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Technologies for finding errors in object-oriented software K. Rustan M. Leino Microsoft Research, Redmond, WA Lecture 1 Summer school on Formal Models of Software 2 Sep 2003, Tunis, Tunisia

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Review: Tool architecture Source program Verification condition Counterexample context Warning messages Automatic theorem prover Post processor Sugared command Primitive command Passive command Translator Focus today

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Commands and their possible outcomes Normal termination – terminates normally in some state Erroneous termination – goes wrong, crashes the computer Non-termination – diverges, fails to terminates, results in infinite recursion Miraculous termination – fails to start, blocks (partial/miraculous commands) you breach contract, demon wins demon breaches contract, you win!

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Commands C::=w := E |assert P |assume P |var w in C end |C 0 ; C 1 |C 0 [] C 1

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Semantics Hoare logic – {P} C {R} says that if command C is started in (a state satisfying) P, then: C does not go wrong, and if C terminates normally, then it terminates in (a state satisfying) R Weakest preconditions – for a given C and R, the weakest P satisfying {P} C {R} – written wp(C, R) or simply C.R

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Command semantics assignment evaluate E and change value of w to E (w := E).R R[w := E] (x := x + 1).(x 10)x+1 10x < 10 (x := 15).(x 10)15 10false (y := x + 3*y).(x 10) x 10 (x,y := y,x).(x < y)y < x replace w by E in R

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Command semantics assert if P holds, do nothing, else go wrong (assert P).R P R (assert x < 10).(0 x)0 x < 10 (assert x = y*y).(0 x)x = y*y 0 xx = y*y (assert false).(x 10)false logical AND, conjunction

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Command semantics assume logical implication logical NOT, negation logical OR, disjunction if P holds, do nothing, else block (assume P).R P R P R (assume x < 10).(0 x)10 x 0 x0 x (assume x = y*y).(0 x)x = y*y 0 xtrue (assume false).(x 10)true

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introduce w with an arbitrary initial value, then do C (var w in C end).R (w C.R) (var y in y := x end).(0 x)(y (y := x).(0 x))(y 0 x)0 x (var y in x := y end).(0 x)(y (x := y).(0 x))(y 0 y)false Command semantics local variable provided w does not occur free in R

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do C 0, then C 1 (C 0 ; C 1 ).R C 0.(C 1.R) (x := x+1 ; assert x y).(0 < x)(x := x+1).( (assert x y).(0 < x) )(x := x+1).(0 < x y) 0 < x+1 y0 x < y (assume 0 y+z ; x := y).(0 x)(assume 0 y+z).( (x:=y).(0 x) )(assume 0 y+z).(0 y)0 y+z 0 y-y z -y 00 z Command semantics sequential composition

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do either C 0 or C 1 (the demon chooses which) (C 0 [] C 1 ).R C 0.R C 1.R (x := x+1 [] x := x + 2).(x 10)(x := x+1). (x 10) (x := x+2).(x 10)x 9 x 8 x 8 (assume false [] x := y).(0 x)(assume false).(0 x) (x:=y).(0 x)true 0 y0 y Command semantics choice composition

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Convenient shorthands skip = assert true = assume true wrong = assert false magic = assume false P C = assume P; C if P then C 0 else C 1 end = P C 0 [] P C 1 havoc w = var win w := wend

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Change such that change w such that P = havoc w ; assume P change x such that y = x+1havoc x ; assume y = x+1x := y-1 change x such that y < xx := y+1 [] x := y+2 [] … change x such that x = x+1havoc x ; assume falsemagic change r such that r*r = yy < 0 magic []0 y r := y []0 y r := -y

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Specification statement w:[P, Q] =requires P modifies w ensures Q =assert P ; var w 0 in w 0 := w ; change w such that Q end x:[true, x 0 =x+1]x := x-1 r:[0 y, r*r = y]assert 0 y ; (r := y [] r := -y) x:[0 x, x 2 x 0 < (x+1) 2 ] ? x,y,z,n:[1xy1z2n, x n +y n =z n ] ?

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Variables with internal structure: maps x := a[i] = x := select(a, i) a[i] := E = a := store(a, i, E) where (m,i,j,v i j select(store(m, i, v), i) = v select(store(m, i, v), j) = select(m, j))

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Example: maps (a[5] := 12 ; a[7] := 14 ; x := a[5]).(x=12) =(a[5] := 12 ; a[7] := 14).(select(a, 5) = 12) =(a[5] := 12).(select(store(a, 7, 14), 5) = 12) =select(store(store(a, 5, 12), 7, 14), 5) = 12 ={ select/store axiom, since 7 5 } select(store(a, 5, 12), 5) = 12 ={ select/store axiom, since 5 = 5 } 12 = 12 =true

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Refinement B C = (R B.R C.R ) change x such that y < x x := y+4 assert x < 10 skip skip assume x < 10 wrong C C magic command B is refined by command C C is better than B anyone who requests B would be happy with C

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Compositions are monotonic with respect to refinement if B C then: – var w in B end var w in C end – A;B A;C – B;D C;D – A [] B A [] C var x in... change x such that y < x... end var x in... x := y+4... end

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Commands form a lattice Commands form a semi-lattice under ordering, with meet operation [], top element magic, and bottom element wrong A lattice theorem: B C 0 B C 1 B C 0 [] C 1 Corollary: C 0 [] C 1 C 0

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Example application of lattice theorem Let B = x:[true, x = |x 0 | ]. Then: B assume 0 x = C 0 B assume x 0 ; x := -x = C 1 B assume x = -3 ; x := 3 = C 2 B magic = C 3 Therefore: B C 0 [] C 1 [] C 2 [] C 3

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Procedures proc P(x,y,z) returns (r,s,t) spec S call to P: a,b,c := P(E 0, E 1, E 2 ) = var x,y,z,r,s,t in x := E 0 ; y := E 1 ; z := E 2 ; S ; a,b,c := r,s,t end

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Example: procedure proc Add(x) returns (r) specrequires 0 x modifies k ensures k = k 0 +x r = k 0 a := Add(k+25) = var x,r in x := k+25 ; k:[0 x, k = k 0 +x r = k 0 ] ; a := r end

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Procedure implementations proc P(x,y,z) returns (r,s,t) spec S impl P(x,y,z) returns (r,s,t) is C Proof obligation: S C Let C 0,..., C m- 1 be the declared implementations of P. Then, the language implementation of a call to P can replace S by: C 0 []... [] C m- 1

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Exercise Redefine (in terms of the commands we've seen) the specification statement so that the postcondition mentions x,x instead of x 0,x Example: – old form: x:[0 x, x*x x 0 < (x+1)*(x+1)] – new form: x:[0 x, x*x x < (x+1)*(x+1)]

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Exercise Define while {inv J} B do w: S end where: – B is the loop guard – S is the loop body – J is the loop invariant – w is the list of assignment targets in S in terms of the commands we've seen.

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Loop (answer to exercise) while {inv J} B do w: S end = assert J ; change w such that J ; if B then S ; assert J ; magic else skip end

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Summary Language is built up from 6 primitive commands Semantics can be given by weakest preconditions Partial (miraculous) commands are important and very useful select/store handle map variables Procedures are names for specifications Procedure implementations are hints for compiler

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Specifying and verifying programs in Spec# K. Rustan M. Leino Microsoft Research, Redmond, WA, USA Invited talk, PSI 2006 Novosibirsk, Russia 27 June 2006.

Specifying and verifying programs in Spec# K. Rustan M. Leino Microsoft Research, Redmond, WA, USA Invited talk, PSI 2006 Novosibirsk, Russia 27 June 2006.

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