Download Security and Trust Management: 8th International Workshop, by Peter Drábik, Fabio Martinelli, Charles Morisset (auth.), PDF

By Peter Drábik, Fabio Martinelli, Charles Morisset (auth.), Audun Jøsang, Pierangela Samarati, Marinella Petrocchi (eds.)

This publication constitutes the completely refereed post-conference court cases of the eighth foreign Workshop on defense and belief administration, STM 2012, held in Pisa, Italy, in September 2012 - along side the seventeenth ecu Symposium study in desktop protection (ESORICS 2012). The 20 revised complete papers have been conscientiously reviewed and chosen from fifty seven submissions. The papers are equipped into topical sections on coverage enforcement and tracking; entry keep an eye on; belief, recognition, and privateness; allotted platforms and actual protection; authentication and safety policies.

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Extra info for Security and Trust Management: 8th International Workshop, STM 2012, Pisa, Italy, September 13-14, 2012, Revised Selected Papers

Sample text

These two sets account for the fact that, depending on the observations scheduled by the controller, any action performed by the target can be either observed or not. , discrete or continuous) underlying the target by T. We define a lazy controller as follows. Definition 4. A lazy controller is a tuple (C, S, Σ, (T, ≤), =⇒, − →lctr , ζ) where: – =⇒ ⊆ (T × C × S) × (Σ ∪ {·}) × (T × C × S) is the active monitoring relation; – − →lctr ⊆ C × Σ × C is the update relation for unseen actions; – ζ : C × T → T is the scheduling function; As we discussed in Section 2, the relation =⇒ characterizes the input timed security controller.

Thus, the behavior of an I/O automaton is prefix-closed : any prefix of an execution exhibited by an automaton is also an execution of that automaton. Definition 4 A schedule module Pˆ is prefix closed if and only if: ∀s1 ∈ Σ ∞ : s1 ∈ scheds(Pˆ ) ⇒ ∀s2 ∈ Σ : s2 s1 : s2 ∈ scheds(Pˆ ) . These two characteristics are unsurprising from the standpoint of models for distributed computation, but describe practically relevant details typically absent from models of run-time enforcement. , that all actions can be mediated, takes a more nuanced view, which admits that some aspects of enforcement are outside the monitor’s control, such as scheduling strategies for security-relevant actions that cannot be mediated.

Q, σ, q ) ∈ δ. t. L(det(A)) = L(A). Given two FSMs A and D = det(A), there always exists a mapping μ : QA → P(QD ) which relates each state of A with a set of states of D. Note that det(A) denotes one of the possible deterministic FSMs equivalent to A. We assume that, if A is deterministic, then det(A) = A. We also recall the definition of the parallel composition of FSMs. Let A = (Σ, QA , ιA , δA , FA ) and B = (Σ, QB , ιB , δB , FB ) be two FSMs, using the same alphabet Σ. The parallel composition of A and B is defined as A B = (Σ, QA × QB , (ιA , ιB ), δA B , FA B ), where δA B = {((q1 , q2 ), σ, (q1 , q2 )) | (q1 , σ, q1 ) ∈ δA , (q2 , σ, q2 ) ∈ δB }, and FA B = {(q1 , q2 ) | q1 ∈ FA ∧ q2 ∈ FB }.

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