
32 Emptiness prolem An undecidale prolem for PFA The emptiness prolem is undecidale for Proailistic Finite Automata (as well as some variants). Séminaire LSV 05/02/08, p.13
33 Emptiness prolem An undecidale prolem for PFA The emptiness prolem is undecidale for Proailistic Finite Automata (as well as some variants). Undecidaility result for PFA [MHC03] The following prolem is undecidale: Given 0 < ε < 1 and P a PFA such that either w P P (w) > 1 ε or w P P (w) ε tell which is the case. Séminaire LSV 05/02/08, p.13
34 Emptiness prolem Emptiness prolem for PBA Theorem The emptiness prolem is undecidale for PBA. Séminaire LSV 05/02/08, p.14
35 Emptiness prolem Emptiness prolem for PBA Theorem The emptiness prolem is undecidale for PBA. Proof Sketch Reduction of the modified emptiness prolem for PFA Séminaire LSV 05/02/08, p.14
36 Emptiness prolem Emptiness prolem for PBA Theorem The emptiness prolem is undecidale for PBA. Proof Sketch Reduction of the modified emptiness prolem for PFA { w P R (w) ε or R PFA with w P R (w) > 1 ε P 1 and P 2 PBA s.t. L >ε (R) = L(P 1 ) L(P 2 ) = Séminaire LSV 05/02/08, p.14
37 Emptiness prolem Proof in more details: P 1 a, λ a q a, 1 λ r L(P λ ) = {a k1 a k2 i (1 λk i ) > 0)} Séminaire LSV 05/02/08, p.15
38 Emptiness prolem Proof in more details: P 1 a, λ a a, 1 λ L(P λ ) = {a k1 a k2 q i (1 λk i r ) > 0)} P 1 : s 0 R q, 1, 1 s 0, 1 p p f $, 1 R r, 1 f $, 1 F From s 0 in R q, reading w# leads to R r with proaility P R (w). a w λ 1 P R (w) $$ $, 1 $, 1 Séminaire LSV 05/02/08, p.15
39 Emptiness prolem Proof in more details: P 1 a, λ a a, 1 λ L(P λ ) = {a k1 a k2 q i (1 λk i r ) > 0)} P 1 : s 0 R q, 1, 1 s 0, 1 p p f $, 1 R r, 1 f $, 1 F From s 0 in R q, reading w# leads to R r with proaility P R (w). a w λ 1 P R (w) $$ j $, 1 $, 1 L(P 1 ) = {w1 1# w1 k 1 $$w1 2# w2 k 2 $$ ( 1 ( k j 1 i=1 (1 P R(w j i )))) > 0} Séminaire LSV 05/02/08, p.15
40 Emptiness prolem Proof in more details: P 2 Σ,1 Σ, 1, ε, 1 ε p 0 p 1, 1 P 2 : $$, 1 Σ, 1 Σ, 1 $$, 1 F p 2 From p 0, reading v (Σ {#}) leads to p 1 with proaility 1 (1 ε) v i # Séminaire LSV 05/02/08, p.16
41 Emptiness prolem Proof in more details: P 2 Σ,1 Σ, 1, ε, 1 ε p 0 p 1, 1 P 2 : $$, 1 Σ, 1 Σ, 1 $$, 1 F p 2 From p 0, reading v (Σ {#}) leads to p 1 with proaility 1 (1 ε) v i # L(P 2 ) = {v 1 $$v 2 $$ v i (Σ #) and i (1 (1 ε) v i # ) = 0} Séminaire LSV 05/02/08, p.16
42 Emptiness prolem Proof in more details: P 2 Σ,1 Σ, 1, ε, 1 ε p 0 p 1, 1 P 2 : $$, 1 Σ, 1 Σ, 1 $$, 1 F p 2 From p 0, reading v (Σ {#}) leads to p 1 with proaility 1 (1 ε) v i # L(P 2 ) = {w 1 1 # w1 k 1 $$w 2 1 # w2 k 2 $$ i (1 (1 ε)k i 1 ) = 0} Séminaire LSV 05/02/08, p.16
43 Emptiness prolem Proof conclusion L(P 1) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q j 1 `Q )) k j 1 i=1 (1 PR(wj i > 0} L(P 2) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q i (1 (1 ε)k i 1 ) = 0} Séminaire LSV 05/02/08, p.17
44 Emptiness prolem Proof conclusion L(P 1) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q j 1 `Q )) k j 1 i=1 (1 PR(wj i > 0} L(P 2) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q i (1 (1 ε)k i 1 ) = 0} If w, P R (w) ε w, w L(P 2 ) w / L(P 1 ) = L(P 1 ) L(P 2 ) = Séminaire LSV 05/02/08, p.17
45 Emptiness prolem Proof conclusion L(P 1) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q j 1 `Q )) k j 1 i=1 (1 PR(wj i > 0} L(P 2) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q i (1 (1 ε)k i 1 ) = 0} If w, P R (w) ε w, w L(P 2 ) w / L(P 1 ) = L(P 1 ) L(P 2 ) = If w, P R (w) > 1 ε Let w = (w#) k1 w$$(w#) k2 w$$ P P1 ( w) > j (1 εk j 1 ) and P P2 ( w) = i (1 (1 ε)k i 1 ) = L(P 1 ) L(P 2 ) Séminaire LSV 05/02/08, p.17
46 Emptiness prolem Proof conclusion L(P 1) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q j 1 `Q )) k j 1 i=1 (1 PR(wj i > 0} L(P 2) = {w1# w 1 k 1 1 $$w1# w 2 k 2 2 $$ Q i (1 (1 ε)k i 1 ) = 0} If w, P R (w) ε w, w L(P 2 ) w / L(P 1 ) = L(P 1 ) L(P 2 ) = If w, P R (w) > 1 ε Let w = (w#) k1 w$$(w#) k2 w$$ P P1 ( w) > j (1 εk j 1 ) and P P2 ( w) = i (1 (1 ε)k i 1 ) = L(P 1 ) L(P 2 ) L >ε (R) = L(P 1 ) L(P 2 ) = Séminaire LSV 05/02/08, p.17
47 Emptiness prolem PBA-related Consequences Immediate consequences of the undecidaility result. Corollary The following prolems are undecidale. Given P 1 and P 2 PBA L(P 1 ) = Σ ω? L(P 1 ) = L(P 2 )? L(P 1 ) L(P 2 )? Séminaire LSV 05/02/08, p.18
48 Emptiness prolem PBA-related Consequences Immediate consequences of the undecidaility result. Corollary The following prolems are undecidale. Given P 1 and P 2 PBA L(P 1 ) = Σ ω? L(P 1 ) = L(P 2 )? L(P 1 ) L(P 2 )? Verification against PBA specifications The following prolems are undecidale. Given a transition system T and a PBA P is there a path in T whose trace is in L(P)? do the traces of all paths in T elong to L(P)? Séminaire LSV 05/02/08, p.18
49 Emptiness prolem Consequences for POMDP Partially Oservale MDP A POMDP (M, ) consists of an MDP M equipped with an equivalence relation over states of M. Séminaire LSV 05/02/08, p.19
50 Emptiness prolem Consequences for POMDP Partially Oservale MDP A POMDP (M, ) consists of an MDP M equipped with an equivalence relation over states of M. Undecidaility results The following prolems are undecidale Given (M, ) and F set of states of M, is there an oservation-ased U such that P U ( F) > 0. Given (M, ) and F set of states of M, is there an oservation-ased U such that P U ( F) = 1. Séminaire LSV 05/02/08, p.19
51 Emptiness prolem Consequences for POMDP Partially Oservale MDP A POMDP (M, ) consists of an MDP M equipped with an equivalence relation over states of M. Undecidaility results The following prolems are undecidale Given (M, ) and F set of states of M, is there an oservation-ased U such that P U ( F) > 0. Given (M, ) and F set of states of M, is there an oservation-ased U such that P U ( F) = 1. First undecidaility results in qualitative verification of POMDP. Séminaire LSV 05/02/08, p.19
52 Alternative semantics Outline 1 Introduction 2 Complementation 3 Emptiness prolem Langage dependency on proailities Undecidaility of emptiness 4 Alternative semantics Expressivity Emptiness prolem 5 Conclusion Séminaire LSV 05/02/08, p.20
53 Alternative semantics Almost-sure semantics for PBA Alternative semantics L(A) = {w Σ ω P A ({ρ Runs(w) ρ = F })= 1} Séminaire LSV 05/02/08, p.21
54 Alternative semantics Almost-sure semantics for PBA Alternative semantics L(A) = {w Σ ω P A ({ρ Runs(w) ρ = F })= 1} Expressivity almost-sure PBA are strictly less expressive than PBA almost-sure PBA and ω-regular languages are incomparale almost-sure PBA are not closed under complementation Séminaire LSV 05/02/08, p.21
55 Alternative semantics Recap: expressivity (a + ) a ω PBA PBA =1 DBA NBA {a k 1 a k 2 i (1 λk i) = 0} {a k 1 a k 2 i (1 λk i) > 0} Séminaire LSV 05/02/08, p.22
56 Alternative semantics Emptiness prolem and related results Decidaility result for POMDP Almost-sure reachaility in POMDP is decidale (EXPTIME). Séminaire LSV 05/02/08, p.23
57 Alternative semantics Emptiness prolem and related results Decidaility result for POMDP Almost-sure reachaility in POMDP is decidale (EXPTIME). Corollary The emptiness prolem is decidale for almost-sure PBA. Proof Sketch for PBA almost-sure reachaility and almost-sure repeated reachaility are interreducile PBA are a special instance of POMDP Séminaire LSV 05/02/08, p.23
58 Conclusion Outline 1 Introduction 2 Complementation 3 Emptiness prolem Langage dependency on proailities Undecidaility of emptiness 4 Alternative semantics Expressivity Emptiness prolem 5 Conclusion Séminaire LSV 05/02/08, p.24
59 Conclusion Conclusion Results concerning PBA complementation operator emptiness (and related prolems) undecidale for PBA expressivity of almost-sure PBA emptiness decidale for almost-sure PBA Séminaire LSV 05/02/08, p.25
60 Conclusion Conclusion Results concerning PBA complementation operator emptiness (and related prolems) undecidale for PBA expressivity of almost-sure PBA emptiness decidale for almost-sure PBA Results concerning POMDP positive repeated reachaility undecidale for POMDP almost-sure reachaility decidale for POMDP Séminaire LSV 05/02/08, p.25
61 Conclusion Conclusion Results concerning PBA complementation operator emptiness (and related prolems) undecidale for PBA expressivity of almost-sure PBA emptiness decidale for almost-sure PBA Results concerning POMDP positive repeated reachaility undecidale for POMDP almost-sure reachaility decidale for POMDP Open questions emptiness prolem for PBA with small alphaet efficient transformation from LTL to PBA Séminaire LSV 05/02/08, p.25
62 Conclusion Thank you for your attention! Questions? Séminaire LSV 05/02/08, p.26
On Decision Problems for Probabilistic Büchi Automata
On Decision Problems for Probabilistic Büchi Automata Christel Baier a, Nathalie Bertrand a,b, and Marcus Größer a a Technische Universität Dresden, Germany b IRISA/INRIA Rennes, France Abstract. Probabilistic
More informationControlling probabilistic systems under partial observation an automata and verification perspective
Controlling probabilistic systems under partial observation an automata and verification perspective Nathalie Bertrand, Inria Rennes, France Uncertainty in Computation Workshop October 4th 2016, Simons
More informationProbabilistic Acceptors for Languages over Infinite Words
Probabilistic Acceptors for Languages over Infinite Words Christel Baier 1, Nathalie Bertrand 2, and Marcus Größer 1 1 Technical University Dresden, Faculty Computer Science, Germany 2 INRIA Rennes Bretagne
More informationOn Model Checking Techniques for Randomized Distributed Systems. Christel Baier Technische Universität Dresden
On Model Checking Techniques for Randomized Distributed Systems Christel Baier Technische Universität Dresden joint work with Nathalie Bertrand Frank Ciesinski Marcus Größer / 6 biological systems, resilient
More informationDefinition of Büchi Automata
Büchi Automata Definition of Büchi Automata Let Σ = {a,b,...} be a finite alphabet. By Σ ω we denote the set of all infinite words over Σ. A non-deterministic Büchi automaton (NBA) over Σ is a tuple A
More informationAutomata, Logic and Games: Theory and Application
Automata, Logic and Games: Theory and Application 2 Parity Games, Tree Automata, and S2S Luke Ong University of Oxford TACL Summer School University of Salerno, 14-19 June 2015 Luke Ong S2S 14-19 June
More informationω-automata Automata that accept (or reject) words of infinite length. Languages of infinite words appear:
ω-automata ω-automata Automata that accept (or reject) words of infinite length. Languages of infinite words appear: in verification, as encodings of non-terminating executions of a program. in arithmetic,
More informationProbabilistic ω-automata
1 Probabilistic ω-automata CHRISTEL BAIER and MARCUS GRÖSSER, Technische Universität Dresden, Germany NATHALIE BERTRAND, INRIARennesBretagneAtlantique,France Probabilistic ω-automata are variants of nondeterministic
More informationProbabilistic Büchi Automata with non-extremal acceptance thresholds
Probabilistic Büchi Automata with non-extremal acceptance thresholds Rohit Chadha 1, A. Prasad Sistla, and Mahesh Viswanathan 3 1 LSV, ENS Cachan & CNRS & INRIA Saclay, France Univ. of IIlinois, Chicago,
More informationRandomness for Free. 1 Introduction. Krishnendu Chatterjee 1, Laurent Doyen 2, Hugo Gimbert 3, and Thomas A. Henzinger 1
Randomness for Free Krishnendu Chatterjee 1, Laurent Doyen 2, Hugo Gimbert 3, and Thomas A. Henzinger 1 1 IST Austria (Institute of Science and Technology Austria) 2 LSV, ENS Cachan & CNRS, France 3 LaBri
More informationDistributed Timed Automata with Independently Evolving Clocks
Distriuted Timed Automata with Independently Evolving Clocks S. Akshay,3, Benedikt Bollig, Paul Gastin, Madhavan Mukund 2, and K. Narayan Kumar 2 LSV, ENS Cachan, CNRS, France {akshay,ollig,gastin}@lsv.ens-cachan.fr
More informationA Survey of Partial-Observation Stochastic Parity Games
Noname manuscript No. (will be inserted by the editor) A Survey of Partial-Observation Stochastic Parity Games Krishnendu Chatterjee Laurent Doyen Thomas A. Henzinger the date of receipt and acceptance
More informationAlternating nonzero automata
Alternating nonzero automata Application to the satisfiability of CTL [,, P >0, P =1 ] Hugo Gimbert, joint work with Paulin Fournier LaBRI, Université de Bordeaux ANR Stoch-MC 06/07/2017 Control and verification
More informationAutomata-based Verification - III
COMP30172: Advanced Algorithms Automata-based Verification - III Howard Barringer Room KB2.20: email: howard.barringer@manchester.ac.uk March 2009 Third Topic Infinite Word Automata Motivation Büchi Automata
More informationLanguages. A language is a set of strings. String: A sequence of letters. Examples: cat, dog, house, Defined over an alphabet:
Languages 1 Languages A language is a set of strings String: A sequence of letters Examples: cat, dog, house, Defined over an alphaet: a,, c,, z 2 Alphaets and Strings We will use small alphaets: Strings
More informationFlat counter automata almost everywhere!
Flat counter automata almost everywhere! Jérôme Leroux and Grégoire Sutre Projet Vertecs, IRISA / INRIA Rennes, FRANCE Équipe MVTsi, CNRS / LABRI, FRANCE Counter-automata verification A simple counter-automata:
More informationLogic Model Checking
Logic Model Checking Lecture Notes 10:18 Caltech 101b.2 January-March 2004 Course Text: The Spin Model Checker: Primer and Reference Manual Addison-Wesley 2003, ISBN 0-321-22862-6, 608 pgs. the assignment
More informationPOWER OF RANDOMIZATION IN AUTOMATA ON INFINITE STRINGS
Logical Methods in Computer Science Vol. 7 (3:22) 2011, pp. 1 31 www.lmcs-online.org Submitted Mar. 8, 2011 Published Sep. 29, 2011 POWER OF RANDOMIZATION IN AUTOMATA ON INFINITE STRINGS ROHIT CHADHA a,
More informationChapter 3: Linear temporal logic
INFOF412 Formal verification of computer systems Chapter 3: Linear temporal logic Mickael Randour Formal Methods and Verification group Computer Science Department, ULB March 2017 1 LTL: a specification
More informationBüchi Automata and their closure properties. - Ajith S and Ankit Kumar
Büchi Automata and their closure properties - Ajith S and Ankit Kumar Motivation Conventional programs accept input, compute, output result, then terminate Reactive program : not expected to terminate
More informationIntroduction to weighted automata theory
Introduction to weighted automata theory Lectures given at the 19th Estonian Winter School in Computer Science Jacques Sakarovitch CNRS / Telecom ParisTech Based on Chapter III Chapter 4 The presentation
More informationCS256/Spring 2008 Lecture #11 Zohar Manna. Beyond Temporal Logics
CS256/Spring 2008 Lecture #11 Zohar Manna Beyond Temporal Logics Temporal logic expresses properties of infinite sequences of states, but there are interesting properties that cannot be expressed, e.g.,
More informationQuasi-Weak Cost Automata
Quasi-Weak Cost Automata A New Variant of Weakness Denis Kuperberg 1 Michael Vanden Boom 2 1 LIAFA/CNRS/Université Paris 7, Denis Diderot, France 2 Department of Computer Science, University of Oxford,
More informationVisibly Linear Dynamic Logic
Visibly Linear Dynamic Logic Joint work with Alexander Weinert (Saarland University) Martin Zimmermann Saarland University September 8th, 2016 Highlights Conference, Brussels, Belgium Martin Zimmermann
More informationClasses and conversions
Classes and conversions Regular expressions Syntax: r = ε a r r r + r r Semantics: The language L r of a regular expression r is inductively defined as follows: L =, L ε = {ε}, L a = a L r r = L r L r
More informationAutomata-based Verification - III
CS3172: Advanced Algorithms Automata-based Verification - III Howard Barringer Room KB2.20/22: email: howard.barringer@manchester.ac.uk March 2005 Third Topic Infinite Word Automata Motivation Büchi Automata
More informationClosure Properties of Regular Languages. Union, Intersection, Difference, Concatenation, Kleene Closure, Reversal, Homomorphism, Inverse Homomorphism
Closure Properties of Regular Languages Union, Intersection, Difference, Concatenation, Kleene Closure, Reversal, Homomorphism, Inverse Homomorphism Closure Properties Recall a closure property is a statement
More informationFinite Automata and Regular Languages (part II)
Finite Automata and Regular Languages (part II) Prof. Dan A. Simovici UMB 1 / 25 Outline 1 Nondeterministic Automata 2 / 25 Definition A nondeterministic finite automaton (ndfa) is a quintuple M = (A,
More informationChapter 3. Regular grammars
Chapter 3 Regular grammars 59 3.1 Introduction Other view of the concept of language: not the formalization of the notion of effective procedure, but set of words satisfying a given set of rules Origin
More informationDeciding the weak definability of Büchi definable tree languages
Deciding the weak definability of Büchi definable tree languages Thomas Colcombet 1,DenisKuperberg 1, Christof Löding 2, Michael Vanden Boom 3 1 CNRS and LIAFA, Université Paris Diderot, France 2 Informatik
More informationFinite Automata and Languages
CS62, IIT BOMBAY Finite Automata and Languages Ashutosh Trivedi Department of Computer Science and Engineering, IIT Bombay CS62: New Trends in IT: Modeling and Verification of Cyber-Physical Systems (2
More informationAutomata on Infinite words and LTL Model Checking
Automata on Infinite words and LTL Model Checking Rodica Condurache Lecture 4 Lecture 4 Automata on Infinite words and LTL Model Checking 1 / 35 Labeled Transition Systems Let AP be the (finite) set of
More informationReal-Time Systems. Lecture 15: The Universality Problem for TBA Dr. Bernd Westphal. Albert-Ludwigs-Universität Freiburg, Germany
Real-Time Systems Lecture 15: The Universality Problem for TBA 2013-06-26 15 2013-06-26 main Dr. Bernd Westphal Albert-Ludwigs-Universität Freiburg, Germany Contents & Goals Last Lecture: Extended Timed
More information5 3 Watson-Crick Automata with Several Runs
5 3 Watson-Crick Automata with Several Runs Peter Leupold Department of Mathematics, Faculty of Science Kyoto Sangyo University, Japan Joint work with Benedek Nagy (Debrecen) Presentation at NCMA 2009
More informationReversal of regular languages and state complexity
Reversal of regular languages and state complexity Juraj Šeej Institute of Computer Science, Faculty of Science, P. J. Šafárik University Jesenná 5, 04001 Košice, Slovakia juraj.seej@gmail.com Astract.
More informationAutomata, Logic and Games: Theory and Application
Automata, Logic and Games: Theory and Application 1. Büchi Automata and S1S Luke Ong University of Oxford TACL Summer School University of Salerno, 14-19 June 2015 Luke Ong Büchi Automata & S1S 14-19 June
More informationOn the Accepting Power of 2-Tape Büchi Automata
On the Accepting Power of 2-Tape Büchi Automata Equipe de Logique Mathématique Université Paris 7 STACS 2006 Acceptance of infinite words In the sixties, Acceptance of infinite words by finite automata
More informationApplied Automata Theory
Applied Automata Theory Roland Meyer TU Kaiserslautern Roland Meyer (TU KL) Applied Automata Theory (WiSe 2013) 1 / 161 Table of Contents I 1 Regular Languages and Finite Automata Regular Languages Finite
More informationComputer-Aided Program Design
Computer-Aided Program Design Spring 2015, Rice University Unit 3 Swarat Chaudhuri February 5, 2015 Temporal logic Propositional logic is a good language for describing properties of program states. However,
More informationWhen are Timed Automata Determinizable?
When are Timed Automata Determinizable? Christel Baier 1, Nathalie Bertrand 2, Patricia Bouyer 3, and Thomas Brihaye 4 1 Technische Universität Dresden, Germany 2 INRIA Rennes Bretagne Atlantique, France
More informationModel Checking of Safety Properties
Model Checking of Safety Properties Orna Kupferman Hebrew University Moshe Y. Vardi Rice University October 15, 2010 Abstract Of special interest in formal verification are safety properties, which assert
More informationAdvanced Automata Theory 7 Automatic Functions
Advanced Automata Theory 7 Automatic Functions Frank Stephan Department of Computer Science Department of Mathematics National University of Singapore fstephan@comp.nus.edu.sg Advanced Automata Theory
More informationStochastic Games with Time The value Min strategies Max strategies Determinacy Finite-state games Cont.-time Markov chains
Games with Time Finite-state Masaryk University Brno GASICS 00 /39 Outline Finite-state stochastic processes. Games over event-driven stochastic processes. Strategies,, determinacy. Existing results for
More informationTemporal logics and explicit-state model checking. Pierre Wolper Université de Liège
Temporal logics and explicit-state model checking Pierre Wolper Université de Liège 1 Topics to be covered Introducing explicit-state model checking Finite automata on infinite words Temporal Logics and
More informationBüchi Automata and Linear Temporal Logic
Büchi Automata and Linear Temporal Logic Joshua D. Guttman Worcester Polytechnic Institute 18 February 2010 Guttman ( WPI ) Büchi & LTL 18 Feb 10 1 / 10 Büchi Automata Definition A Büchi automaton is a
More informationLogic and Automata I. Wolfgang Thomas. EATCS School, Telc, July 2014
Logic and Automata I EATCS School, Telc, July 2014 The Plan We present automata theory as a tool to make logic effective. Four parts: 1. Some history 2. Automata on infinite words First step: MSO-logic
More informationBüchi Automata and Their Determinization
Büchi Automata and Their Determinization Edinburgh, October 215 Plan of the Day 1. Büchi automata and their determinization 2. Infinite games 3. Rabin s Tree Theorem 4. Decidability of monadic theories
More informationRepresenting Arithmetic Constraints with Finite Automata: An Overview
Representing Arithmetic Constraints with Finite Automata: An Overview Bernard Boigelot Pierre Wolper Université de Liège Motivation Linear numerical constraints are a very common and useful formalism (our
More informationMonadic Second Order Logic and Automata on Infinite Words: Büchi s Theorem
Monadic Second Order Logic and Automata on Infinite Words: Büchi s Theorem R. Dustin Wehr December 18, 2007 Büchi s theorem establishes the equivalence of the satisfiability relation for monadic second-order
More informationPSL Model Checking and Run-time Verification via Testers
PSL Model Checking and Run-time Verification via Testers Formal Methods 2006 Aleksandr Zaks and Amir Pnueli New York University Introduction Motivation (Why PSL?) A new property specification language,
More informationOn the Succinctness of Nondeterminizm
On the Succinctness of Nondeterminizm Benjamin Aminof and Orna Kupferman Hebrew University, School of Engineering and Computer Science, Jerusalem 91904, Israel Email: {benj,orna}@cs.huji.ac.il Abstract.
More informationThe theory of regular cost functions.
The theory of regular cost functions. Denis Kuperberg PhD under supervision of Thomas Colcombet Hebrew University of Jerusalem ERC Workshop on Quantitative Formal Methods Jerusalem, 10-05-2013 1 / 30 Introduction
More informationA Tight Lower Bound for Determinization of Transition Labeled Büchi Automata
A Tight Lower Bound for Determinization of Transition Labeled Büchi Automata Thomas Colcombet, Konrad Zdanowski CNRS JAF28, Fontainebleau June 18, 2009 Finite Automata A finite automaton is a tuple A =
More informationChapter Five: Nondeterministic Finite Automata
Chapter Five: Nondeterministic Finite Automata From DFA to NFA A DFA has exactly one transition from every state on every symbol in the alphabet. By relaxing this requirement we get a related but more
More informationAlan Bundy. Automated Reasoning LTL Model Checking
Automated Reasoning LTL Model Checking Alan Bundy Lecture 9, page 1 Introduction So far we have looked at theorem proving Powerful, especially where good sets of rewrite rules or decision procedures have
More informationThe Complexity of Computing the Behaviour of Lattice Automata on Infinite Trees
The Complexity of Computing the Behaviour of Lattice Automata on Infinite Trees Karsten Lehmann a, Rafael Peñaloza b a Optimisation Research Group, NICTA Artificial Intelligence Group, Australian National
More informationLecture Notes on Emptiness Checking, LTL Büchi Automata
15-414: Bug Catching: Automated Program Verification Lecture Notes on Emptiness Checking, LTL Büchi Automata Matt Fredrikson André Platzer Carnegie Mellon University Lecture 18 1 Introduction We ve seen
More informationAutomata: a short introduction
ILIAS, University of Luxembourg Discrete Mathematics II May 2012 What is a computer? Real computers are complicated; We abstract up to an essential model of computation; We begin with the simplest possible
More informationOn Recognizable Languages of Infinite Pictures
On Recognizable Languages of Infinite Pictures Equipe de Logique Mathématique CNRS and Université Paris 7 LIF, Marseille, Avril 2009 Pictures Pictures are two-dimensional words. Let Σ be a finite alphabet
More informationOn Recognizable Languages of Infinite Pictures
On Recognizable Languages of Infinite Pictures Equipe de Logique Mathématique CNRS and Université Paris 7 JAF 28, Fontainebleau, Juin 2009 Pictures Pictures are two-dimensional words. Let Σ be a finite
More informationRobust Controller Synthesis in Timed Automata
Robust Controller Synthesis in Timed Automata Ocan Sankur LSV, ENS Cachan & CNRS Joint with Patricia Bouyer, Nicolas Markey, Pierre-Alain Reynier. Ocan Sankur (ENS Cachan) Robust Control in Timed Automata
More informationEquivalence of DFAs and NFAs
CS 172: Computability and Complexity Equivalence of DFAs and NFAs It s a tie! DFA NFA Sanjit A. Seshia EECS, UC Berkeley Acknowledgments: L.von Ahn, L. Blum, M. Blum What we ll do today Prove that DFAs
More informationONR MURI AIRFOILS: Animal Inspired Robust Flight with Outer and Inner Loop Strategies. Calin Belta
ONR MURI AIRFOILS: Animal Inspired Robust Flight with Outer and Inner Loop Strategies Provable safety for animal inspired agile flight Calin Belta Hybrid and Networked Systems (HyNeSs) Lab Department of
More informationBoundedness Games. Séminaire de l équipe MoVe, LIF, Marseille, May 2nd, Nathanaël Fijalkow. Institute of Informatics, Warsaw University Poland
Boundedness Games Séminaire de l équipe MoVe, LIF, Marseille, May 2nd, 2013 Nathanaël Fijalkow Institute of Informatics, Warsaw University Poland LIAFA, Université Paris 7 Denis Diderot France (based on
More informationBoundedness Games. Séminaire du LIGM, April 16th, Nathanaël Fijalkow. Institute of Informatics, Warsaw University Poland
Boundedness Games Séminaire du LIGM, April 16th, 2013 Nathanaël Fijalkow Institute of Informatics, Warsaw University Poland LIAFA, Université Paris 7 Denis Diderot France (based on joint works with Krishnendu
More informationAutomata on linear orderings
Automata on linear orderings Véronique Bruyère Institut d Informatique Université de Mons-Hainaut Olivier Carton LIAFA Université Paris 7 September 25, 2006 Abstract We consider words indexed by linear
More informationWeak Alternating Automata Are Not That Weak
Weak Alternating Automata Are Not That Weak Orna Kupferman Hebrew University Moshe Y. Vardi Rice University Abstract Automata on infinite words are used for specification and verification of nonterminating
More informationComputational Models - Lecture 5 1
Computational Models - Lecture 5 1 Handout Mode Iftach Haitner and Yishay Mansour. Tel Aviv University. April 10/22, 2013 1 Based on frames by Benny Chor, Tel Aviv University, modifying frames by Maurice
More informationAutomata Theory (2A) Young Won Lim 5/31/18
Automata Theory (2A) Copyright (c) 2018 Young W. Lim. Permission is granted to copy, distribute and/or modify this document under the terms of the GNU Free Documentation License, Version 1.2 or any later
More informationWatson-Crick ω-automata. Elena Petre. Turku Centre for Computer Science. TUCS Technical Reports
Watson-Crick ω-automata Elena Petre Turku Centre for Computer Science TUCS Technical Reports No 475, December 2002 Watson-Crick ω-automata Elena Petre Department of Mathematics, University of Turku and
More informationOn language equations with one-sided concatenation
Fundamenta Informaticae 126 (2013) 1 34 1 IOS Press On language equations with one-sided concatenation Franz Baader Alexander Okhotin Abstract. Language equations are equations where both the constants
More informationIntroduction. Büchi Automata and Model Checking. Outline. Büchi Automata. The simplest computation model for infinite behaviors is the
Introduction Büchi Automata and Model Checking Yih-Kuen Tsay Department of Information Management National Taiwan University FLOLAC 2009 The simplest computation model for finite behaviors is the finite
More informationInf2A: Converting from NFAs to DFAs and Closure Properties
1/43 Inf2A: Converting from NFAs to DFAs and Stuart Anderson School of Informatics University of Edinburgh October 13, 2009 Starter Questions 2/43 1 Can you devise a way of testing for any FSM M whether
More informationDecidable and Expressive Classes of Probabilistic Automata
Decidable and Expressive Classes of Probabilistic Automata Yue Ben a, Rohit Chadha b, A. Prasad Sistla a, Mahesh Viswanathan c a University of Illinois at Chicago, USA b University of Missouri, USA c University
More informationNondeterministic Finite Automata
Nondeterministic Finite Automata Not A DFA Does not have exactly one transition from every state on every symbol: Two transitions from q 0 on a No transition from q 1 (on either a or b) Though not a DFA,
More informationAutomata-Theoretic LTL Model-Checking
Automata-Theoretic LTL Model-Checking Arie Gurfinkel arie@cmu.edu SEI/CMU Automata-Theoretic LTL Model-Checking p.1 LTL - Linear Time Logic (Pn 77) Determines Patterns on Infinite Traces Atomic Propositions
More informationCS 208: Automata Theory and Logic
CS 28: Automata Theory and Logic b a a start A x(la(x) y(x < y) L b (y)) B b Department of Computer Science and Engineering, Indian Institute of Technology Bombay of 32 Nondeterminism Alternation 2 of
More informationPlanning Under Uncertainty II
Planning Under Uncertainty II Intelligent Robotics 2014/15 Bruno Lacerda Announcement No class next Monday - 17/11/2014 2 Previous Lecture Approach to cope with uncertainty on outcome of actions Markov
More informationClasses of Polish spaces under effective Borel isomorphism
Classes of Polish spaces under effective Borel isomorphism Vassilis Gregoriades TU Darmstadt October 203, Vienna The motivation It is essential for the development of effective descriptive set theory to
More informationThe Pumping Lemma and Closure Properties
The Pumping Lemma and Closure Properties Mridul Aanjaneya Stanford University July 5, 2012 Mridul Aanjaneya Automata Theory 1/ 27 Tentative Schedule HW #1: Out (07/03), Due (07/11) HW #2: Out (07/10),
More informationCAP Plan, Activity, and Intent Recognition
CAP6938-02 Plan, Activity, and Intent Recognition Lecture 10: Sequential Decision-Making Under Uncertainty (part 1) MDPs and POMDPs Instructor: Dr. Gita Sukthankar Email: gitars@eecs.ucf.edu SP2-1 Reminder
More informationClick to edit. Master title. style
Query Learning of Derived ω-tree Languages in Polynomial Time Dana Angluin, Tımos Antonopoulos & Dana 1 Query Learning a set of possile concepts Question Answer tc Learner Teacher Tries to identify a target
More informationFrom Liveness to Promptness
From Liveness to Promptness Orna Kupferman Hebrew University Nir Piterman EPFL Moshe Y. Vardi Rice University Abstract Liveness temporal properties state that something good eventually happens, e.g., every
More informationLudwig Staiger Martin-Luther-Universität Halle-Wittenberg Hideki Yamasaki Hitotsubashi University
CDMTCS Research Report Series A Simple Example of an ω-language Topologically Inequivalent to a Regular One Ludwig Staiger Martin-Luther-Universität Halle-Wittenerg Hideki Yamasaki Hitotsuashi University
More informationOn the complexity of infinite computations
On the complexity of infinite computations Damian Niwiński, Warsaw University joint work with Igor Walukiewicz and Filip Murlak Newton Institute, Cambridge, June 2006 1 Infinite computations Büchi (1960)
More information2. Elements of the Theory of Computation, Lewis and Papadimitrou,
Introduction Finite Automata DFA, regular languages Nondeterminism, NFA, subset construction Regular Epressions Synta, Semantics Relationship to regular languages Properties of regular languages Pumping
More informationVerification of Probabilistic Systems with Faulty Communication
Verification of Probabilistic Systems with Faulty Communication P. A. Abdulla 1, N. Bertrand 2, A. Rabinovich 3, and Ph. Schnoebelen 2 1 Uppsala University, Sweden 2 LSV, ENS de Cachan, France 3 Tel Aviv
More informationMore on Regular Languages and Non-Regular Languages
More on Regular Languages and Non-Regular Languages CSCE A35 Decision Properties of Regular Languages Given a (representation, e.g., RE, FA, of a) regular language L, what can we tell about L? Since there
More informationFinite Automata and Regular languages
Finite Automata and Regular languages Huan Long Shanghai Jiao Tong University Acknowledgements Part of the slides comes from a similar course in Fudan University given by Prof. Yijia Chen. http://basics.sjtu.edu.cn/
More informationUndecidability Results for Timed Automata with Silent Transitions
Fundamenta Informaticae XXI (2001) 1001 1025 1001 IOS Press Undecidability Results for Timed Automata with Silent Transitions Patricia Bouyer LSV, ENS Cachan, CNRS, France bouyer@lsv.ens-cachan.fr Serge
More informationFORMAL LANGUAGES, AUTOMATA AND COMPUTABILITY
5-453 FORMAL LANGUAGES, AUTOMATA AND COMPUTABILITY NON-DETERMINISM and REGULAR OPERATIONS THURSDAY JAN 6 UNION THEOREM The union of two regular languages is also a regular language Regular Languages Are
More informationCMPSCI 250: Introduction to Computation. Lecture #22: From λ-nfa s to NFA s to DFA s David Mix Barrington 22 April 2013
CMPSCI 250: Introduction to Computation Lecture #22: From λ-nfa s to NFA s to DFA s David Mix Barrington 22 April 2013 λ-nfa s to NFA s to DFA s Reviewing the Three Models and Kleene s Theorem The Subset
More informationExpressiveness and decidability of ATL with strategy contexts
Expressiveness and decidability of ATL with strategy contexts Arnaud Da Costa, François Laroussinie, Nicolas Markey July 2010 Research report LSV-10-14 Laboratoire Spécification & Vérification École Normale
More informationName: Student ID: Instructions:
Instructions: Name: CSE 322 Autumn 2001: Midterm Exam (closed book, closed notes except for 1-page summary) Total: 100 points, 5 questions, 20 points each. Time: 50 minutes 1. Write your name and student
More informationUndecidability of the Post Correspondence Problem in Coq
Undecidaility of the Post Correspondence Prolem in Coq Bachelor Talk Edith Heiter Advisors: Prof. Dr. Gert Smolka, Yannick Forster August 23, 2017 PCP and Undecidaility SR to MPCP Turing Machines Reach
More informationEfficient minimization of deterministic weak ω-automata
Information Processing Letters 79 (2001) 105 109 Efficient minimization of deterministic weak ω-automata Christof Löding Lehrstuhl Informatik VII, RWTH Aachen, 52056 Aachen, Germany Received 26 April 2000;
More informationVariable Automata over Infinite Alphabets
Variable Automata over Infinite Alphabets Orna Grumberg a, Orna Kupferman b, Sarai Sheinvald b a Department of Computer Science, The Technion, Haifa 32000, Israel b School of Computer Science and Engineering,
More informationChapter 13: Model Checking Linear-Time Properties of Probabilistic Systems
Chapter 13: Model Checking Linear-Time Properties of Probabilistic Systems Christel Baier, Marcus Größer, and Frank Ciesinski Technische Universität Dresden, Fakultät Informatik, Institut für Theoretische
More informationA Enforceable Security Policies Revisited
A Enforceable Security Policies Revisited DAVID BASIN, ETH Zurich VINCENT JUGÉ, MINES ParisTech FELIX KLAEDTKE, ETH Zurich EUGEN ZĂLINESCU, ETH Zurich We revisit Schneider s work on policy enforcement
More informationRabin Theory and Game Automata An Introduction
Rabin Theory and Game Automata An Introduction Ting Zhang Stanford University November 2002 Logic Seminar 1 Outline 1. Monadic second-order theory of two successors (S2S) 2. Rabin Automata 3. Game Automata
More information