Abstract
Real-Time Calculus (RTC) is a framework for modeling and performance analysis of real-time networked systems. In RTC, workload and resources are modeled as arrival and service curves, and processing semantics are modeled by abstract components. Greedy Processing Component (GPC) is one of the fundamental abstract components in RTC, which processes incoming events in a greedy fashion as long as there are available resources. The relations between inputs and outputs of GPC have been established, which are consistent with its behaviors. In this paper, we first revise the original proof of calculating output curves in GPC, and then propose a new method to obtain tighter output arrival curves. Experiment results show that the precision of output arrival curves can be improved by our method compared with the original calculation and existing work.
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- 1.
\(R[s,t) = - R[t,s), R[s,s) = 0\).
- 2.
\(C[s,t) = - C[t,s), C[s,s) = 0\).
- 3.
For ease of presentation we assume s, t, a, b, p to be integer in following proofs.
- 4.
This part is just briefly explained as \('a \ge b\) since \(t \ge s'\) in the existing proof [4].
- 5.
Note that this is not applicable to all task sets.
- 6.
Note that p and c are relatively small since larger values will cause computation exception with larger-scale GPC networks.
- 7.
This is not detailed in [4].
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Appendix : Proof of Theorem 2
Appendix : Proof of Theorem 2
(1) We first prove \(\alpha '^u\). Suppose p is an arbitrarily small time such that the backlog satisfies \(B(p) = 0\).
Then for all \(p \le s \le t\),
Since \(C[p,p) = R[p,p) = C[p,p) - R[p,p) = 0\), the suprema are nonnegative and we have
Let \(\chi = \sup \limits _{p \le b \le s}\{min\{\inf \limits _{b \le a \le t}\{ C[a,b) - R[a,b)\}, \inf \limits _{p \le a \le b}\{ C[a,b) - R[a,b)\}\}\}\),
\(\chi _1(b) = \inf \limits _{b \le a \le t}\{C[a,b) - R[a,b)\} = min\{C[b, b) -R[b, b), C[b + 1, b) -R[b+ 1, b ), ..., C[t, b) -R[t, b) \} \le 0\),
\(\chi _2(b) = \inf \limits _{p \le a \le b}\{C[a,b) - R[a,b)\} = min\{C[p, b) -R[p, b), C[p + 1, b) -R[p + 1, b), ..., C[b -1, b) -R[b - 1, b), C[b, b) -R[b, b)\} \le 0\).
Next we prove \(\chi = \sup \limits _{p \le b \le s} \{\chi _1(b)\}\)Footnote 7.
We consider two cases:
-
(1)
For any \(i \in [p, s]\), \(\chi _1(i) \le \chi _2(i)\), then \(\chi = \sup \limits _{p \le b \le s} \{\chi _1(b)\}\).
-
(2)
There exists at least one \(i \in [p, s]\) satisfying \(\chi _1(i) > \chi _2(i)\), then \( min \{\chi _1(i), \chi _2(i)\} = \chi _2(i) < 0\),
Similar as the proof for \(\beta '^l\), there exists \(x \in [p, s]\) such that \(\min \{\chi _1(x),\) \(\chi _2(x)\} = \chi _1(x) = \chi _2(x) = 0\).
Then
where \(\psi \) is the set of values in [p, s] which satisfy for any \(b \in \phi \), \(\chi _1(b) \le \chi _2(b)\).
On the other hand, \(\sup \limits _{p \le b \le s}\{\chi _1(b)\} = \sup \limits _{ b \in \psi }\{\chi _1(b)\}\), since when \(b \in ([p,s] - \psi )\), \(\chi _1(b) < 0\). Then we have \(\chi = \sup \limits _{p \le b \le s}\{\chi _1(b)\}\).
So in both two cases we have \(\chi = \sup \limits _{p \le b \le s}\{\chi _1(b)\}\).
Then
Then with \(\lambda = s - b\) and \(\mu = a + \lambda -s\), we have
Since the number of processed events can not be larger than the available resource, \(R'[s,t) \le \beta ^u(t - s)\), then we have \(R'[s,t) \le \min ( (\alpha ^u \otimes \beta ^u) \oslash \beta ^l , \beta ^u)\).
(2) The results for \(\alpha '^l\) can be proved as with a combination of \(\beta '^u\) and \(\alpha '^u\) .
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Tang, Y., Jiang, Y., Guan, N. (2019). Improving the Analysis of GPC in Real-Time Calculus. In: Guan, N., Katoen, JP., Sun, J. (eds) Dependable Software Engineering. Theories, Tools, and Applications. SETTA 2019. Lecture Notes in Computer Science(), vol 11951. Springer, Cham. https://doi.org/10.1007/978-3-030-35540-1_7
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